OpenCloudOS-Kernel/fs/xfs/xfs_buf_item.c

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// SPDX-License-Identifier: GPL-2.0
/*
* Copyright (c) 2000-2005 Silicon Graphics, Inc.
* All Rights Reserved.
*/
#include "xfs.h"
#include "xfs_fs.h"
#include "xfs_shared.h"
#include "xfs_format.h"
#include "xfs_log_format.h"
#include "xfs_trans_resv.h"
#include "xfs_bit.h"
#include "xfs_mount.h"
#include "xfs_trans.h"
#include "xfs_trans_priv.h"
#include "xfs_buf_item.h"
#include "xfs_inode.h"
#include "xfs_inode_item.h"
#include "xfs_quota.h"
#include "xfs_dquot_item.h"
#include "xfs_dquot.h"
xfs: event tracing support Convert the old xfs tracing support that could only be used with the out of tree kdb and xfsidbg patches to use the generic event tracer. To use it make sure CONFIG_EVENT_TRACING is enabled and then enable all xfs trace channels by: echo 1 > /sys/kernel/debug/tracing/events/xfs/enable or alternatively enable single events by just doing the same in one event subdirectory, e.g. echo 1 > /sys/kernel/debug/tracing/events/xfs/xfs_ihold/enable or set more complex filters, etc. In Documentation/trace/events.txt all this is desctribed in more detail. To reads the events do a cat /sys/kernel/debug/tracing/trace Compared to the last posting this patch converts the tracing mostly to the one tracepoint per callsite model that other users of the new tracing facility also employ. This allows a very fine-grained control of the tracing, a cleaner output of the traces and also enables the perf tool to use each tracepoint as a virtual performance counter, allowing us to e.g. count how often certain workloads git various spots in XFS. Take a look at http://lwn.net/Articles/346470/ for some examples. Also the btree tracing isn't included at all yet, as it will require additional core tracing features not in mainline yet, I plan to deliver it later. And the really nice thing about this patch is that it actually removes many lines of code while adding this nice functionality: fs/xfs/Makefile | 8 fs/xfs/linux-2.6/xfs_acl.c | 1 fs/xfs/linux-2.6/xfs_aops.c | 52 - fs/xfs/linux-2.6/xfs_aops.h | 2 fs/xfs/linux-2.6/xfs_buf.c | 117 +-- fs/xfs/linux-2.6/xfs_buf.h | 33 fs/xfs/linux-2.6/xfs_fs_subr.c | 3 fs/xfs/linux-2.6/xfs_ioctl.c | 1 fs/xfs/linux-2.6/xfs_ioctl32.c | 1 fs/xfs/linux-2.6/xfs_iops.c | 1 fs/xfs/linux-2.6/xfs_linux.h | 1 fs/xfs/linux-2.6/xfs_lrw.c | 87 -- fs/xfs/linux-2.6/xfs_lrw.h | 45 - fs/xfs/linux-2.6/xfs_super.c | 104 --- fs/xfs/linux-2.6/xfs_super.h | 7 fs/xfs/linux-2.6/xfs_sync.c | 1 fs/xfs/linux-2.6/xfs_trace.c | 75 ++ fs/xfs/linux-2.6/xfs_trace.h | 1369 +++++++++++++++++++++++++++++++++++++++++ fs/xfs/linux-2.6/xfs_vnode.h | 4 fs/xfs/quota/xfs_dquot.c | 110 --- fs/xfs/quota/xfs_dquot.h | 21 fs/xfs/quota/xfs_qm.c | 40 - fs/xfs/quota/xfs_qm_syscalls.c | 4 fs/xfs/support/ktrace.c | 323 --------- fs/xfs/support/ktrace.h | 85 -- fs/xfs/xfs.h | 16 fs/xfs/xfs_ag.h | 14 fs/xfs/xfs_alloc.c | 230 +----- fs/xfs/xfs_alloc.h | 27 fs/xfs/xfs_alloc_btree.c | 1 fs/xfs/xfs_attr.c | 107 --- fs/xfs/xfs_attr.h | 10 fs/xfs/xfs_attr_leaf.c | 14 fs/xfs/xfs_attr_sf.h | 40 - fs/xfs/xfs_bmap.c | 507 +++------------ fs/xfs/xfs_bmap.h | 49 - fs/xfs/xfs_bmap_btree.c | 6 fs/xfs/xfs_btree.c | 5 fs/xfs/xfs_btree_trace.h | 17 fs/xfs/xfs_buf_item.c | 87 -- fs/xfs/xfs_buf_item.h | 20 fs/xfs/xfs_da_btree.c | 3 fs/xfs/xfs_da_btree.h | 7 fs/xfs/xfs_dfrag.c | 2 fs/xfs/xfs_dir2.c | 8 fs/xfs/xfs_dir2_block.c | 20 fs/xfs/xfs_dir2_leaf.c | 21 fs/xfs/xfs_dir2_node.c | 27 fs/xfs/xfs_dir2_sf.c | 26 fs/xfs/xfs_dir2_trace.c | 216 ------ fs/xfs/xfs_dir2_trace.h | 72 -- fs/xfs/xfs_filestream.c | 8 fs/xfs/xfs_fsops.c | 2 fs/xfs/xfs_iget.c | 111 --- fs/xfs/xfs_inode.c | 67 -- fs/xfs/xfs_inode.h | 76 -- fs/xfs/xfs_inode_item.c | 5 fs/xfs/xfs_iomap.c | 85 -- fs/xfs/xfs_iomap.h | 8 fs/xfs/xfs_log.c | 181 +---- fs/xfs/xfs_log_priv.h | 20 fs/xfs/xfs_log_recover.c | 1 fs/xfs/xfs_mount.c | 2 fs/xfs/xfs_quota.h | 8 fs/xfs/xfs_rename.c | 1 fs/xfs/xfs_rtalloc.c | 1 fs/xfs/xfs_rw.c | 3 fs/xfs/xfs_trans.h | 47 + fs/xfs/xfs_trans_buf.c | 62 - fs/xfs/xfs_vnodeops.c | 8 70 files changed, 2151 insertions(+), 2592 deletions(-) Signed-off-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Alex Elder <aelder@sgi.com>
2009-12-15 07:14:59 +08:00
#include "xfs_trace.h"
#include "xfs_log.h"
#include "xfs_log_priv.h"
struct kmem_cache *xfs_buf_item_cache;
static inline struct xfs_buf_log_item *BUF_ITEM(struct xfs_log_item *lip)
{
return container_of(lip, struct xfs_buf_log_item, bli_item);
}
/* Is this log iovec plausibly large enough to contain the buffer log format? */
bool
xfs_buf_log_check_iovec(
struct xfs_log_iovec *iovec)
{
struct xfs_buf_log_format *blfp = iovec->i_addr;
char *bmp_end;
char *item_end;
if (offsetof(struct xfs_buf_log_format, blf_data_map) > iovec->i_len)
return false;
item_end = (char *)iovec->i_addr + iovec->i_len;
bmp_end = (char *)&blfp->blf_data_map[blfp->blf_map_size];
return bmp_end <= item_end;
}
static inline int
xfs_buf_log_format_size(
struct xfs_buf_log_format *blfp)
{
return offsetof(struct xfs_buf_log_format, blf_data_map) +
(blfp->blf_map_size * sizeof(blfp->blf_data_map[0]));
}
static inline bool
xfs_buf_item_straddle(
struct xfs_buf *bp,
uint offset,
xfs: optimise xfs_buf_item_size/format for contiguous regions We process the buf_log_item bitmap one set bit at a time with xfs_next_bit() so we can detect if a region crosses a memcpy discontinuity in the buffer data address. This has massive overhead on large buffers (e.g. 64k directory blocks) because we do a lot of unnecessary checks and xfs_buf_offset() calls. For example, 16-way concurrent create workload on debug kernel running CPU bound has this at the top of the profile at ~120k create/s on 64kb directory block size: 20.66% [kernel] [k] xfs_dir3_leaf_check_int 7.10% [kernel] [k] memcpy 6.22% [kernel] [k] xfs_next_bit 3.55% [kernel] [k] xfs_buf_offset 3.53% [kernel] [k] xfs_buf_item_format 3.34% [kernel] [k] __pv_queued_spin_lock_slowpath 3.04% [kernel] [k] do_raw_spin_lock 2.84% [kernel] [k] xfs_buf_item_size_segment.isra.0 2.31% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.36% [kernel] [k] xfs_log_commit_cil (debug checks hurt large blocks) The only buffers with discontinuities in the data address are unmapped buffers, and they are only used for inode cluster buffers and only for logging unlinked pointers. IOWs, it is -rare- that we even need to detect a discontinuity in the buffer item formatting code. Optimise all this by using xfs_contig_bits() to find the size of the contiguous regions, then test for a discontiunity inside it. If we find one, do the slow "bit at a time" method we do now. If we don't, then just copy the entire contiguous range in one go. Profile now looks like: 25.26% [kernel] [k] xfs_dir3_leaf_check_int 9.25% [kernel] [k] memcpy 5.01% [kernel] [k] __pv_queued_spin_lock_slowpath 2.84% [kernel] [k] do_raw_spin_lock 2.22% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.88% [kernel] [k] xfs_buf_find 1.53% [kernel] [k] memmove 1.47% [kernel] [k] xfs_log_commit_cil .... 0.34% [kernel] [k] xfs_buf_item_format .... 0.21% [kernel] [k] xfs_buf_offset .... 0.16% [kernel] [k] xfs_contig_bits .... 0.13% [kernel] [k] xfs_buf_item_size_segment.isra.0 So the bit scanning over for the dirty region tracking for the buffer log items is basically gone. Debug overhead hurts even more now... Perf comparison dir block creates unlink size (kb) time rate time Original 4 4m08s 220k 5m13s Original 64 7m21s 115k 13m25s Patched 4 3m59s 230k 5m03s Patched 64 6m23s 143k 12m33s Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-03-23 00:52:04 +08:00
int first_bit,
int nbits)
{
xfs: optimise xfs_buf_item_size/format for contiguous regions We process the buf_log_item bitmap one set bit at a time with xfs_next_bit() so we can detect if a region crosses a memcpy discontinuity in the buffer data address. This has massive overhead on large buffers (e.g. 64k directory blocks) because we do a lot of unnecessary checks and xfs_buf_offset() calls. For example, 16-way concurrent create workload on debug kernel running CPU bound has this at the top of the profile at ~120k create/s on 64kb directory block size: 20.66% [kernel] [k] xfs_dir3_leaf_check_int 7.10% [kernel] [k] memcpy 6.22% [kernel] [k] xfs_next_bit 3.55% [kernel] [k] xfs_buf_offset 3.53% [kernel] [k] xfs_buf_item_format 3.34% [kernel] [k] __pv_queued_spin_lock_slowpath 3.04% [kernel] [k] do_raw_spin_lock 2.84% [kernel] [k] xfs_buf_item_size_segment.isra.0 2.31% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.36% [kernel] [k] xfs_log_commit_cil (debug checks hurt large blocks) The only buffers with discontinuities in the data address are unmapped buffers, and they are only used for inode cluster buffers and only for logging unlinked pointers. IOWs, it is -rare- that we even need to detect a discontinuity in the buffer item formatting code. Optimise all this by using xfs_contig_bits() to find the size of the contiguous regions, then test for a discontiunity inside it. If we find one, do the slow "bit at a time" method we do now. If we don't, then just copy the entire contiguous range in one go. Profile now looks like: 25.26% [kernel] [k] xfs_dir3_leaf_check_int 9.25% [kernel] [k] memcpy 5.01% [kernel] [k] __pv_queued_spin_lock_slowpath 2.84% [kernel] [k] do_raw_spin_lock 2.22% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.88% [kernel] [k] xfs_buf_find 1.53% [kernel] [k] memmove 1.47% [kernel] [k] xfs_log_commit_cil .... 0.34% [kernel] [k] xfs_buf_item_format .... 0.21% [kernel] [k] xfs_buf_offset .... 0.16% [kernel] [k] xfs_contig_bits .... 0.13% [kernel] [k] xfs_buf_item_size_segment.isra.0 So the bit scanning over for the dirty region tracking for the buffer log items is basically gone. Debug overhead hurts even more now... Perf comparison dir block creates unlink size (kb) time rate time Original 4 4m08s 220k 5m13s Original 64 7m21s 115k 13m25s Patched 4 3m59s 230k 5m03s Patched 64 6m23s 143k 12m33s Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-03-23 00:52:04 +08:00
void *first, *last;
first = xfs_buf_offset(bp, offset + (first_bit << XFS_BLF_SHIFT));
last = xfs_buf_offset(bp,
offset + ((first_bit + nbits) << XFS_BLF_SHIFT));
if (last - first != nbits * XFS_BLF_CHUNK)
return true;
return false;
}
/*
xfs: Fix CIL throttle hang when CIL space used going backwards A hang with tasks stuck on the CIL hard throttle was reported and largely diagnosed by Donald Buczek, who discovered that it was a result of the CIL context space usage decrementing in committed transactions once the hard throttle limit had been hit and processes were already blocked. This resulted in the CIL push not waking up those waiters because the CIL context was no longer over the hard throttle limit. The surprising aspect of this was the CIL space usage going backwards regularly enough to trigger this situation. Assumptions had been made in design that the relogging process would only increase the size of the objects in the CIL, and so that space would only increase. This change and commit message fixes the issue and documents the result of an audit of the triggers that can cause the CIL space to go backwards, how large the backwards steps tend to be, the frequency in which they occur, and what the impact on the CIL accounting code is. Even though the CIL ctx->space_used can go backwards, it will only do so if the log item is already logged to the CIL and contains a space reservation for it's entire logged state. This is tracked by the shadow buffer state on the log item. If the item is not previously logged in the CIL it has no shadow buffer nor log vector, and hence the entire size of the logged item copied to the log vector is accounted to the CIL space usage. i.e. it will always go up in this case. If the item has a log vector (i.e. already in the CIL) and the size decreases, then the existing log vector will be overwritten and the space usage will go down. This is the only condition where the space usage reduces, and it can only occur when an item is already tracked in the CIL. Hence we are safe from CIL space usage underruns as a result of log items decreasing in size when they are relogged. Typically this reduction in CIL usage occurs from metadata blocks being free, such as when a btree block merge occurs or a directory enter/xattr entry is removed and the da-tree is reduced in size. This generally results in a reduction in size of around a single block in the CIL, but also tends to increase the number of log vectors because the parent and sibling nodes in the tree needs to be updated when a btree block is removed. If a multi-level merge occurs, then we see reduction in size of 2+ blocks, but again the log vector count goes up. The other vector is inode fork size changes, which only log the current size of the fork and ignore the previously logged size when the fork is relogged. Hence if we are removing items from the inode fork (dir/xattr removal in shortform, extent record removal in extent form, etc) the relogged size of the inode for can decrease. No other log items can decrease in size either because they are a fixed size (e.g. dquots) or they cannot be relogged (e.g. relogging an intent actually creates a new intent log item and doesn't relog the old item at all.) Hence the only two vectors for CIL context size reduction are relogging inode forks and marking buffers active in the CIL as stale. Long story short: the majority of the code does the right thing and handles the reduction in log item size correctly, and only the CIL hard throttle implementation is problematic and needs fixing. This patch makes that fix, as well as adds comments in the log item code that result in items shrinking in size when they are relogged as a clear reminder that this can and does happen frequently. The throttle fix is based upon the change Donald proposed, though it goes further to ensure that once the throttle is activated, it captures all tasks until the CIL push issues a wakeup, regardless of whether the CIL space used has gone back under the throttle threshold. This ensures that we prevent tasks reducing the CIL slightly under the throttle threshold and then making more changes that push it well over the throttle limit. This is acheived by checking if the throttle wait queue is already active as a condition of throttling. Hence once we start throttling, we continue to apply the throttle until the CIL context push wakes everything on the wait queue. We can use waitqueue_active() for the waitqueue manipulations and checks as they are all done under the ctx->xc_push_lock. Hence the waitqueue has external serialisation and we can safely peek inside the wait queue without holding the internal waitqueue locks. Many thanks to Donald for his diagnostic and analysis work to isolate the cause of this hang. Reported-and-tested-by: Donald Buczek <buczek@molgen.mpg.de> Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Chandan Babu R <chandanrlinux@gmail.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Allison Henderson <allison.henderson@oracle.com> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-06-18 23:21:51 +08:00
* Return the number of log iovecs and space needed to log the given buf log
* item segment.
*
xfs: Fix CIL throttle hang when CIL space used going backwards A hang with tasks stuck on the CIL hard throttle was reported and largely diagnosed by Donald Buczek, who discovered that it was a result of the CIL context space usage decrementing in committed transactions once the hard throttle limit had been hit and processes were already blocked. This resulted in the CIL push not waking up those waiters because the CIL context was no longer over the hard throttle limit. The surprising aspect of this was the CIL space usage going backwards regularly enough to trigger this situation. Assumptions had been made in design that the relogging process would only increase the size of the objects in the CIL, and so that space would only increase. This change and commit message fixes the issue and documents the result of an audit of the triggers that can cause the CIL space to go backwards, how large the backwards steps tend to be, the frequency in which they occur, and what the impact on the CIL accounting code is. Even though the CIL ctx->space_used can go backwards, it will only do so if the log item is already logged to the CIL and contains a space reservation for it's entire logged state. This is tracked by the shadow buffer state on the log item. If the item is not previously logged in the CIL it has no shadow buffer nor log vector, and hence the entire size of the logged item copied to the log vector is accounted to the CIL space usage. i.e. it will always go up in this case. If the item has a log vector (i.e. already in the CIL) and the size decreases, then the existing log vector will be overwritten and the space usage will go down. This is the only condition where the space usage reduces, and it can only occur when an item is already tracked in the CIL. Hence we are safe from CIL space usage underruns as a result of log items decreasing in size when they are relogged. Typically this reduction in CIL usage occurs from metadata blocks being free, such as when a btree block merge occurs or a directory enter/xattr entry is removed and the da-tree is reduced in size. This generally results in a reduction in size of around a single block in the CIL, but also tends to increase the number of log vectors because the parent and sibling nodes in the tree needs to be updated when a btree block is removed. If a multi-level merge occurs, then we see reduction in size of 2+ blocks, but again the log vector count goes up. The other vector is inode fork size changes, which only log the current size of the fork and ignore the previously logged size when the fork is relogged. Hence if we are removing items from the inode fork (dir/xattr removal in shortform, extent record removal in extent form, etc) the relogged size of the inode for can decrease. No other log items can decrease in size either because they are a fixed size (e.g. dquots) or they cannot be relogged (e.g. relogging an intent actually creates a new intent log item and doesn't relog the old item at all.) Hence the only two vectors for CIL context size reduction are relogging inode forks and marking buffers active in the CIL as stale. Long story short: the majority of the code does the right thing and handles the reduction in log item size correctly, and only the CIL hard throttle implementation is problematic and needs fixing. This patch makes that fix, as well as adds comments in the log item code that result in items shrinking in size when they are relogged as a clear reminder that this can and does happen frequently. The throttle fix is based upon the change Donald proposed, though it goes further to ensure that once the throttle is activated, it captures all tasks until the CIL push issues a wakeup, regardless of whether the CIL space used has gone back under the throttle threshold. This ensures that we prevent tasks reducing the CIL slightly under the throttle threshold and then making more changes that push it well over the throttle limit. This is acheived by checking if the throttle wait queue is already active as a condition of throttling. Hence once we start throttling, we continue to apply the throttle until the CIL context push wakes everything on the wait queue. We can use waitqueue_active() for the waitqueue manipulations and checks as they are all done under the ctx->xc_push_lock. Hence the waitqueue has external serialisation and we can safely peek inside the wait queue without holding the internal waitqueue locks. Many thanks to Donald for his diagnostic and analysis work to isolate the cause of this hang. Reported-and-tested-by: Donald Buczek <buczek@molgen.mpg.de> Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Chandan Babu R <chandanrlinux@gmail.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Allison Henderson <allison.henderson@oracle.com> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-06-18 23:21:51 +08:00
* It calculates this as 1 iovec for the buf log format structure and 1 for each
* stretch of non-contiguous chunks to be logged. Contiguous chunks are logged
* in a single iovec.
*/
STATIC void
xfs_buf_item_size_segment(
struct xfs_buf_log_item *bip,
struct xfs_buf_log_format *blfp,
uint offset,
int *nvecs,
int *nbytes)
{
struct xfs_buf *bp = bip->bli_buf;
xfs: optimise xfs_buf_item_size/format for contiguous regions We process the buf_log_item bitmap one set bit at a time with xfs_next_bit() so we can detect if a region crosses a memcpy discontinuity in the buffer data address. This has massive overhead on large buffers (e.g. 64k directory blocks) because we do a lot of unnecessary checks and xfs_buf_offset() calls. For example, 16-way concurrent create workload on debug kernel running CPU bound has this at the top of the profile at ~120k create/s on 64kb directory block size: 20.66% [kernel] [k] xfs_dir3_leaf_check_int 7.10% [kernel] [k] memcpy 6.22% [kernel] [k] xfs_next_bit 3.55% [kernel] [k] xfs_buf_offset 3.53% [kernel] [k] xfs_buf_item_format 3.34% [kernel] [k] __pv_queued_spin_lock_slowpath 3.04% [kernel] [k] do_raw_spin_lock 2.84% [kernel] [k] xfs_buf_item_size_segment.isra.0 2.31% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.36% [kernel] [k] xfs_log_commit_cil (debug checks hurt large blocks) The only buffers with discontinuities in the data address are unmapped buffers, and they are only used for inode cluster buffers and only for logging unlinked pointers. IOWs, it is -rare- that we even need to detect a discontinuity in the buffer item formatting code. Optimise all this by using xfs_contig_bits() to find the size of the contiguous regions, then test for a discontiunity inside it. If we find one, do the slow "bit at a time" method we do now. If we don't, then just copy the entire contiguous range in one go. Profile now looks like: 25.26% [kernel] [k] xfs_dir3_leaf_check_int 9.25% [kernel] [k] memcpy 5.01% [kernel] [k] __pv_queued_spin_lock_slowpath 2.84% [kernel] [k] do_raw_spin_lock 2.22% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.88% [kernel] [k] xfs_buf_find 1.53% [kernel] [k] memmove 1.47% [kernel] [k] xfs_log_commit_cil .... 0.34% [kernel] [k] xfs_buf_item_format .... 0.21% [kernel] [k] xfs_buf_offset .... 0.16% [kernel] [k] xfs_contig_bits .... 0.13% [kernel] [k] xfs_buf_item_size_segment.isra.0 So the bit scanning over for the dirty region tracking for the buffer log items is basically gone. Debug overhead hurts even more now... Perf comparison dir block creates unlink size (kb) time rate time Original 4 4m08s 220k 5m13s Original 64 7m21s 115k 13m25s Patched 4 3m59s 230k 5m03s Patched 64 6m23s 143k 12m33s Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-03-23 00:52:04 +08:00
int first_bit;
int nbits;
int next_bit;
int last_bit;
xfs: optimise xfs_buf_item_size/format for contiguous regions We process the buf_log_item bitmap one set bit at a time with xfs_next_bit() so we can detect if a region crosses a memcpy discontinuity in the buffer data address. This has massive overhead on large buffers (e.g. 64k directory blocks) because we do a lot of unnecessary checks and xfs_buf_offset() calls. For example, 16-way concurrent create workload on debug kernel running CPU bound has this at the top of the profile at ~120k create/s on 64kb directory block size: 20.66% [kernel] [k] xfs_dir3_leaf_check_int 7.10% [kernel] [k] memcpy 6.22% [kernel] [k] xfs_next_bit 3.55% [kernel] [k] xfs_buf_offset 3.53% [kernel] [k] xfs_buf_item_format 3.34% [kernel] [k] __pv_queued_spin_lock_slowpath 3.04% [kernel] [k] do_raw_spin_lock 2.84% [kernel] [k] xfs_buf_item_size_segment.isra.0 2.31% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.36% [kernel] [k] xfs_log_commit_cil (debug checks hurt large blocks) The only buffers with discontinuities in the data address are unmapped buffers, and they are only used for inode cluster buffers and only for logging unlinked pointers. IOWs, it is -rare- that we even need to detect a discontinuity in the buffer item formatting code. Optimise all this by using xfs_contig_bits() to find the size of the contiguous regions, then test for a discontiunity inside it. If we find one, do the slow "bit at a time" method we do now. If we don't, then just copy the entire contiguous range in one go. Profile now looks like: 25.26% [kernel] [k] xfs_dir3_leaf_check_int 9.25% [kernel] [k] memcpy 5.01% [kernel] [k] __pv_queued_spin_lock_slowpath 2.84% [kernel] [k] do_raw_spin_lock 2.22% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.88% [kernel] [k] xfs_buf_find 1.53% [kernel] [k] memmove 1.47% [kernel] [k] xfs_log_commit_cil .... 0.34% [kernel] [k] xfs_buf_item_format .... 0.21% [kernel] [k] xfs_buf_offset .... 0.16% [kernel] [k] xfs_contig_bits .... 0.13% [kernel] [k] xfs_buf_item_size_segment.isra.0 So the bit scanning over for the dirty region tracking for the buffer log items is basically gone. Debug overhead hurts even more now... Perf comparison dir block creates unlink size (kb) time rate time Original 4 4m08s 220k 5m13s Original 64 7m21s 115k 13m25s Patched 4 3m59s 230k 5m03s Patched 64 6m23s 143k 12m33s Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-03-23 00:52:04 +08:00
first_bit = xfs_next_bit(blfp->blf_data_map, blfp->blf_map_size, 0);
if (first_bit == -1)
return;
xfs: optimise xfs_buf_item_size/format for contiguous regions We process the buf_log_item bitmap one set bit at a time with xfs_next_bit() so we can detect if a region crosses a memcpy discontinuity in the buffer data address. This has massive overhead on large buffers (e.g. 64k directory blocks) because we do a lot of unnecessary checks and xfs_buf_offset() calls. For example, 16-way concurrent create workload on debug kernel running CPU bound has this at the top of the profile at ~120k create/s on 64kb directory block size: 20.66% [kernel] [k] xfs_dir3_leaf_check_int 7.10% [kernel] [k] memcpy 6.22% [kernel] [k] xfs_next_bit 3.55% [kernel] [k] xfs_buf_offset 3.53% [kernel] [k] xfs_buf_item_format 3.34% [kernel] [k] __pv_queued_spin_lock_slowpath 3.04% [kernel] [k] do_raw_spin_lock 2.84% [kernel] [k] xfs_buf_item_size_segment.isra.0 2.31% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.36% [kernel] [k] xfs_log_commit_cil (debug checks hurt large blocks) The only buffers with discontinuities in the data address are unmapped buffers, and they are only used for inode cluster buffers and only for logging unlinked pointers. IOWs, it is -rare- that we even need to detect a discontinuity in the buffer item formatting code. Optimise all this by using xfs_contig_bits() to find the size of the contiguous regions, then test for a discontiunity inside it. If we find one, do the slow "bit at a time" method we do now. If we don't, then just copy the entire contiguous range in one go. Profile now looks like: 25.26% [kernel] [k] xfs_dir3_leaf_check_int 9.25% [kernel] [k] memcpy 5.01% [kernel] [k] __pv_queued_spin_lock_slowpath 2.84% [kernel] [k] do_raw_spin_lock 2.22% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.88% [kernel] [k] xfs_buf_find 1.53% [kernel] [k] memmove 1.47% [kernel] [k] xfs_log_commit_cil .... 0.34% [kernel] [k] xfs_buf_item_format .... 0.21% [kernel] [k] xfs_buf_offset .... 0.16% [kernel] [k] xfs_contig_bits .... 0.13% [kernel] [k] xfs_buf_item_size_segment.isra.0 So the bit scanning over for the dirty region tracking for the buffer log items is basically gone. Debug overhead hurts even more now... Perf comparison dir block creates unlink size (kb) time rate time Original 4 4m08s 220k 5m13s Original 64 7m21s 115k 13m25s Patched 4 3m59s 230k 5m03s Patched 64 6m23s 143k 12m33s Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-03-23 00:52:04 +08:00
(*nvecs)++;
*nbytes += xfs_buf_log_format_size(blfp);
do {
nbits = xfs_contig_bits(blfp->blf_data_map,
blfp->blf_map_size, first_bit);
ASSERT(nbits > 0);
/*
* Straddling a page is rare because we don't log contiguous
* chunks of unmapped buffers anywhere.
*/
if (nbits > 1 &&
xfs_buf_item_straddle(bp, offset, first_bit, nbits))
goto slow_scan;
(*nvecs)++;
*nbytes += nbits * XFS_BLF_CHUNK;
/*
* This takes the bit number to start looking from and
* returns the next set bit from there. It returns -1
* if there are no more bits set or the start bit is
* beyond the end of the bitmap.
*/
first_bit = xfs_next_bit(blfp->blf_data_map, blfp->blf_map_size,
(uint)first_bit + nbits + 1);
} while (first_bit != -1);
xfs: optimise xfs_buf_item_size/format for contiguous regions We process the buf_log_item bitmap one set bit at a time with xfs_next_bit() so we can detect if a region crosses a memcpy discontinuity in the buffer data address. This has massive overhead on large buffers (e.g. 64k directory blocks) because we do a lot of unnecessary checks and xfs_buf_offset() calls. For example, 16-way concurrent create workload on debug kernel running CPU bound has this at the top of the profile at ~120k create/s on 64kb directory block size: 20.66% [kernel] [k] xfs_dir3_leaf_check_int 7.10% [kernel] [k] memcpy 6.22% [kernel] [k] xfs_next_bit 3.55% [kernel] [k] xfs_buf_offset 3.53% [kernel] [k] xfs_buf_item_format 3.34% [kernel] [k] __pv_queued_spin_lock_slowpath 3.04% [kernel] [k] do_raw_spin_lock 2.84% [kernel] [k] xfs_buf_item_size_segment.isra.0 2.31% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.36% [kernel] [k] xfs_log_commit_cil (debug checks hurt large blocks) The only buffers with discontinuities in the data address are unmapped buffers, and they are only used for inode cluster buffers and only for logging unlinked pointers. IOWs, it is -rare- that we even need to detect a discontinuity in the buffer item formatting code. Optimise all this by using xfs_contig_bits() to find the size of the contiguous regions, then test for a discontiunity inside it. If we find one, do the slow "bit at a time" method we do now. If we don't, then just copy the entire contiguous range in one go. Profile now looks like: 25.26% [kernel] [k] xfs_dir3_leaf_check_int 9.25% [kernel] [k] memcpy 5.01% [kernel] [k] __pv_queued_spin_lock_slowpath 2.84% [kernel] [k] do_raw_spin_lock 2.22% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.88% [kernel] [k] xfs_buf_find 1.53% [kernel] [k] memmove 1.47% [kernel] [k] xfs_log_commit_cil .... 0.34% [kernel] [k] xfs_buf_item_format .... 0.21% [kernel] [k] xfs_buf_offset .... 0.16% [kernel] [k] xfs_contig_bits .... 0.13% [kernel] [k] xfs_buf_item_size_segment.isra.0 So the bit scanning over for the dirty region tracking for the buffer log items is basically gone. Debug overhead hurts even more now... Perf comparison dir block creates unlink size (kb) time rate time Original 4 4m08s 220k 5m13s Original 64 7m21s 115k 13m25s Patched 4 3m59s 230k 5m03s Patched 64 6m23s 143k 12m33s Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-03-23 00:52:04 +08:00
return;
slow_scan:
/* Count the first bit we jumped out of the above loop from */
(*nvecs)++;
*nbytes += XFS_BLF_CHUNK;
last_bit = first_bit;
while (last_bit != -1) {
/*
* This takes the bit number to start looking from and
* returns the next set bit from there. It returns -1
* if there are no more bits set or the start bit is
* beyond the end of the bitmap.
*/
next_bit = xfs_next_bit(blfp->blf_data_map, blfp->blf_map_size,
last_bit + 1);
/*
* If we run out of bits, leave the loop,
* else if we find a new set of bits bump the number of vecs,
* else keep scanning the current set of bits.
*/
if (next_bit == -1) {
break;
} else if (next_bit != last_bit + 1 ||
xfs: optimise xfs_buf_item_size/format for contiguous regions We process the buf_log_item bitmap one set bit at a time with xfs_next_bit() so we can detect if a region crosses a memcpy discontinuity in the buffer data address. This has massive overhead on large buffers (e.g. 64k directory blocks) because we do a lot of unnecessary checks and xfs_buf_offset() calls. For example, 16-way concurrent create workload on debug kernel running CPU bound has this at the top of the profile at ~120k create/s on 64kb directory block size: 20.66% [kernel] [k] xfs_dir3_leaf_check_int 7.10% [kernel] [k] memcpy 6.22% [kernel] [k] xfs_next_bit 3.55% [kernel] [k] xfs_buf_offset 3.53% [kernel] [k] xfs_buf_item_format 3.34% [kernel] [k] __pv_queued_spin_lock_slowpath 3.04% [kernel] [k] do_raw_spin_lock 2.84% [kernel] [k] xfs_buf_item_size_segment.isra.0 2.31% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.36% [kernel] [k] xfs_log_commit_cil (debug checks hurt large blocks) The only buffers with discontinuities in the data address are unmapped buffers, and they are only used for inode cluster buffers and only for logging unlinked pointers. IOWs, it is -rare- that we even need to detect a discontinuity in the buffer item formatting code. Optimise all this by using xfs_contig_bits() to find the size of the contiguous regions, then test for a discontiunity inside it. If we find one, do the slow "bit at a time" method we do now. If we don't, then just copy the entire contiguous range in one go. Profile now looks like: 25.26% [kernel] [k] xfs_dir3_leaf_check_int 9.25% [kernel] [k] memcpy 5.01% [kernel] [k] __pv_queued_spin_lock_slowpath 2.84% [kernel] [k] do_raw_spin_lock 2.22% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.88% [kernel] [k] xfs_buf_find 1.53% [kernel] [k] memmove 1.47% [kernel] [k] xfs_log_commit_cil .... 0.34% [kernel] [k] xfs_buf_item_format .... 0.21% [kernel] [k] xfs_buf_offset .... 0.16% [kernel] [k] xfs_contig_bits .... 0.13% [kernel] [k] xfs_buf_item_size_segment.isra.0 So the bit scanning over for the dirty region tracking for the buffer log items is basically gone. Debug overhead hurts even more now... Perf comparison dir block creates unlink size (kb) time rate time Original 4 4m08s 220k 5m13s Original 64 7m21s 115k 13m25s Patched 4 3m59s 230k 5m03s Patched 64 6m23s 143k 12m33s Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-03-23 00:52:04 +08:00
xfs_buf_item_straddle(bp, offset, first_bit, nbits)) {
last_bit = next_bit;
xfs: optimise xfs_buf_item_size/format for contiguous regions We process the buf_log_item bitmap one set bit at a time with xfs_next_bit() so we can detect if a region crosses a memcpy discontinuity in the buffer data address. This has massive overhead on large buffers (e.g. 64k directory blocks) because we do a lot of unnecessary checks and xfs_buf_offset() calls. For example, 16-way concurrent create workload on debug kernel running CPU bound has this at the top of the profile at ~120k create/s on 64kb directory block size: 20.66% [kernel] [k] xfs_dir3_leaf_check_int 7.10% [kernel] [k] memcpy 6.22% [kernel] [k] xfs_next_bit 3.55% [kernel] [k] xfs_buf_offset 3.53% [kernel] [k] xfs_buf_item_format 3.34% [kernel] [k] __pv_queued_spin_lock_slowpath 3.04% [kernel] [k] do_raw_spin_lock 2.84% [kernel] [k] xfs_buf_item_size_segment.isra.0 2.31% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.36% [kernel] [k] xfs_log_commit_cil (debug checks hurt large blocks) The only buffers with discontinuities in the data address are unmapped buffers, and they are only used for inode cluster buffers and only for logging unlinked pointers. IOWs, it is -rare- that we even need to detect a discontinuity in the buffer item formatting code. Optimise all this by using xfs_contig_bits() to find the size of the contiguous regions, then test for a discontiunity inside it. If we find one, do the slow "bit at a time" method we do now. If we don't, then just copy the entire contiguous range in one go. Profile now looks like: 25.26% [kernel] [k] xfs_dir3_leaf_check_int 9.25% [kernel] [k] memcpy 5.01% [kernel] [k] __pv_queued_spin_lock_slowpath 2.84% [kernel] [k] do_raw_spin_lock 2.22% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.88% [kernel] [k] xfs_buf_find 1.53% [kernel] [k] memmove 1.47% [kernel] [k] xfs_log_commit_cil .... 0.34% [kernel] [k] xfs_buf_item_format .... 0.21% [kernel] [k] xfs_buf_offset .... 0.16% [kernel] [k] xfs_contig_bits .... 0.13% [kernel] [k] xfs_buf_item_size_segment.isra.0 So the bit scanning over for the dirty region tracking for the buffer log items is basically gone. Debug overhead hurts even more now... Perf comparison dir block creates unlink size (kb) time rate time Original 4 4m08s 220k 5m13s Original 64 7m21s 115k 13m25s Patched 4 3m59s 230k 5m03s Patched 64 6m23s 143k 12m33s Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-03-23 00:52:04 +08:00
first_bit = next_bit;
(*nvecs)++;
xfs: optimise xfs_buf_item_size/format for contiguous regions We process the buf_log_item bitmap one set bit at a time with xfs_next_bit() so we can detect if a region crosses a memcpy discontinuity in the buffer data address. This has massive overhead on large buffers (e.g. 64k directory blocks) because we do a lot of unnecessary checks and xfs_buf_offset() calls. For example, 16-way concurrent create workload on debug kernel running CPU bound has this at the top of the profile at ~120k create/s on 64kb directory block size: 20.66% [kernel] [k] xfs_dir3_leaf_check_int 7.10% [kernel] [k] memcpy 6.22% [kernel] [k] xfs_next_bit 3.55% [kernel] [k] xfs_buf_offset 3.53% [kernel] [k] xfs_buf_item_format 3.34% [kernel] [k] __pv_queued_spin_lock_slowpath 3.04% [kernel] [k] do_raw_spin_lock 2.84% [kernel] [k] xfs_buf_item_size_segment.isra.0 2.31% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.36% [kernel] [k] xfs_log_commit_cil (debug checks hurt large blocks) The only buffers with discontinuities in the data address are unmapped buffers, and they are only used for inode cluster buffers and only for logging unlinked pointers. IOWs, it is -rare- that we even need to detect a discontinuity in the buffer item formatting code. Optimise all this by using xfs_contig_bits() to find the size of the contiguous regions, then test for a discontiunity inside it. If we find one, do the slow "bit at a time" method we do now. If we don't, then just copy the entire contiguous range in one go. Profile now looks like: 25.26% [kernel] [k] xfs_dir3_leaf_check_int 9.25% [kernel] [k] memcpy 5.01% [kernel] [k] __pv_queued_spin_lock_slowpath 2.84% [kernel] [k] do_raw_spin_lock 2.22% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.88% [kernel] [k] xfs_buf_find 1.53% [kernel] [k] memmove 1.47% [kernel] [k] xfs_log_commit_cil .... 0.34% [kernel] [k] xfs_buf_item_format .... 0.21% [kernel] [k] xfs_buf_offset .... 0.16% [kernel] [k] xfs_contig_bits .... 0.13% [kernel] [k] xfs_buf_item_size_segment.isra.0 So the bit scanning over for the dirty region tracking for the buffer log items is basically gone. Debug overhead hurts even more now... Perf comparison dir block creates unlink size (kb) time rate time Original 4 4m08s 220k 5m13s Original 64 7m21s 115k 13m25s Patched 4 3m59s 230k 5m03s Patched 64 6m23s 143k 12m33s Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-03-23 00:52:04 +08:00
nbits = 1;
} else {
last_bit++;
xfs: optimise xfs_buf_item_size/format for contiguous regions We process the buf_log_item bitmap one set bit at a time with xfs_next_bit() so we can detect if a region crosses a memcpy discontinuity in the buffer data address. This has massive overhead on large buffers (e.g. 64k directory blocks) because we do a lot of unnecessary checks and xfs_buf_offset() calls. For example, 16-way concurrent create workload on debug kernel running CPU bound has this at the top of the profile at ~120k create/s on 64kb directory block size: 20.66% [kernel] [k] xfs_dir3_leaf_check_int 7.10% [kernel] [k] memcpy 6.22% [kernel] [k] xfs_next_bit 3.55% [kernel] [k] xfs_buf_offset 3.53% [kernel] [k] xfs_buf_item_format 3.34% [kernel] [k] __pv_queued_spin_lock_slowpath 3.04% [kernel] [k] do_raw_spin_lock 2.84% [kernel] [k] xfs_buf_item_size_segment.isra.0 2.31% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.36% [kernel] [k] xfs_log_commit_cil (debug checks hurt large blocks) The only buffers with discontinuities in the data address are unmapped buffers, and they are only used for inode cluster buffers and only for logging unlinked pointers. IOWs, it is -rare- that we even need to detect a discontinuity in the buffer item formatting code. Optimise all this by using xfs_contig_bits() to find the size of the contiguous regions, then test for a discontiunity inside it. If we find one, do the slow "bit at a time" method we do now. If we don't, then just copy the entire contiguous range in one go. Profile now looks like: 25.26% [kernel] [k] xfs_dir3_leaf_check_int 9.25% [kernel] [k] memcpy 5.01% [kernel] [k] __pv_queued_spin_lock_slowpath 2.84% [kernel] [k] do_raw_spin_lock 2.22% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.88% [kernel] [k] xfs_buf_find 1.53% [kernel] [k] memmove 1.47% [kernel] [k] xfs_log_commit_cil .... 0.34% [kernel] [k] xfs_buf_item_format .... 0.21% [kernel] [k] xfs_buf_offset .... 0.16% [kernel] [k] xfs_contig_bits .... 0.13% [kernel] [k] xfs_buf_item_size_segment.isra.0 So the bit scanning over for the dirty region tracking for the buffer log items is basically gone. Debug overhead hurts even more now... Perf comparison dir block creates unlink size (kb) time rate time Original 4 4m08s 220k 5m13s Original 64 7m21s 115k 13m25s Patched 4 3m59s 230k 5m03s Patched 64 6m23s 143k 12m33s Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-03-23 00:52:04 +08:00
nbits++;
}
*nbytes += XFS_BLF_CHUNK;
}
}
/*
xfs: Fix CIL throttle hang when CIL space used going backwards A hang with tasks stuck on the CIL hard throttle was reported and largely diagnosed by Donald Buczek, who discovered that it was a result of the CIL context space usage decrementing in committed transactions once the hard throttle limit had been hit and processes were already blocked. This resulted in the CIL push not waking up those waiters because the CIL context was no longer over the hard throttle limit. The surprising aspect of this was the CIL space usage going backwards regularly enough to trigger this situation. Assumptions had been made in design that the relogging process would only increase the size of the objects in the CIL, and so that space would only increase. This change and commit message fixes the issue and documents the result of an audit of the triggers that can cause the CIL space to go backwards, how large the backwards steps tend to be, the frequency in which they occur, and what the impact on the CIL accounting code is. Even though the CIL ctx->space_used can go backwards, it will only do so if the log item is already logged to the CIL and contains a space reservation for it's entire logged state. This is tracked by the shadow buffer state on the log item. If the item is not previously logged in the CIL it has no shadow buffer nor log vector, and hence the entire size of the logged item copied to the log vector is accounted to the CIL space usage. i.e. it will always go up in this case. If the item has a log vector (i.e. already in the CIL) and the size decreases, then the existing log vector will be overwritten and the space usage will go down. This is the only condition where the space usage reduces, and it can only occur when an item is already tracked in the CIL. Hence we are safe from CIL space usage underruns as a result of log items decreasing in size when they are relogged. Typically this reduction in CIL usage occurs from metadata blocks being free, such as when a btree block merge occurs or a directory enter/xattr entry is removed and the da-tree is reduced in size. This generally results in a reduction in size of around a single block in the CIL, but also tends to increase the number of log vectors because the parent and sibling nodes in the tree needs to be updated when a btree block is removed. If a multi-level merge occurs, then we see reduction in size of 2+ blocks, but again the log vector count goes up. The other vector is inode fork size changes, which only log the current size of the fork and ignore the previously logged size when the fork is relogged. Hence if we are removing items from the inode fork (dir/xattr removal in shortform, extent record removal in extent form, etc) the relogged size of the inode for can decrease. No other log items can decrease in size either because they are a fixed size (e.g. dquots) or they cannot be relogged (e.g. relogging an intent actually creates a new intent log item and doesn't relog the old item at all.) Hence the only two vectors for CIL context size reduction are relogging inode forks and marking buffers active in the CIL as stale. Long story short: the majority of the code does the right thing and handles the reduction in log item size correctly, and only the CIL hard throttle implementation is problematic and needs fixing. This patch makes that fix, as well as adds comments in the log item code that result in items shrinking in size when they are relogged as a clear reminder that this can and does happen frequently. The throttle fix is based upon the change Donald proposed, though it goes further to ensure that once the throttle is activated, it captures all tasks until the CIL push issues a wakeup, regardless of whether the CIL space used has gone back under the throttle threshold. This ensures that we prevent tasks reducing the CIL slightly under the throttle threshold and then making more changes that push it well over the throttle limit. This is acheived by checking if the throttle wait queue is already active as a condition of throttling. Hence once we start throttling, we continue to apply the throttle until the CIL context push wakes everything on the wait queue. We can use waitqueue_active() for the waitqueue manipulations and checks as they are all done under the ctx->xc_push_lock. Hence the waitqueue has external serialisation and we can safely peek inside the wait queue without holding the internal waitqueue locks. Many thanks to Donald for his diagnostic and analysis work to isolate the cause of this hang. Reported-and-tested-by: Donald Buczek <buczek@molgen.mpg.de> Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Chandan Babu R <chandanrlinux@gmail.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Allison Henderson <allison.henderson@oracle.com> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-06-18 23:21:51 +08:00
* Return the number of log iovecs and space needed to log the given buf log
* item.
*
* Discontiguous buffers need a format structure per region that is being
* logged. This makes the changes in the buffer appear to log recovery as though
* they came from separate buffers, just like would occur if multiple buffers
* were used instead of a single discontiguous buffer. This enables
* discontiguous buffers to be in-memory constructs, completely transparent to
* what ends up on disk.
*
* If the XFS_BLI_STALE flag has been set, then log nothing but the buf log
xfs: Fix CIL throttle hang when CIL space used going backwards A hang with tasks stuck on the CIL hard throttle was reported and largely diagnosed by Donald Buczek, who discovered that it was a result of the CIL context space usage decrementing in committed transactions once the hard throttle limit had been hit and processes were already blocked. This resulted in the CIL push not waking up those waiters because the CIL context was no longer over the hard throttle limit. The surprising aspect of this was the CIL space usage going backwards regularly enough to trigger this situation. Assumptions had been made in design that the relogging process would only increase the size of the objects in the CIL, and so that space would only increase. This change and commit message fixes the issue and documents the result of an audit of the triggers that can cause the CIL space to go backwards, how large the backwards steps tend to be, the frequency in which they occur, and what the impact on the CIL accounting code is. Even though the CIL ctx->space_used can go backwards, it will only do so if the log item is already logged to the CIL and contains a space reservation for it's entire logged state. This is tracked by the shadow buffer state on the log item. If the item is not previously logged in the CIL it has no shadow buffer nor log vector, and hence the entire size of the logged item copied to the log vector is accounted to the CIL space usage. i.e. it will always go up in this case. If the item has a log vector (i.e. already in the CIL) and the size decreases, then the existing log vector will be overwritten and the space usage will go down. This is the only condition where the space usage reduces, and it can only occur when an item is already tracked in the CIL. Hence we are safe from CIL space usage underruns as a result of log items decreasing in size when they are relogged. Typically this reduction in CIL usage occurs from metadata blocks being free, such as when a btree block merge occurs or a directory enter/xattr entry is removed and the da-tree is reduced in size. This generally results in a reduction in size of around a single block in the CIL, but also tends to increase the number of log vectors because the parent and sibling nodes in the tree needs to be updated when a btree block is removed. If a multi-level merge occurs, then we see reduction in size of 2+ blocks, but again the log vector count goes up. The other vector is inode fork size changes, which only log the current size of the fork and ignore the previously logged size when the fork is relogged. Hence if we are removing items from the inode fork (dir/xattr removal in shortform, extent record removal in extent form, etc) the relogged size of the inode for can decrease. No other log items can decrease in size either because they are a fixed size (e.g. dquots) or they cannot be relogged (e.g. relogging an intent actually creates a new intent log item and doesn't relog the old item at all.) Hence the only two vectors for CIL context size reduction are relogging inode forks and marking buffers active in the CIL as stale. Long story short: the majority of the code does the right thing and handles the reduction in log item size correctly, and only the CIL hard throttle implementation is problematic and needs fixing. This patch makes that fix, as well as adds comments in the log item code that result in items shrinking in size when they are relogged as a clear reminder that this can and does happen frequently. The throttle fix is based upon the change Donald proposed, though it goes further to ensure that once the throttle is activated, it captures all tasks until the CIL push issues a wakeup, regardless of whether the CIL space used has gone back under the throttle threshold. This ensures that we prevent tasks reducing the CIL slightly under the throttle threshold and then making more changes that push it well over the throttle limit. This is acheived by checking if the throttle wait queue is already active as a condition of throttling. Hence once we start throttling, we continue to apply the throttle until the CIL context push wakes everything on the wait queue. We can use waitqueue_active() for the waitqueue manipulations and checks as they are all done under the ctx->xc_push_lock. Hence the waitqueue has external serialisation and we can safely peek inside the wait queue without holding the internal waitqueue locks. Many thanks to Donald for his diagnostic and analysis work to isolate the cause of this hang. Reported-and-tested-by: Donald Buczek <buczek@molgen.mpg.de> Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Chandan Babu R <chandanrlinux@gmail.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Allison Henderson <allison.henderson@oracle.com> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-06-18 23:21:51 +08:00
* format structures. If the item has previously been logged and has dirty
* regions, we do not relog them in stale buffers. This has the effect of
* reducing the size of the relogged item by the amount of dirty data tracked
* by the log item. This can result in the committing transaction reducing the
* amount of space being consumed by the CIL.
*/
STATIC void
xfs_buf_item_size(
struct xfs_log_item *lip,
int *nvecs,
int *nbytes)
{
struct xfs_buf_log_item *bip = BUF_ITEM(lip);
struct xfs_buf *bp = bip->bli_buf;
int i;
xfs: reduce buffer log item shadow allocations When we modify btrees repeatedly, we regularly increase the size of the logged region by a single chunk at a time (per transaction commit). This results in the CIL formatting code having to reallocate the log vector buffer every time the buffer dirty region grows. Hence over a typical 4kB btree buffer, we might grow the log vector 4096/128 = 32x over a short period where we repeatedly add or remove records to/from the buffer over a series of running transaction. This means we are doing 32 memory allocations and frees over this time during a performance critical path in the journal. The amount of space tracked in the CIL for the object is calculated during the ->iop_format() call for the buffer log item, but the buffer memory allocated for it is calculated by the ->iop_size() call. The size callout determines the size of the buffer, the format call determines the space used in the buffer. Hence we can oversize the buffer space required in the size calculation without impacting the amount of space used and accounted to the CIL for the changes being logged. This allows us to reduce the number of allocations by rounding up the buffer size to allow for future growth. This can safe a substantial amount of CPU time in this path: - 46.52% 2.02% [kernel] [k] xfs_log_commit_cil - 44.49% xfs_log_commit_cil - 30.78% _raw_spin_lock - 30.75% do_raw_spin_lock 30.27% __pv_queued_spin_lock_slowpath (oh, ouch!) .... - 1.05% kmem_alloc_large - 1.02% kmem_alloc 0.94% __kmalloc This overhead here us what this patch is aimed at. After: - 0.76% kmem_alloc_large - 0.75% kmem_alloc 0.70% __kmalloc The size of 512 bytes is based on the bitmap chunk size being 128 bytes and that random directory entry updates almost never require more than 3-4 128 byte regions to be logged in the directory block. The other observation is for per-ag btrees. When we are inserting into a new btree block, we'll pack it from the front. Hence the first few records land in the first 128 bytes so we log only 128 bytes, the next 8-16 records land in the second region so now we log 256 bytes. And so on. If we are doing random updates, it will only allocate every 4 random 128 byte regions that are dirtied instead of every single one. Any larger than 512 bytes and I noticed an increase in memory footprint in my scalability workloads. Any less than this and I didn't really see any significant benefit to CPU usage. Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Chandan Babu R <chandanrlinux@gmail.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Gao Xiang <hsiangkao@redhat.com>
2021-03-23 00:52:03 +08:00
int bytes;
uint offset = 0;
ASSERT(atomic_read(&bip->bli_refcount) > 0);
if (bip->bli_flags & XFS_BLI_STALE) {
/*
xfs: Fix CIL throttle hang when CIL space used going backwards A hang with tasks stuck on the CIL hard throttle was reported and largely diagnosed by Donald Buczek, who discovered that it was a result of the CIL context space usage decrementing in committed transactions once the hard throttle limit had been hit and processes were already blocked. This resulted in the CIL push not waking up those waiters because the CIL context was no longer over the hard throttle limit. The surprising aspect of this was the CIL space usage going backwards regularly enough to trigger this situation. Assumptions had been made in design that the relogging process would only increase the size of the objects in the CIL, and so that space would only increase. This change and commit message fixes the issue and documents the result of an audit of the triggers that can cause the CIL space to go backwards, how large the backwards steps tend to be, the frequency in which they occur, and what the impact on the CIL accounting code is. Even though the CIL ctx->space_used can go backwards, it will only do so if the log item is already logged to the CIL and contains a space reservation for it's entire logged state. This is tracked by the shadow buffer state on the log item. If the item is not previously logged in the CIL it has no shadow buffer nor log vector, and hence the entire size of the logged item copied to the log vector is accounted to the CIL space usage. i.e. it will always go up in this case. If the item has a log vector (i.e. already in the CIL) and the size decreases, then the existing log vector will be overwritten and the space usage will go down. This is the only condition where the space usage reduces, and it can only occur when an item is already tracked in the CIL. Hence we are safe from CIL space usage underruns as a result of log items decreasing in size when they are relogged. Typically this reduction in CIL usage occurs from metadata blocks being free, such as when a btree block merge occurs or a directory enter/xattr entry is removed and the da-tree is reduced in size. This generally results in a reduction in size of around a single block in the CIL, but also tends to increase the number of log vectors because the parent and sibling nodes in the tree needs to be updated when a btree block is removed. If a multi-level merge occurs, then we see reduction in size of 2+ blocks, but again the log vector count goes up. The other vector is inode fork size changes, which only log the current size of the fork and ignore the previously logged size when the fork is relogged. Hence if we are removing items from the inode fork (dir/xattr removal in shortform, extent record removal in extent form, etc) the relogged size of the inode for can decrease. No other log items can decrease in size either because they are a fixed size (e.g. dquots) or they cannot be relogged (e.g. relogging an intent actually creates a new intent log item and doesn't relog the old item at all.) Hence the only two vectors for CIL context size reduction are relogging inode forks and marking buffers active in the CIL as stale. Long story short: the majority of the code does the right thing and handles the reduction in log item size correctly, and only the CIL hard throttle implementation is problematic and needs fixing. This patch makes that fix, as well as adds comments in the log item code that result in items shrinking in size when they are relogged as a clear reminder that this can and does happen frequently. The throttle fix is based upon the change Donald proposed, though it goes further to ensure that once the throttle is activated, it captures all tasks until the CIL push issues a wakeup, regardless of whether the CIL space used has gone back under the throttle threshold. This ensures that we prevent tasks reducing the CIL slightly under the throttle threshold and then making more changes that push it well over the throttle limit. This is acheived by checking if the throttle wait queue is already active as a condition of throttling. Hence once we start throttling, we continue to apply the throttle until the CIL context push wakes everything on the wait queue. We can use waitqueue_active() for the waitqueue manipulations and checks as they are all done under the ctx->xc_push_lock. Hence the waitqueue has external serialisation and we can safely peek inside the wait queue without holding the internal waitqueue locks. Many thanks to Donald for his diagnostic and analysis work to isolate the cause of this hang. Reported-and-tested-by: Donald Buczek <buczek@molgen.mpg.de> Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Chandan Babu R <chandanrlinux@gmail.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Allison Henderson <allison.henderson@oracle.com> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-06-18 23:21:51 +08:00
* The buffer is stale, so all we need to log is the buf log
* format structure with the cancel flag in it as we are never
* going to replay the changes tracked in the log item.
*/
trace_xfs_buf_item_size_stale(bip);
ASSERT(bip->__bli_format.blf_flags & XFS_BLF_CANCEL);
*nvecs += bip->bli_format_count;
for (i = 0; i < bip->bli_format_count; i++) {
*nbytes += xfs_buf_log_format_size(&bip->bli_formats[i]);
}
return;
}
ASSERT(bip->bli_flags & XFS_BLI_LOGGED);
if (bip->bli_flags & XFS_BLI_ORDERED) {
/*
xfs: Fix CIL throttle hang when CIL space used going backwards A hang with tasks stuck on the CIL hard throttle was reported and largely diagnosed by Donald Buczek, who discovered that it was a result of the CIL context space usage decrementing in committed transactions once the hard throttle limit had been hit and processes were already blocked. This resulted in the CIL push not waking up those waiters because the CIL context was no longer over the hard throttle limit. The surprising aspect of this was the CIL space usage going backwards regularly enough to trigger this situation. Assumptions had been made in design that the relogging process would only increase the size of the objects in the CIL, and so that space would only increase. This change and commit message fixes the issue and documents the result of an audit of the triggers that can cause the CIL space to go backwards, how large the backwards steps tend to be, the frequency in which they occur, and what the impact on the CIL accounting code is. Even though the CIL ctx->space_used can go backwards, it will only do so if the log item is already logged to the CIL and contains a space reservation for it's entire logged state. This is tracked by the shadow buffer state on the log item. If the item is not previously logged in the CIL it has no shadow buffer nor log vector, and hence the entire size of the logged item copied to the log vector is accounted to the CIL space usage. i.e. it will always go up in this case. If the item has a log vector (i.e. already in the CIL) and the size decreases, then the existing log vector will be overwritten and the space usage will go down. This is the only condition where the space usage reduces, and it can only occur when an item is already tracked in the CIL. Hence we are safe from CIL space usage underruns as a result of log items decreasing in size when they are relogged. Typically this reduction in CIL usage occurs from metadata blocks being free, such as when a btree block merge occurs or a directory enter/xattr entry is removed and the da-tree is reduced in size. This generally results in a reduction in size of around a single block in the CIL, but also tends to increase the number of log vectors because the parent and sibling nodes in the tree needs to be updated when a btree block is removed. If a multi-level merge occurs, then we see reduction in size of 2+ blocks, but again the log vector count goes up. The other vector is inode fork size changes, which only log the current size of the fork and ignore the previously logged size when the fork is relogged. Hence if we are removing items from the inode fork (dir/xattr removal in shortform, extent record removal in extent form, etc) the relogged size of the inode for can decrease. No other log items can decrease in size either because they are a fixed size (e.g. dquots) or they cannot be relogged (e.g. relogging an intent actually creates a new intent log item and doesn't relog the old item at all.) Hence the only two vectors for CIL context size reduction are relogging inode forks and marking buffers active in the CIL as stale. Long story short: the majority of the code does the right thing and handles the reduction in log item size correctly, and only the CIL hard throttle implementation is problematic and needs fixing. This patch makes that fix, as well as adds comments in the log item code that result in items shrinking in size when they are relogged as a clear reminder that this can and does happen frequently. The throttle fix is based upon the change Donald proposed, though it goes further to ensure that once the throttle is activated, it captures all tasks until the CIL push issues a wakeup, regardless of whether the CIL space used has gone back under the throttle threshold. This ensures that we prevent tasks reducing the CIL slightly under the throttle threshold and then making more changes that push it well over the throttle limit. This is acheived by checking if the throttle wait queue is already active as a condition of throttling. Hence once we start throttling, we continue to apply the throttle until the CIL context push wakes everything on the wait queue. We can use waitqueue_active() for the waitqueue manipulations and checks as they are all done under the ctx->xc_push_lock. Hence the waitqueue has external serialisation and we can safely peek inside the wait queue without holding the internal waitqueue locks. Many thanks to Donald for his diagnostic and analysis work to isolate the cause of this hang. Reported-and-tested-by: Donald Buczek <buczek@molgen.mpg.de> Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Chandan Babu R <chandanrlinux@gmail.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Allison Henderson <allison.henderson@oracle.com> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-06-18 23:21:51 +08:00
* The buffer has been logged just to order it. It is not being
* included in the transaction commit, so no vectors are used at
* all.
*/
trace_xfs_buf_item_size_ordered(bip);
*nvecs = XFS_LOG_VEC_ORDERED;
return;
}
/*
xfs: reduce buffer log item shadow allocations When we modify btrees repeatedly, we regularly increase the size of the logged region by a single chunk at a time (per transaction commit). This results in the CIL formatting code having to reallocate the log vector buffer every time the buffer dirty region grows. Hence over a typical 4kB btree buffer, we might grow the log vector 4096/128 = 32x over a short period where we repeatedly add or remove records to/from the buffer over a series of running transaction. This means we are doing 32 memory allocations and frees over this time during a performance critical path in the journal. The amount of space tracked in the CIL for the object is calculated during the ->iop_format() call for the buffer log item, but the buffer memory allocated for it is calculated by the ->iop_size() call. The size callout determines the size of the buffer, the format call determines the space used in the buffer. Hence we can oversize the buffer space required in the size calculation without impacting the amount of space used and accounted to the CIL for the changes being logged. This allows us to reduce the number of allocations by rounding up the buffer size to allow for future growth. This can safe a substantial amount of CPU time in this path: - 46.52% 2.02% [kernel] [k] xfs_log_commit_cil - 44.49% xfs_log_commit_cil - 30.78% _raw_spin_lock - 30.75% do_raw_spin_lock 30.27% __pv_queued_spin_lock_slowpath (oh, ouch!) .... - 1.05% kmem_alloc_large - 1.02% kmem_alloc 0.94% __kmalloc This overhead here us what this patch is aimed at. After: - 0.76% kmem_alloc_large - 0.75% kmem_alloc 0.70% __kmalloc The size of 512 bytes is based on the bitmap chunk size being 128 bytes and that random directory entry updates almost never require more than 3-4 128 byte regions to be logged in the directory block. The other observation is for per-ag btrees. When we are inserting into a new btree block, we'll pack it from the front. Hence the first few records land in the first 128 bytes so we log only 128 bytes, the next 8-16 records land in the second region so now we log 256 bytes. And so on. If we are doing random updates, it will only allocate every 4 random 128 byte regions that are dirtied instead of every single one. Any larger than 512 bytes and I noticed an increase in memory footprint in my scalability workloads. Any less than this and I didn't really see any significant benefit to CPU usage. Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Chandan Babu R <chandanrlinux@gmail.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Gao Xiang <hsiangkao@redhat.com>
2021-03-23 00:52:03 +08:00
* The vector count is based on the number of buffer vectors we have
* dirty bits in. This will only be greater than one when we have a
* compound buffer with more than one segment dirty. Hence for compound
* buffers we need to track which segment the dirty bits correspond to,
* and when we move from one segment to the next increment the vector
* count for the extra buf log format structure that will need to be
* written.
*/
xfs: reduce buffer log item shadow allocations When we modify btrees repeatedly, we regularly increase the size of the logged region by a single chunk at a time (per transaction commit). This results in the CIL formatting code having to reallocate the log vector buffer every time the buffer dirty region grows. Hence over a typical 4kB btree buffer, we might grow the log vector 4096/128 = 32x over a short period where we repeatedly add or remove records to/from the buffer over a series of running transaction. This means we are doing 32 memory allocations and frees over this time during a performance critical path in the journal. The amount of space tracked in the CIL for the object is calculated during the ->iop_format() call for the buffer log item, but the buffer memory allocated for it is calculated by the ->iop_size() call. The size callout determines the size of the buffer, the format call determines the space used in the buffer. Hence we can oversize the buffer space required in the size calculation without impacting the amount of space used and accounted to the CIL for the changes being logged. This allows us to reduce the number of allocations by rounding up the buffer size to allow for future growth. This can safe a substantial amount of CPU time in this path: - 46.52% 2.02% [kernel] [k] xfs_log_commit_cil - 44.49% xfs_log_commit_cil - 30.78% _raw_spin_lock - 30.75% do_raw_spin_lock 30.27% __pv_queued_spin_lock_slowpath (oh, ouch!) .... - 1.05% kmem_alloc_large - 1.02% kmem_alloc 0.94% __kmalloc This overhead here us what this patch is aimed at. After: - 0.76% kmem_alloc_large - 0.75% kmem_alloc 0.70% __kmalloc The size of 512 bytes is based on the bitmap chunk size being 128 bytes and that random directory entry updates almost never require more than 3-4 128 byte regions to be logged in the directory block. The other observation is for per-ag btrees. When we are inserting into a new btree block, we'll pack it from the front. Hence the first few records land in the first 128 bytes so we log only 128 bytes, the next 8-16 records land in the second region so now we log 256 bytes. And so on. If we are doing random updates, it will only allocate every 4 random 128 byte regions that are dirtied instead of every single one. Any larger than 512 bytes and I noticed an increase in memory footprint in my scalability workloads. Any less than this and I didn't really see any significant benefit to CPU usage. Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Chandan Babu R <chandanrlinux@gmail.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Gao Xiang <hsiangkao@redhat.com>
2021-03-23 00:52:03 +08:00
bytes = 0;
for (i = 0; i < bip->bli_format_count; i++) {
xfs_buf_item_size_segment(bip, &bip->bli_formats[i], offset,
xfs: reduce buffer log item shadow allocations When we modify btrees repeatedly, we regularly increase the size of the logged region by a single chunk at a time (per transaction commit). This results in the CIL formatting code having to reallocate the log vector buffer every time the buffer dirty region grows. Hence over a typical 4kB btree buffer, we might grow the log vector 4096/128 = 32x over a short period where we repeatedly add or remove records to/from the buffer over a series of running transaction. This means we are doing 32 memory allocations and frees over this time during a performance critical path in the journal. The amount of space tracked in the CIL for the object is calculated during the ->iop_format() call for the buffer log item, but the buffer memory allocated for it is calculated by the ->iop_size() call. The size callout determines the size of the buffer, the format call determines the space used in the buffer. Hence we can oversize the buffer space required in the size calculation without impacting the amount of space used and accounted to the CIL for the changes being logged. This allows us to reduce the number of allocations by rounding up the buffer size to allow for future growth. This can safe a substantial amount of CPU time in this path: - 46.52% 2.02% [kernel] [k] xfs_log_commit_cil - 44.49% xfs_log_commit_cil - 30.78% _raw_spin_lock - 30.75% do_raw_spin_lock 30.27% __pv_queued_spin_lock_slowpath (oh, ouch!) .... - 1.05% kmem_alloc_large - 1.02% kmem_alloc 0.94% __kmalloc This overhead here us what this patch is aimed at. After: - 0.76% kmem_alloc_large - 0.75% kmem_alloc 0.70% __kmalloc The size of 512 bytes is based on the bitmap chunk size being 128 bytes and that random directory entry updates almost never require more than 3-4 128 byte regions to be logged in the directory block. The other observation is for per-ag btrees. When we are inserting into a new btree block, we'll pack it from the front. Hence the first few records land in the first 128 bytes so we log only 128 bytes, the next 8-16 records land in the second region so now we log 256 bytes. And so on. If we are doing random updates, it will only allocate every 4 random 128 byte regions that are dirtied instead of every single one. Any larger than 512 bytes and I noticed an increase in memory footprint in my scalability workloads. Any less than this and I didn't really see any significant benefit to CPU usage. Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Chandan Babu R <chandanrlinux@gmail.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Gao Xiang <hsiangkao@redhat.com>
2021-03-23 00:52:03 +08:00
nvecs, &bytes);
offset += BBTOB(bp->b_maps[i].bm_len);
}
xfs: reduce buffer log item shadow allocations When we modify btrees repeatedly, we regularly increase the size of the logged region by a single chunk at a time (per transaction commit). This results in the CIL formatting code having to reallocate the log vector buffer every time the buffer dirty region grows. Hence over a typical 4kB btree buffer, we might grow the log vector 4096/128 = 32x over a short period where we repeatedly add or remove records to/from the buffer over a series of running transaction. This means we are doing 32 memory allocations and frees over this time during a performance critical path in the journal. The amount of space tracked in the CIL for the object is calculated during the ->iop_format() call for the buffer log item, but the buffer memory allocated for it is calculated by the ->iop_size() call. The size callout determines the size of the buffer, the format call determines the space used in the buffer. Hence we can oversize the buffer space required in the size calculation without impacting the amount of space used and accounted to the CIL for the changes being logged. This allows us to reduce the number of allocations by rounding up the buffer size to allow for future growth. This can safe a substantial amount of CPU time in this path: - 46.52% 2.02% [kernel] [k] xfs_log_commit_cil - 44.49% xfs_log_commit_cil - 30.78% _raw_spin_lock - 30.75% do_raw_spin_lock 30.27% __pv_queued_spin_lock_slowpath (oh, ouch!) .... - 1.05% kmem_alloc_large - 1.02% kmem_alloc 0.94% __kmalloc This overhead here us what this patch is aimed at. After: - 0.76% kmem_alloc_large - 0.75% kmem_alloc 0.70% __kmalloc The size of 512 bytes is based on the bitmap chunk size being 128 bytes and that random directory entry updates almost never require more than 3-4 128 byte regions to be logged in the directory block. The other observation is for per-ag btrees. When we are inserting into a new btree block, we'll pack it from the front. Hence the first few records land in the first 128 bytes so we log only 128 bytes, the next 8-16 records land in the second region so now we log 256 bytes. And so on. If we are doing random updates, it will only allocate every 4 random 128 byte regions that are dirtied instead of every single one. Any larger than 512 bytes and I noticed an increase in memory footprint in my scalability workloads. Any less than this and I didn't really see any significant benefit to CPU usage. Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Chandan Babu R <chandanrlinux@gmail.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Gao Xiang <hsiangkao@redhat.com>
2021-03-23 00:52:03 +08:00
/*
* Round up the buffer size required to minimise the number of memory
* allocations that need to be done as this item grows when relogged by
* repeated modifications.
*/
*nbytes = round_up(bytes, 512);
trace_xfs_buf_item_size(bip);
}
static inline void
xfs_buf_item_copy_iovec(
struct xfs_log_vec *lv,
struct xfs_log_iovec **vecp,
struct xfs_buf *bp,
uint offset,
int first_bit,
uint nbits)
{
offset += first_bit * XFS_BLF_CHUNK;
xlog_copy_iovec(lv, vecp, XLOG_REG_TYPE_BCHUNK,
xfs_buf_offset(bp, offset),
nbits * XFS_BLF_CHUNK);
}
static void
xfs_buf_item_format_segment(
struct xfs_buf_log_item *bip,
struct xfs_log_vec *lv,
struct xfs_log_iovec **vecp,
uint offset,
struct xfs_buf_log_format *blfp)
{
struct xfs_buf *bp = bip->bli_buf;
uint base_size;
int first_bit;
int last_bit;
int next_bit;
uint nbits;
/* copy the flags across from the base format item */
blfp->blf_flags = bip->__bli_format.blf_flags;
/*
* Base size is the actual size of the ondisk structure - it reflects
* the actual size of the dirty bitmap rather than the size of the in
* memory structure.
*/
base_size = xfs_buf_log_format_size(blfp);
first_bit = xfs_next_bit(blfp->blf_data_map, blfp->blf_map_size, 0);
if (!(bip->bli_flags & XFS_BLI_STALE) && first_bit == -1) {
/*
* If the map is not be dirty in the transaction, mark
* the size as zero and do not advance the vector pointer.
*/
return;
}
blfp = xlog_copy_iovec(lv, vecp, XLOG_REG_TYPE_BFORMAT, blfp, base_size);
blfp->blf_size = 1;
if (bip->bli_flags & XFS_BLI_STALE) {
/*
* The buffer is stale, so all we need to log
* is the buf log format structure with the
* cancel flag in it.
*/
xfs: event tracing support Convert the old xfs tracing support that could only be used with the out of tree kdb and xfsidbg patches to use the generic event tracer. To use it make sure CONFIG_EVENT_TRACING is enabled and then enable all xfs trace channels by: echo 1 > /sys/kernel/debug/tracing/events/xfs/enable or alternatively enable single events by just doing the same in one event subdirectory, e.g. echo 1 > /sys/kernel/debug/tracing/events/xfs/xfs_ihold/enable or set more complex filters, etc. In Documentation/trace/events.txt all this is desctribed in more detail. To reads the events do a cat /sys/kernel/debug/tracing/trace Compared to the last posting this patch converts the tracing mostly to the one tracepoint per callsite model that other users of the new tracing facility also employ. This allows a very fine-grained control of the tracing, a cleaner output of the traces and also enables the perf tool to use each tracepoint as a virtual performance counter, allowing us to e.g. count how often certain workloads git various spots in XFS. Take a look at http://lwn.net/Articles/346470/ for some examples. Also the btree tracing isn't included at all yet, as it will require additional core tracing features not in mainline yet, I plan to deliver it later. And the really nice thing about this patch is that it actually removes many lines of code while adding this nice functionality: fs/xfs/Makefile | 8 fs/xfs/linux-2.6/xfs_acl.c | 1 fs/xfs/linux-2.6/xfs_aops.c | 52 - fs/xfs/linux-2.6/xfs_aops.h | 2 fs/xfs/linux-2.6/xfs_buf.c | 117 +-- fs/xfs/linux-2.6/xfs_buf.h | 33 fs/xfs/linux-2.6/xfs_fs_subr.c | 3 fs/xfs/linux-2.6/xfs_ioctl.c | 1 fs/xfs/linux-2.6/xfs_ioctl32.c | 1 fs/xfs/linux-2.6/xfs_iops.c | 1 fs/xfs/linux-2.6/xfs_linux.h | 1 fs/xfs/linux-2.6/xfs_lrw.c | 87 -- fs/xfs/linux-2.6/xfs_lrw.h | 45 - fs/xfs/linux-2.6/xfs_super.c | 104 --- fs/xfs/linux-2.6/xfs_super.h | 7 fs/xfs/linux-2.6/xfs_sync.c | 1 fs/xfs/linux-2.6/xfs_trace.c | 75 ++ fs/xfs/linux-2.6/xfs_trace.h | 1369 +++++++++++++++++++++++++++++++++++++++++ fs/xfs/linux-2.6/xfs_vnode.h | 4 fs/xfs/quota/xfs_dquot.c | 110 --- fs/xfs/quota/xfs_dquot.h | 21 fs/xfs/quota/xfs_qm.c | 40 - fs/xfs/quota/xfs_qm_syscalls.c | 4 fs/xfs/support/ktrace.c | 323 --------- fs/xfs/support/ktrace.h | 85 -- fs/xfs/xfs.h | 16 fs/xfs/xfs_ag.h | 14 fs/xfs/xfs_alloc.c | 230 +----- fs/xfs/xfs_alloc.h | 27 fs/xfs/xfs_alloc_btree.c | 1 fs/xfs/xfs_attr.c | 107 --- fs/xfs/xfs_attr.h | 10 fs/xfs/xfs_attr_leaf.c | 14 fs/xfs/xfs_attr_sf.h | 40 - fs/xfs/xfs_bmap.c | 507 +++------------ fs/xfs/xfs_bmap.h | 49 - fs/xfs/xfs_bmap_btree.c | 6 fs/xfs/xfs_btree.c | 5 fs/xfs/xfs_btree_trace.h | 17 fs/xfs/xfs_buf_item.c | 87 -- fs/xfs/xfs_buf_item.h | 20 fs/xfs/xfs_da_btree.c | 3 fs/xfs/xfs_da_btree.h | 7 fs/xfs/xfs_dfrag.c | 2 fs/xfs/xfs_dir2.c | 8 fs/xfs/xfs_dir2_block.c | 20 fs/xfs/xfs_dir2_leaf.c | 21 fs/xfs/xfs_dir2_node.c | 27 fs/xfs/xfs_dir2_sf.c | 26 fs/xfs/xfs_dir2_trace.c | 216 ------ fs/xfs/xfs_dir2_trace.h | 72 -- fs/xfs/xfs_filestream.c | 8 fs/xfs/xfs_fsops.c | 2 fs/xfs/xfs_iget.c | 111 --- fs/xfs/xfs_inode.c | 67 -- fs/xfs/xfs_inode.h | 76 -- fs/xfs/xfs_inode_item.c | 5 fs/xfs/xfs_iomap.c | 85 -- fs/xfs/xfs_iomap.h | 8 fs/xfs/xfs_log.c | 181 +---- fs/xfs/xfs_log_priv.h | 20 fs/xfs/xfs_log_recover.c | 1 fs/xfs/xfs_mount.c | 2 fs/xfs/xfs_quota.h | 8 fs/xfs/xfs_rename.c | 1 fs/xfs/xfs_rtalloc.c | 1 fs/xfs/xfs_rw.c | 3 fs/xfs/xfs_trans.h | 47 + fs/xfs/xfs_trans_buf.c | 62 - fs/xfs/xfs_vnodeops.c | 8 70 files changed, 2151 insertions(+), 2592 deletions(-) Signed-off-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Alex Elder <aelder@sgi.com>
2009-12-15 07:14:59 +08:00
trace_xfs_buf_item_format_stale(bip);
ASSERT(blfp->blf_flags & XFS_BLF_CANCEL);
return;
}
/*
* Fill in an iovec for each set of contiguous chunks.
*/
xfs: optimise xfs_buf_item_size/format for contiguous regions We process the buf_log_item bitmap one set bit at a time with xfs_next_bit() so we can detect if a region crosses a memcpy discontinuity in the buffer data address. This has massive overhead on large buffers (e.g. 64k directory blocks) because we do a lot of unnecessary checks and xfs_buf_offset() calls. For example, 16-way concurrent create workload on debug kernel running CPU bound has this at the top of the profile at ~120k create/s on 64kb directory block size: 20.66% [kernel] [k] xfs_dir3_leaf_check_int 7.10% [kernel] [k] memcpy 6.22% [kernel] [k] xfs_next_bit 3.55% [kernel] [k] xfs_buf_offset 3.53% [kernel] [k] xfs_buf_item_format 3.34% [kernel] [k] __pv_queued_spin_lock_slowpath 3.04% [kernel] [k] do_raw_spin_lock 2.84% [kernel] [k] xfs_buf_item_size_segment.isra.0 2.31% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.36% [kernel] [k] xfs_log_commit_cil (debug checks hurt large blocks) The only buffers with discontinuities in the data address are unmapped buffers, and they are only used for inode cluster buffers and only for logging unlinked pointers. IOWs, it is -rare- that we even need to detect a discontinuity in the buffer item formatting code. Optimise all this by using xfs_contig_bits() to find the size of the contiguous regions, then test for a discontiunity inside it. If we find one, do the slow "bit at a time" method we do now. If we don't, then just copy the entire contiguous range in one go. Profile now looks like: 25.26% [kernel] [k] xfs_dir3_leaf_check_int 9.25% [kernel] [k] memcpy 5.01% [kernel] [k] __pv_queued_spin_lock_slowpath 2.84% [kernel] [k] do_raw_spin_lock 2.22% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.88% [kernel] [k] xfs_buf_find 1.53% [kernel] [k] memmove 1.47% [kernel] [k] xfs_log_commit_cil .... 0.34% [kernel] [k] xfs_buf_item_format .... 0.21% [kernel] [k] xfs_buf_offset .... 0.16% [kernel] [k] xfs_contig_bits .... 0.13% [kernel] [k] xfs_buf_item_size_segment.isra.0 So the bit scanning over for the dirty region tracking for the buffer log items is basically gone. Debug overhead hurts even more now... Perf comparison dir block creates unlink size (kb) time rate time Original 4 4m08s 220k 5m13s Original 64 7m21s 115k 13m25s Patched 4 3m59s 230k 5m03s Patched 64 6m23s 143k 12m33s Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-03-23 00:52:04 +08:00
do {
ASSERT(first_bit >= 0);
nbits = xfs_contig_bits(blfp->blf_data_map,
blfp->blf_map_size, first_bit);
ASSERT(nbits > 0);
/*
* Straddling a page is rare because we don't log contiguous
* chunks of unmapped buffers anywhere.
*/
if (nbits > 1 &&
xfs_buf_item_straddle(bp, offset, first_bit, nbits))
goto slow_scan;
xfs_buf_item_copy_iovec(lv, vecp, bp, offset,
first_bit, nbits);
blfp->blf_size++;
/*
* This takes the bit number to start looking from and
* returns the next set bit from there. It returns -1
* if there are no more bits set or the start bit is
* beyond the end of the bitmap.
*/
first_bit = xfs_next_bit(blfp->blf_data_map, blfp->blf_map_size,
(uint)first_bit + nbits + 1);
} while (first_bit != -1);
return;
slow_scan:
ASSERT(bp->b_addr == NULL);
last_bit = first_bit;
nbits = 1;
for (;;) {
/*
* This takes the bit number to start looking from and
* returns the next set bit from there. It returns -1
* if there are no more bits set or the start bit is
* beyond the end of the bitmap.
*/
next_bit = xfs_next_bit(blfp->blf_data_map, blfp->blf_map_size,
(uint)last_bit + 1);
/*
* If we run out of bits fill in the last iovec and get out of
* the loop. Else if we start a new set of bits then fill in
* the iovec for the series we were looking at and start
* counting the bits in the new one. Else we're still in the
* same set of bits so just keep counting and scanning.
*/
if (next_bit == -1) {
xfs_buf_item_copy_iovec(lv, vecp, bp, offset,
first_bit, nbits);
blfp->blf_size++;
break;
} else if (next_bit != last_bit + 1 ||
xfs: optimise xfs_buf_item_size/format for contiguous regions We process the buf_log_item bitmap one set bit at a time with xfs_next_bit() so we can detect if a region crosses a memcpy discontinuity in the buffer data address. This has massive overhead on large buffers (e.g. 64k directory blocks) because we do a lot of unnecessary checks and xfs_buf_offset() calls. For example, 16-way concurrent create workload on debug kernel running CPU bound has this at the top of the profile at ~120k create/s on 64kb directory block size: 20.66% [kernel] [k] xfs_dir3_leaf_check_int 7.10% [kernel] [k] memcpy 6.22% [kernel] [k] xfs_next_bit 3.55% [kernel] [k] xfs_buf_offset 3.53% [kernel] [k] xfs_buf_item_format 3.34% [kernel] [k] __pv_queued_spin_lock_slowpath 3.04% [kernel] [k] do_raw_spin_lock 2.84% [kernel] [k] xfs_buf_item_size_segment.isra.0 2.31% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.36% [kernel] [k] xfs_log_commit_cil (debug checks hurt large blocks) The only buffers with discontinuities in the data address are unmapped buffers, and they are only used for inode cluster buffers and only for logging unlinked pointers. IOWs, it is -rare- that we even need to detect a discontinuity in the buffer item formatting code. Optimise all this by using xfs_contig_bits() to find the size of the contiguous regions, then test for a discontiunity inside it. If we find one, do the slow "bit at a time" method we do now. If we don't, then just copy the entire contiguous range in one go. Profile now looks like: 25.26% [kernel] [k] xfs_dir3_leaf_check_int 9.25% [kernel] [k] memcpy 5.01% [kernel] [k] __pv_queued_spin_lock_slowpath 2.84% [kernel] [k] do_raw_spin_lock 2.22% [kernel] [k] __raw_callee_save___pv_queued_spin_unlock 1.88% [kernel] [k] xfs_buf_find 1.53% [kernel] [k] memmove 1.47% [kernel] [k] xfs_log_commit_cil .... 0.34% [kernel] [k] xfs_buf_item_format .... 0.21% [kernel] [k] xfs_buf_offset .... 0.16% [kernel] [k] xfs_contig_bits .... 0.13% [kernel] [k] xfs_buf_item_size_segment.isra.0 So the bit scanning over for the dirty region tracking for the buffer log items is basically gone. Debug overhead hurts even more now... Perf comparison dir block creates unlink size (kb) time rate time Original 4 4m08s 220k 5m13s Original 64 7m21s 115k 13m25s Patched 4 3m59s 230k 5m03s Patched 64 6m23s 143k 12m33s Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-03-23 00:52:04 +08:00
xfs_buf_item_straddle(bp, offset, first_bit, nbits)) {
xfs_buf_item_copy_iovec(lv, vecp, bp, offset,
first_bit, nbits);
blfp->blf_size++;
first_bit = next_bit;
last_bit = next_bit;
nbits = 1;
} else {
last_bit++;
nbits++;
}
}
}
/*
* This is called to fill in the vector of log iovecs for the
* given log buf item. It fills the first entry with a buf log
* format structure, and the rest point to contiguous chunks
* within the buffer.
*/
STATIC void
xfs_buf_item_format(
struct xfs_log_item *lip,
struct xfs_log_vec *lv)
{
struct xfs_buf_log_item *bip = BUF_ITEM(lip);
struct xfs_buf *bp = bip->bli_buf;
struct xfs_log_iovec *vecp = NULL;
uint offset = 0;
int i;
ASSERT(atomic_read(&bip->bli_refcount) > 0);
ASSERT((bip->bli_flags & XFS_BLI_LOGGED) ||
(bip->bli_flags & XFS_BLI_STALE));
ASSERT((bip->bli_flags & XFS_BLI_STALE) ||
(xfs_blft_from_flags(&bip->__bli_format) > XFS_BLFT_UNKNOWN_BUF
&& xfs_blft_from_flags(&bip->__bli_format) < XFS_BLFT_MAX_BUF));
ASSERT(!(bip->bli_flags & XFS_BLI_ORDERED) ||
(bip->bli_flags & XFS_BLI_STALE));
/*
* If it is an inode buffer, transfer the in-memory state to the
* format flags and clear the in-memory state.
*
* For buffer based inode allocation, we do not transfer
* this state if the inode buffer allocation has not yet been committed
* to the log as setting the XFS_BLI_INODE_BUF flag will prevent
* correct replay of the inode allocation.
*
* For icreate item based inode allocation, the buffers aren't written
* to the journal during allocation, and hence we should always tag the
* buffer as an inode buffer so that the correct unlinked list replay
* occurs during recovery.
*/
if (bip->bli_flags & XFS_BLI_INODE_BUF) {
if (xfs_has_v3inodes(lip->li_log->l_mp) ||
!((bip->bli_flags & XFS_BLI_INODE_ALLOC_BUF) &&
xfs_log_item_in_current_chkpt(lip)))
bip->__bli_format.blf_flags |= XFS_BLF_INODE_BUF;
bip->bli_flags &= ~XFS_BLI_INODE_BUF;
}
for (i = 0; i < bip->bli_format_count; i++) {
xfs_buf_item_format_segment(bip, lv, &vecp, offset,
&bip->bli_formats[i]);
xfs: fix broken multi-fsb buffer logging Multi-block buffers are logged based on buffer offset in xfs_trans_log_buf(). xfs_buf_item_log() ultimately walks each mapping in the buffer and marks the associated range to be logged in the xfs_buf_log_format bitmap for that mapping. This code is broken, however, in that it marks the actual buffer offsets of the associated range in each bitmap rather than shifting to the byte range for that particular mapping. For example, on a 4k fsb fs, buffer offset 4096 refers to the first byte of the second mapping in the buffer. This means byte 0 of the second log format bitmap should be tagged as dirty. Instead, the current code marks byte offset 4096 of the second log format bitmap, which is invalid and potentially out of range of the mapping. As a result of this, the log item format code invoked at transaction commit time is not be able to correctly identify what parts of the buffer to copy into log vectors. This can lead to NULL log vector pointer dereferences in CIL push context if the item format code was not able to locate any dirty ranges at all. This crash has been reproduced on a 4k FSB filesystem using 16k directory blocks where an unlink operation happened not to log anything in the first block of the mapping. The logged offsets were all over 4k, marked as such in the subsequent log format mappings, and thus left the transaction with an xfs_log_item that is marked DIRTY but without any logged regions. Further, even when the logged regions are marked correctly in the buffer log format bitmaps, the format code doesn't copy the correct ranges of the buffer into the log. This means that any logged region beyond the first block of a multi-block buffer is subject to corruption after a crash and log recovery sequence. This is due to a failure to convert the mapping bm_len field from basic blocks to bytes in the buffer offset tracking code in xfs_buf_item_format(). Update xfs_buf_item_log() to convert buffer offsets to segment relative offsets when logging multi-block buffers. This ensures that the modified regions of a buffer are logged correctly and avoids the aforementioned crash. Also update xfs_buf_item_format() to correctly track the source offset into the buffer for the log vector formatting code. This ensures that the correct data is copied into the log. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Eric Sandeen <sandeen@redhat.com> Reviewed-by: Dave Chinner <dchinner@redhat.com> Signed-off-by: Dave Chinner <david@fromorbit.com>
2016-06-01 15:38:12 +08:00
offset += BBTOB(bp->b_maps[i].bm_len);
}
/*
* Check to make sure everything is consistent.
*/
xfs: event tracing support Convert the old xfs tracing support that could only be used with the out of tree kdb and xfsidbg patches to use the generic event tracer. To use it make sure CONFIG_EVENT_TRACING is enabled and then enable all xfs trace channels by: echo 1 > /sys/kernel/debug/tracing/events/xfs/enable or alternatively enable single events by just doing the same in one event subdirectory, e.g. echo 1 > /sys/kernel/debug/tracing/events/xfs/xfs_ihold/enable or set more complex filters, etc. In Documentation/trace/events.txt all this is desctribed in more detail. To reads the events do a cat /sys/kernel/debug/tracing/trace Compared to the last posting this patch converts the tracing mostly to the one tracepoint per callsite model that other users of the new tracing facility also employ. This allows a very fine-grained control of the tracing, a cleaner output of the traces and also enables the perf tool to use each tracepoint as a virtual performance counter, allowing us to e.g. count how often certain workloads git various spots in XFS. Take a look at http://lwn.net/Articles/346470/ for some examples. Also the btree tracing isn't included at all yet, as it will require additional core tracing features not in mainline yet, I plan to deliver it later. And the really nice thing about this patch is that it actually removes many lines of code while adding this nice functionality: fs/xfs/Makefile | 8 fs/xfs/linux-2.6/xfs_acl.c | 1 fs/xfs/linux-2.6/xfs_aops.c | 52 - fs/xfs/linux-2.6/xfs_aops.h | 2 fs/xfs/linux-2.6/xfs_buf.c | 117 +-- fs/xfs/linux-2.6/xfs_buf.h | 33 fs/xfs/linux-2.6/xfs_fs_subr.c | 3 fs/xfs/linux-2.6/xfs_ioctl.c | 1 fs/xfs/linux-2.6/xfs_ioctl32.c | 1 fs/xfs/linux-2.6/xfs_iops.c | 1 fs/xfs/linux-2.6/xfs_linux.h | 1 fs/xfs/linux-2.6/xfs_lrw.c | 87 -- fs/xfs/linux-2.6/xfs_lrw.h | 45 - fs/xfs/linux-2.6/xfs_super.c | 104 --- fs/xfs/linux-2.6/xfs_super.h | 7 fs/xfs/linux-2.6/xfs_sync.c | 1 fs/xfs/linux-2.6/xfs_trace.c | 75 ++ fs/xfs/linux-2.6/xfs_trace.h | 1369 +++++++++++++++++++++++++++++++++++++++++ fs/xfs/linux-2.6/xfs_vnode.h | 4 fs/xfs/quota/xfs_dquot.c | 110 --- fs/xfs/quota/xfs_dquot.h | 21 fs/xfs/quota/xfs_qm.c | 40 - fs/xfs/quota/xfs_qm_syscalls.c | 4 fs/xfs/support/ktrace.c | 323 --------- fs/xfs/support/ktrace.h | 85 -- fs/xfs/xfs.h | 16 fs/xfs/xfs_ag.h | 14 fs/xfs/xfs_alloc.c | 230 +----- fs/xfs/xfs_alloc.h | 27 fs/xfs/xfs_alloc_btree.c | 1 fs/xfs/xfs_attr.c | 107 --- fs/xfs/xfs_attr.h | 10 fs/xfs/xfs_attr_leaf.c | 14 fs/xfs/xfs_attr_sf.h | 40 - fs/xfs/xfs_bmap.c | 507 +++------------ fs/xfs/xfs_bmap.h | 49 - fs/xfs/xfs_bmap_btree.c | 6 fs/xfs/xfs_btree.c | 5 fs/xfs/xfs_btree_trace.h | 17 fs/xfs/xfs_buf_item.c | 87 -- fs/xfs/xfs_buf_item.h | 20 fs/xfs/xfs_da_btree.c | 3 fs/xfs/xfs_da_btree.h | 7 fs/xfs/xfs_dfrag.c | 2 fs/xfs/xfs_dir2.c | 8 fs/xfs/xfs_dir2_block.c | 20 fs/xfs/xfs_dir2_leaf.c | 21 fs/xfs/xfs_dir2_node.c | 27 fs/xfs/xfs_dir2_sf.c | 26 fs/xfs/xfs_dir2_trace.c | 216 ------ fs/xfs/xfs_dir2_trace.h | 72 -- fs/xfs/xfs_filestream.c | 8 fs/xfs/xfs_fsops.c | 2 fs/xfs/xfs_iget.c | 111 --- fs/xfs/xfs_inode.c | 67 -- fs/xfs/xfs_inode.h | 76 -- fs/xfs/xfs_inode_item.c | 5 fs/xfs/xfs_iomap.c | 85 -- fs/xfs/xfs_iomap.h | 8 fs/xfs/xfs_log.c | 181 +---- fs/xfs/xfs_log_priv.h | 20 fs/xfs/xfs_log_recover.c | 1 fs/xfs/xfs_mount.c | 2 fs/xfs/xfs_quota.h | 8 fs/xfs/xfs_rename.c | 1 fs/xfs/xfs_rtalloc.c | 1 fs/xfs/xfs_rw.c | 3 fs/xfs/xfs_trans.h | 47 + fs/xfs/xfs_trans_buf.c | 62 - fs/xfs/xfs_vnodeops.c | 8 70 files changed, 2151 insertions(+), 2592 deletions(-) Signed-off-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Alex Elder <aelder@sgi.com>
2009-12-15 07:14:59 +08:00
trace_xfs_buf_item_format(bip);
}
/*
* This is called to pin the buffer associated with the buf log item in memory
* so it cannot be written out.
*
* We also always take a reference to the buffer log item here so that the bli
* is held while the item is pinned in memory. This means that we can
* unconditionally drop the reference count a transaction holds when the
* transaction is completed.
*/
STATIC void
xfs_buf_item_pin(
struct xfs_log_item *lip)
{
struct xfs_buf_log_item *bip = BUF_ITEM(lip);
ASSERT(atomic_read(&bip->bli_refcount) > 0);
ASSERT((bip->bli_flags & XFS_BLI_LOGGED) ||
(bip->bli_flags & XFS_BLI_ORDERED) ||
(bip->bli_flags & XFS_BLI_STALE));
xfs: event tracing support Convert the old xfs tracing support that could only be used with the out of tree kdb and xfsidbg patches to use the generic event tracer. To use it make sure CONFIG_EVENT_TRACING is enabled and then enable all xfs trace channels by: echo 1 > /sys/kernel/debug/tracing/events/xfs/enable or alternatively enable single events by just doing the same in one event subdirectory, e.g. echo 1 > /sys/kernel/debug/tracing/events/xfs/xfs_ihold/enable or set more complex filters, etc. In Documentation/trace/events.txt all this is desctribed in more detail. To reads the events do a cat /sys/kernel/debug/tracing/trace Compared to the last posting this patch converts the tracing mostly to the one tracepoint per callsite model that other users of the new tracing facility also employ. This allows a very fine-grained control of the tracing, a cleaner output of the traces and also enables the perf tool to use each tracepoint as a virtual performance counter, allowing us to e.g. count how often certain workloads git various spots in XFS. Take a look at http://lwn.net/Articles/346470/ for some examples. Also the btree tracing isn't included at all yet, as it will require additional core tracing features not in mainline yet, I plan to deliver it later. And the really nice thing about this patch is that it actually removes many lines of code while adding this nice functionality: fs/xfs/Makefile | 8 fs/xfs/linux-2.6/xfs_acl.c | 1 fs/xfs/linux-2.6/xfs_aops.c | 52 - fs/xfs/linux-2.6/xfs_aops.h | 2 fs/xfs/linux-2.6/xfs_buf.c | 117 +-- fs/xfs/linux-2.6/xfs_buf.h | 33 fs/xfs/linux-2.6/xfs_fs_subr.c | 3 fs/xfs/linux-2.6/xfs_ioctl.c | 1 fs/xfs/linux-2.6/xfs_ioctl32.c | 1 fs/xfs/linux-2.6/xfs_iops.c | 1 fs/xfs/linux-2.6/xfs_linux.h | 1 fs/xfs/linux-2.6/xfs_lrw.c | 87 -- fs/xfs/linux-2.6/xfs_lrw.h | 45 - fs/xfs/linux-2.6/xfs_super.c | 104 --- fs/xfs/linux-2.6/xfs_super.h | 7 fs/xfs/linux-2.6/xfs_sync.c | 1 fs/xfs/linux-2.6/xfs_trace.c | 75 ++ fs/xfs/linux-2.6/xfs_trace.h | 1369 +++++++++++++++++++++++++++++++++++++++++ fs/xfs/linux-2.6/xfs_vnode.h | 4 fs/xfs/quota/xfs_dquot.c | 110 --- fs/xfs/quota/xfs_dquot.h | 21 fs/xfs/quota/xfs_qm.c | 40 - fs/xfs/quota/xfs_qm_syscalls.c | 4 fs/xfs/support/ktrace.c | 323 --------- fs/xfs/support/ktrace.h | 85 -- fs/xfs/xfs.h | 16 fs/xfs/xfs_ag.h | 14 fs/xfs/xfs_alloc.c | 230 +----- fs/xfs/xfs_alloc.h | 27 fs/xfs/xfs_alloc_btree.c | 1 fs/xfs/xfs_attr.c | 107 --- fs/xfs/xfs_attr.h | 10 fs/xfs/xfs_attr_leaf.c | 14 fs/xfs/xfs_attr_sf.h | 40 - fs/xfs/xfs_bmap.c | 507 +++------------ fs/xfs/xfs_bmap.h | 49 - fs/xfs/xfs_bmap_btree.c | 6 fs/xfs/xfs_btree.c | 5 fs/xfs/xfs_btree_trace.h | 17 fs/xfs/xfs_buf_item.c | 87 -- fs/xfs/xfs_buf_item.h | 20 fs/xfs/xfs_da_btree.c | 3 fs/xfs/xfs_da_btree.h | 7 fs/xfs/xfs_dfrag.c | 2 fs/xfs/xfs_dir2.c | 8 fs/xfs/xfs_dir2_block.c | 20 fs/xfs/xfs_dir2_leaf.c | 21 fs/xfs/xfs_dir2_node.c | 27 fs/xfs/xfs_dir2_sf.c | 26 fs/xfs/xfs_dir2_trace.c | 216 ------ fs/xfs/xfs_dir2_trace.h | 72 -- fs/xfs/xfs_filestream.c | 8 fs/xfs/xfs_fsops.c | 2 fs/xfs/xfs_iget.c | 111 --- fs/xfs/xfs_inode.c | 67 -- fs/xfs/xfs_inode.h | 76 -- fs/xfs/xfs_inode_item.c | 5 fs/xfs/xfs_iomap.c | 85 -- fs/xfs/xfs_iomap.h | 8 fs/xfs/xfs_log.c | 181 +---- fs/xfs/xfs_log_priv.h | 20 fs/xfs/xfs_log_recover.c | 1 fs/xfs/xfs_mount.c | 2 fs/xfs/xfs_quota.h | 8 fs/xfs/xfs_rename.c | 1 fs/xfs/xfs_rtalloc.c | 1 fs/xfs/xfs_rw.c | 3 fs/xfs/xfs_trans.h | 47 + fs/xfs/xfs_trans_buf.c | 62 - fs/xfs/xfs_vnodeops.c | 8 70 files changed, 2151 insertions(+), 2592 deletions(-) Signed-off-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Alex Elder <aelder@sgi.com>
2009-12-15 07:14:59 +08:00
trace_xfs_buf_item_pin(bip);
atomic_inc(&bip->bli_refcount);
atomic_inc(&bip->bli_buf->b_pin_count);
}
/*
xfs: hold buffer across unpin and potential shutdown processing The special processing used to simulate a buffer I/O failure on fs shutdown has a difficult to reproduce race that can result in a use after free of the associated buffer. Consider a buffer that has been committed to the on-disk log and thus is AIL resident. The buffer lands on the writeback delwri queue, but is subsequently locked, committed and pinned by another transaction before submitted for I/O. At this point, the buffer is stuck on the delwri queue as it cannot be submitted for I/O until it is unpinned. A log checkpoint I/O failure occurs sometime later, which aborts the bli. The unpin handler is called with the aborted log item, drops the bli reference count, the pin count, and falls into the I/O failure simulation path. The potential problem here is that once the pin count falls to zero in ->iop_unpin(), xfsaild is free to retry delwri submission of the buffer at any time, before the unpin handler even completes. If delwri queue submission wins the race to the buffer lock, it observes the shutdown state and simulates the I/O failure itself. This releases both the bli and delwri queue holds and frees the buffer while xfs_buf_item_unpin() sits on xfs_buf_lock() waiting to run through the same failure sequence. This problem is rare and requires many iterations of fstest generic/019 (which simulates disk I/O failures) to reproduce. To avoid this problem, grab a hold on the buffer before the log item is unpinned if the associated item has been aborted and will require a simulated I/O failure. The hold is already required for the simulated I/O failure, so the ordering simply guarantees the unpin handler access to the buffer before it is unpinned and thus processed by the AIL. This particular ordering is required so long as the AIL does not acquire a reference on the bli, which is the long term solution to this problem. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-06-22 00:43:14 +08:00
* This is called to unpin the buffer associated with the buf log item which
* was previously pinned with a call to xfs_buf_item_pin().
*/
STATIC void
xfs_buf_item_unpin(
struct xfs_log_item *lip,
int remove)
{
struct xfs_buf_log_item *bip = BUF_ITEM(lip);
struct xfs_buf *bp = bip->bli_buf;
int stale = bip->bli_flags & XFS_BLI_STALE;
int freed;
ASSERT(bp->b_log_item == bip);
ASSERT(atomic_read(&bip->bli_refcount) > 0);
xfs: event tracing support Convert the old xfs tracing support that could only be used with the out of tree kdb and xfsidbg patches to use the generic event tracer. To use it make sure CONFIG_EVENT_TRACING is enabled and then enable all xfs trace channels by: echo 1 > /sys/kernel/debug/tracing/events/xfs/enable or alternatively enable single events by just doing the same in one event subdirectory, e.g. echo 1 > /sys/kernel/debug/tracing/events/xfs/xfs_ihold/enable or set more complex filters, etc. In Documentation/trace/events.txt all this is desctribed in more detail. To reads the events do a cat /sys/kernel/debug/tracing/trace Compared to the last posting this patch converts the tracing mostly to the one tracepoint per callsite model that other users of the new tracing facility also employ. This allows a very fine-grained control of the tracing, a cleaner output of the traces and also enables the perf tool to use each tracepoint as a virtual performance counter, allowing us to e.g. count how often certain workloads git various spots in XFS. Take a look at http://lwn.net/Articles/346470/ for some examples. Also the btree tracing isn't included at all yet, as it will require additional core tracing features not in mainline yet, I plan to deliver it later. And the really nice thing about this patch is that it actually removes many lines of code while adding this nice functionality: fs/xfs/Makefile | 8 fs/xfs/linux-2.6/xfs_acl.c | 1 fs/xfs/linux-2.6/xfs_aops.c | 52 - fs/xfs/linux-2.6/xfs_aops.h | 2 fs/xfs/linux-2.6/xfs_buf.c | 117 +-- fs/xfs/linux-2.6/xfs_buf.h | 33 fs/xfs/linux-2.6/xfs_fs_subr.c | 3 fs/xfs/linux-2.6/xfs_ioctl.c | 1 fs/xfs/linux-2.6/xfs_ioctl32.c | 1 fs/xfs/linux-2.6/xfs_iops.c | 1 fs/xfs/linux-2.6/xfs_linux.h | 1 fs/xfs/linux-2.6/xfs_lrw.c | 87 -- fs/xfs/linux-2.6/xfs_lrw.h | 45 - fs/xfs/linux-2.6/xfs_super.c | 104 --- fs/xfs/linux-2.6/xfs_super.h | 7 fs/xfs/linux-2.6/xfs_sync.c | 1 fs/xfs/linux-2.6/xfs_trace.c | 75 ++ fs/xfs/linux-2.6/xfs_trace.h | 1369 +++++++++++++++++++++++++++++++++++++++++ fs/xfs/linux-2.6/xfs_vnode.h | 4 fs/xfs/quota/xfs_dquot.c | 110 --- fs/xfs/quota/xfs_dquot.h | 21 fs/xfs/quota/xfs_qm.c | 40 - fs/xfs/quota/xfs_qm_syscalls.c | 4 fs/xfs/support/ktrace.c | 323 --------- fs/xfs/support/ktrace.h | 85 -- fs/xfs/xfs.h | 16 fs/xfs/xfs_ag.h | 14 fs/xfs/xfs_alloc.c | 230 +----- fs/xfs/xfs_alloc.h | 27 fs/xfs/xfs_alloc_btree.c | 1 fs/xfs/xfs_attr.c | 107 --- fs/xfs/xfs_attr.h | 10 fs/xfs/xfs_attr_leaf.c | 14 fs/xfs/xfs_attr_sf.h | 40 - fs/xfs/xfs_bmap.c | 507 +++------------ fs/xfs/xfs_bmap.h | 49 - fs/xfs/xfs_bmap_btree.c | 6 fs/xfs/xfs_btree.c | 5 fs/xfs/xfs_btree_trace.h | 17 fs/xfs/xfs_buf_item.c | 87 -- fs/xfs/xfs_buf_item.h | 20 fs/xfs/xfs_da_btree.c | 3 fs/xfs/xfs_da_btree.h | 7 fs/xfs/xfs_dfrag.c | 2 fs/xfs/xfs_dir2.c | 8 fs/xfs/xfs_dir2_block.c | 20 fs/xfs/xfs_dir2_leaf.c | 21 fs/xfs/xfs_dir2_node.c | 27 fs/xfs/xfs_dir2_sf.c | 26 fs/xfs/xfs_dir2_trace.c | 216 ------ fs/xfs/xfs_dir2_trace.h | 72 -- fs/xfs/xfs_filestream.c | 8 fs/xfs/xfs_fsops.c | 2 fs/xfs/xfs_iget.c | 111 --- fs/xfs/xfs_inode.c | 67 -- fs/xfs/xfs_inode.h | 76 -- fs/xfs/xfs_inode_item.c | 5 fs/xfs/xfs_iomap.c | 85 -- fs/xfs/xfs_iomap.h | 8 fs/xfs/xfs_log.c | 181 +---- fs/xfs/xfs_log_priv.h | 20 fs/xfs/xfs_log_recover.c | 1 fs/xfs/xfs_mount.c | 2 fs/xfs/xfs_quota.h | 8 fs/xfs/xfs_rename.c | 1 fs/xfs/xfs_rtalloc.c | 1 fs/xfs/xfs_rw.c | 3 fs/xfs/xfs_trans.h | 47 + fs/xfs/xfs_trans_buf.c | 62 - fs/xfs/xfs_vnodeops.c | 8 70 files changed, 2151 insertions(+), 2592 deletions(-) Signed-off-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Alex Elder <aelder@sgi.com>
2009-12-15 07:14:59 +08:00
trace_xfs_buf_item_unpin(bip);
xfs: hold buffer across unpin and potential shutdown processing The special processing used to simulate a buffer I/O failure on fs shutdown has a difficult to reproduce race that can result in a use after free of the associated buffer. Consider a buffer that has been committed to the on-disk log and thus is AIL resident. The buffer lands on the writeback delwri queue, but is subsequently locked, committed and pinned by another transaction before submitted for I/O. At this point, the buffer is stuck on the delwri queue as it cannot be submitted for I/O until it is unpinned. A log checkpoint I/O failure occurs sometime later, which aborts the bli. The unpin handler is called with the aborted log item, drops the bli reference count, the pin count, and falls into the I/O failure simulation path. The potential problem here is that once the pin count falls to zero in ->iop_unpin(), xfsaild is free to retry delwri submission of the buffer at any time, before the unpin handler even completes. If delwri queue submission wins the race to the buffer lock, it observes the shutdown state and simulates the I/O failure itself. This releases both the bli and delwri queue holds and frees the buffer while xfs_buf_item_unpin() sits on xfs_buf_lock() waiting to run through the same failure sequence. This problem is rare and requires many iterations of fstest generic/019 (which simulates disk I/O failures) to reproduce. To avoid this problem, grab a hold on the buffer before the log item is unpinned if the associated item has been aborted and will require a simulated I/O failure. The hold is already required for the simulated I/O failure, so the ordering simply guarantees the unpin handler access to the buffer before it is unpinned and thus processed by the AIL. This particular ordering is required so long as the AIL does not acquire a reference on the bli, which is the long term solution to this problem. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-06-22 00:43:14 +08:00
/*
* Drop the bli ref associated with the pin and grab the hold required
* for the I/O simulation failure in the abort case. We have to do this
* before the pin count drops because the AIL doesn't acquire a bli
* reference. Therefore if the refcount drops to zero, the bli could
* still be AIL resident and the buffer submitted for I/O (and freed on
* completion) at any point before we return. This can be removed once
* the AIL properly holds a reference on the bli.
*/
freed = atomic_dec_and_test(&bip->bli_refcount);
xfs: hold buffer across unpin and potential shutdown processing The special processing used to simulate a buffer I/O failure on fs shutdown has a difficult to reproduce race that can result in a use after free of the associated buffer. Consider a buffer that has been committed to the on-disk log and thus is AIL resident. The buffer lands on the writeback delwri queue, but is subsequently locked, committed and pinned by another transaction before submitted for I/O. At this point, the buffer is stuck on the delwri queue as it cannot be submitted for I/O until it is unpinned. A log checkpoint I/O failure occurs sometime later, which aborts the bli. The unpin handler is called with the aborted log item, drops the bli reference count, the pin count, and falls into the I/O failure simulation path. The potential problem here is that once the pin count falls to zero in ->iop_unpin(), xfsaild is free to retry delwri submission of the buffer at any time, before the unpin handler even completes. If delwri queue submission wins the race to the buffer lock, it observes the shutdown state and simulates the I/O failure itself. This releases both the bli and delwri queue holds and frees the buffer while xfs_buf_item_unpin() sits on xfs_buf_lock() waiting to run through the same failure sequence. This problem is rare and requires many iterations of fstest generic/019 (which simulates disk I/O failures) to reproduce. To avoid this problem, grab a hold on the buffer before the log item is unpinned if the associated item has been aborted and will require a simulated I/O failure. The hold is already required for the simulated I/O failure, so the ordering simply guarantees the unpin handler access to the buffer before it is unpinned and thus processed by the AIL. This particular ordering is required so long as the AIL does not acquire a reference on the bli, which is the long term solution to this problem. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-06-22 00:43:14 +08:00
if (freed && !stale && remove)
xfs_buf_hold(bp);
if (atomic_dec_and_test(&bp->b_pin_count))
wake_up_all(&bp->b_waiters);
xfs: hold buffer across unpin and potential shutdown processing The special processing used to simulate a buffer I/O failure on fs shutdown has a difficult to reproduce race that can result in a use after free of the associated buffer. Consider a buffer that has been committed to the on-disk log and thus is AIL resident. The buffer lands on the writeback delwri queue, but is subsequently locked, committed and pinned by another transaction before submitted for I/O. At this point, the buffer is stuck on the delwri queue as it cannot be submitted for I/O until it is unpinned. A log checkpoint I/O failure occurs sometime later, which aborts the bli. The unpin handler is called with the aborted log item, drops the bli reference count, the pin count, and falls into the I/O failure simulation path. The potential problem here is that once the pin count falls to zero in ->iop_unpin(), xfsaild is free to retry delwri submission of the buffer at any time, before the unpin handler even completes. If delwri queue submission wins the race to the buffer lock, it observes the shutdown state and simulates the I/O failure itself. This releases both the bli and delwri queue holds and frees the buffer while xfs_buf_item_unpin() sits on xfs_buf_lock() waiting to run through the same failure sequence. This problem is rare and requires many iterations of fstest generic/019 (which simulates disk I/O failures) to reproduce. To avoid this problem, grab a hold on the buffer before the log item is unpinned if the associated item has been aborted and will require a simulated I/O failure. The hold is already required for the simulated I/O failure, so the ordering simply guarantees the unpin handler access to the buffer before it is unpinned and thus processed by the AIL. This particular ordering is required so long as the AIL does not acquire a reference on the bli, which is the long term solution to this problem. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-06-22 00:43:14 +08:00
/* nothing to do but drop the pin count if the bli is active */
if (!freed)
return;
if (stale) {
ASSERT(bip->bli_flags & XFS_BLI_STALE);
ASSERT(xfs_buf_islocked(bp));
ASSERT(bp->b_flags & XBF_STALE);
ASSERT(bip->__bli_format.blf_flags & XFS_BLF_CANCEL);
ASSERT(list_empty(&lip->li_trans));
ASSERT(!bp->b_transp);
xfs: event tracing support Convert the old xfs tracing support that could only be used with the out of tree kdb and xfsidbg patches to use the generic event tracer. To use it make sure CONFIG_EVENT_TRACING is enabled and then enable all xfs trace channels by: echo 1 > /sys/kernel/debug/tracing/events/xfs/enable or alternatively enable single events by just doing the same in one event subdirectory, e.g. echo 1 > /sys/kernel/debug/tracing/events/xfs/xfs_ihold/enable or set more complex filters, etc. In Documentation/trace/events.txt all this is desctribed in more detail. To reads the events do a cat /sys/kernel/debug/tracing/trace Compared to the last posting this patch converts the tracing mostly to the one tracepoint per callsite model that other users of the new tracing facility also employ. This allows a very fine-grained control of the tracing, a cleaner output of the traces and also enables the perf tool to use each tracepoint as a virtual performance counter, allowing us to e.g. count how often certain workloads git various spots in XFS. Take a look at http://lwn.net/Articles/346470/ for some examples. Also the btree tracing isn't included at all yet, as it will require additional core tracing features not in mainline yet, I plan to deliver it later. And the really nice thing about this patch is that it actually removes many lines of code while adding this nice functionality: fs/xfs/Makefile | 8 fs/xfs/linux-2.6/xfs_acl.c | 1 fs/xfs/linux-2.6/xfs_aops.c | 52 - fs/xfs/linux-2.6/xfs_aops.h | 2 fs/xfs/linux-2.6/xfs_buf.c | 117 +-- fs/xfs/linux-2.6/xfs_buf.h | 33 fs/xfs/linux-2.6/xfs_fs_subr.c | 3 fs/xfs/linux-2.6/xfs_ioctl.c | 1 fs/xfs/linux-2.6/xfs_ioctl32.c | 1 fs/xfs/linux-2.6/xfs_iops.c | 1 fs/xfs/linux-2.6/xfs_linux.h | 1 fs/xfs/linux-2.6/xfs_lrw.c | 87 -- fs/xfs/linux-2.6/xfs_lrw.h | 45 - fs/xfs/linux-2.6/xfs_super.c | 104 --- fs/xfs/linux-2.6/xfs_super.h | 7 fs/xfs/linux-2.6/xfs_sync.c | 1 fs/xfs/linux-2.6/xfs_trace.c | 75 ++ fs/xfs/linux-2.6/xfs_trace.h | 1369 +++++++++++++++++++++++++++++++++++++++++ fs/xfs/linux-2.6/xfs_vnode.h | 4 fs/xfs/quota/xfs_dquot.c | 110 --- fs/xfs/quota/xfs_dquot.h | 21 fs/xfs/quota/xfs_qm.c | 40 - fs/xfs/quota/xfs_qm_syscalls.c | 4 fs/xfs/support/ktrace.c | 323 --------- fs/xfs/support/ktrace.h | 85 -- fs/xfs/xfs.h | 16 fs/xfs/xfs_ag.h | 14 fs/xfs/xfs_alloc.c | 230 +----- fs/xfs/xfs_alloc.h | 27 fs/xfs/xfs_alloc_btree.c | 1 fs/xfs/xfs_attr.c | 107 --- fs/xfs/xfs_attr.h | 10 fs/xfs/xfs_attr_leaf.c | 14 fs/xfs/xfs_attr_sf.h | 40 - fs/xfs/xfs_bmap.c | 507 +++------------ fs/xfs/xfs_bmap.h | 49 - fs/xfs/xfs_bmap_btree.c | 6 fs/xfs/xfs_btree.c | 5 fs/xfs/xfs_btree_trace.h | 17 fs/xfs/xfs_buf_item.c | 87 -- fs/xfs/xfs_buf_item.h | 20 fs/xfs/xfs_da_btree.c | 3 fs/xfs/xfs_da_btree.h | 7 fs/xfs/xfs_dfrag.c | 2 fs/xfs/xfs_dir2.c | 8 fs/xfs/xfs_dir2_block.c | 20 fs/xfs/xfs_dir2_leaf.c | 21 fs/xfs/xfs_dir2_node.c | 27 fs/xfs/xfs_dir2_sf.c | 26 fs/xfs/xfs_dir2_trace.c | 216 ------ fs/xfs/xfs_dir2_trace.h | 72 -- fs/xfs/xfs_filestream.c | 8 fs/xfs/xfs_fsops.c | 2 fs/xfs/xfs_iget.c | 111 --- fs/xfs/xfs_inode.c | 67 -- fs/xfs/xfs_inode.h | 76 -- fs/xfs/xfs_inode_item.c | 5 fs/xfs/xfs_iomap.c | 85 -- fs/xfs/xfs_iomap.h | 8 fs/xfs/xfs_log.c | 181 +---- fs/xfs/xfs_log_priv.h | 20 fs/xfs/xfs_log_recover.c | 1 fs/xfs/xfs_mount.c | 2 fs/xfs/xfs_quota.h | 8 fs/xfs/xfs_rename.c | 1 fs/xfs/xfs_rtalloc.c | 1 fs/xfs/xfs_rw.c | 3 fs/xfs/xfs_trans.h | 47 + fs/xfs/xfs_trans_buf.c | 62 - fs/xfs/xfs_vnodeops.c | 8 70 files changed, 2151 insertions(+), 2592 deletions(-) Signed-off-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Alex Elder <aelder@sgi.com>
2009-12-15 07:14:59 +08:00
trace_xfs_buf_item_unpin_stale(bip);
/*
* If we get called here because of an IO error, we may or may
* not have the item on the AIL. xfs_trans_ail_delete() will
* take care of that situation. xfs_trans_ail_delete() drops
* the AIL lock.
*/
if (bip->bli_flags & XFS_BLI_STALE_INODE) {
xfs_buf_item_done(bp);
xfs_buf_inode_iodone(bp);
ASSERT(list_empty(&bp->b_li_list));
} else {
xfs_trans_ail_delete(lip, SHUTDOWN_LOG_IO_ERROR);
xfs_buf_item_relse(bp);
ASSERT(bp->b_log_item == NULL);
}
xfs_buf_relse(bp);
xfs: hold buffer across unpin and potential shutdown processing The special processing used to simulate a buffer I/O failure on fs shutdown has a difficult to reproduce race that can result in a use after free of the associated buffer. Consider a buffer that has been committed to the on-disk log and thus is AIL resident. The buffer lands on the writeback delwri queue, but is subsequently locked, committed and pinned by another transaction before submitted for I/O. At this point, the buffer is stuck on the delwri queue as it cannot be submitted for I/O until it is unpinned. A log checkpoint I/O failure occurs sometime later, which aborts the bli. The unpin handler is called with the aborted log item, drops the bli reference count, the pin count, and falls into the I/O failure simulation path. The potential problem here is that once the pin count falls to zero in ->iop_unpin(), xfsaild is free to retry delwri submission of the buffer at any time, before the unpin handler even completes. If delwri queue submission wins the race to the buffer lock, it observes the shutdown state and simulates the I/O failure itself. This releases both the bli and delwri queue holds and frees the buffer while xfs_buf_item_unpin() sits on xfs_buf_lock() waiting to run through the same failure sequence. This problem is rare and requires many iterations of fstest generic/019 (which simulates disk I/O failures) to reproduce. To avoid this problem, grab a hold on the buffer before the log item is unpinned if the associated item has been aborted and will require a simulated I/O failure. The hold is already required for the simulated I/O failure, so the ordering simply guarantees the unpin handler access to the buffer before it is unpinned and thus processed by the AIL. This particular ordering is required so long as the AIL does not acquire a reference on the bli, which is the long term solution to this problem. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-06-22 00:43:14 +08:00
} else if (remove) {
/*
* The buffer must be locked and held by the caller to simulate
xfs: hold buffer across unpin and potential shutdown processing The special processing used to simulate a buffer I/O failure on fs shutdown has a difficult to reproduce race that can result in a use after free of the associated buffer. Consider a buffer that has been committed to the on-disk log and thus is AIL resident. The buffer lands on the writeback delwri queue, but is subsequently locked, committed and pinned by another transaction before submitted for I/O. At this point, the buffer is stuck on the delwri queue as it cannot be submitted for I/O until it is unpinned. A log checkpoint I/O failure occurs sometime later, which aborts the bli. The unpin handler is called with the aborted log item, drops the bli reference count, the pin count, and falls into the I/O failure simulation path. The potential problem here is that once the pin count falls to zero in ->iop_unpin(), xfsaild is free to retry delwri submission of the buffer at any time, before the unpin handler even completes. If delwri queue submission wins the race to the buffer lock, it observes the shutdown state and simulates the I/O failure itself. This releases both the bli and delwri queue holds and frees the buffer while xfs_buf_item_unpin() sits on xfs_buf_lock() waiting to run through the same failure sequence. This problem is rare and requires many iterations of fstest generic/019 (which simulates disk I/O failures) to reproduce. To avoid this problem, grab a hold on the buffer before the log item is unpinned if the associated item has been aborted and will require a simulated I/O failure. The hold is already required for the simulated I/O failure, so the ordering simply guarantees the unpin handler access to the buffer before it is unpinned and thus processed by the AIL. This particular ordering is required so long as the AIL does not acquire a reference on the bli, which is the long term solution to this problem. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-06-22 00:43:14 +08:00
* an async I/O failure. We acquired the hold for this case
* before the buffer was unpinned.
*/
xfs_buf_lock(bp);
bp->b_flags |= XBF_ASYNC;
xfs_buf_ioend_fail(bp);
}
}
STATIC uint
xfs: on-stack delayed write buffer lists Queue delwri buffers on a local on-stack list instead of a per-buftarg one, and write back the buffers per-process instead of by waking up xfsbufd. This is now easily doable given that we have very few places left that write delwri buffers: - log recovery: Only done at mount time, and already forcing out the buffers synchronously using xfs_flush_buftarg - quotacheck: Same story. - dquot reclaim: Writes out dirty dquots on the LRU under memory pressure. We might want to look into doing more of this via xfsaild, but it's already more optimal than the synchronous inode reclaim that writes each buffer synchronously. - xfsaild: This is the main beneficiary of the change. By keeping a local list of buffers to write we reduce latency of writing out buffers, and more importably we can remove all the delwri list promotions which were hitting the buffer cache hard under sustained metadata loads. The implementation is very straight forward - xfs_buf_delwri_queue now gets a new list_head pointer that it adds the delwri buffers to, and all callers need to eventually submit the list using xfs_buf_delwi_submit or xfs_buf_delwi_submit_nowait. Buffers that already are on a delwri list are skipped in xfs_buf_delwri_queue, assuming they already are on another delwri list. The biggest change to pass down the buffer list was done to the AIL pushing. Now that we operate on buffers the trylock, push and pushbuf log item methods are merged into a single push routine, which tries to lock the item, and if possible add the buffer that needs writeback to the buffer list. This leads to much simpler code than the previous split but requires the individual IOP_PUSH instances to unlock and reacquire the AIL around calls to blocking routines. Given that xfsailds now also handle writing out buffers, the conditions for log forcing and the sleep times needed some small changes. The most important one is that we consider an AIL busy as long we still have buffers to push, and the other one is that we do increment the pushed LSN for buffers that are under flushing at this moment, but still count them towards the stuck items for restart purposes. Without this we could hammer on stuck items without ever forcing the log and not make progress under heavy random delete workloads on fast flash storage devices. [ Dave Chinner: - rebase on previous patches. - improved comments for XBF_DELWRI_Q handling - fix XBF_ASYNC handling in queue submission (test 106 failure) - rename delwri submit function buffer list parameters for clarity - xfs_efd_item_push() should return XFS_ITEM_PINNED ] Signed-off-by: Christoph Hellwig <hch@lst.de> Reviewed-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Mark Tinguely <tinguely@sgi.com> Signed-off-by: Ben Myers <bpm@sgi.com>
2012-04-23 13:58:39 +08:00
xfs_buf_item_push(
struct xfs_log_item *lip,
struct list_head *buffer_list)
{
struct xfs_buf_log_item *bip = BUF_ITEM(lip);
struct xfs_buf *bp = bip->bli_buf;
xfs: on-stack delayed write buffer lists Queue delwri buffers on a local on-stack list instead of a per-buftarg one, and write back the buffers per-process instead of by waking up xfsbufd. This is now easily doable given that we have very few places left that write delwri buffers: - log recovery: Only done at mount time, and already forcing out the buffers synchronously using xfs_flush_buftarg - quotacheck: Same story. - dquot reclaim: Writes out dirty dquots on the LRU under memory pressure. We might want to look into doing more of this via xfsaild, but it's already more optimal than the synchronous inode reclaim that writes each buffer synchronously. - xfsaild: This is the main beneficiary of the change. By keeping a local list of buffers to write we reduce latency of writing out buffers, and more importably we can remove all the delwri list promotions which were hitting the buffer cache hard under sustained metadata loads. The implementation is very straight forward - xfs_buf_delwri_queue now gets a new list_head pointer that it adds the delwri buffers to, and all callers need to eventually submit the list using xfs_buf_delwi_submit or xfs_buf_delwi_submit_nowait. Buffers that already are on a delwri list are skipped in xfs_buf_delwri_queue, assuming they already are on another delwri list. The biggest change to pass down the buffer list was done to the AIL pushing. Now that we operate on buffers the trylock, push and pushbuf log item methods are merged into a single push routine, which tries to lock the item, and if possible add the buffer that needs writeback to the buffer list. This leads to much simpler code than the previous split but requires the individual IOP_PUSH instances to unlock and reacquire the AIL around calls to blocking routines. Given that xfsailds now also handle writing out buffers, the conditions for log forcing and the sleep times needed some small changes. The most important one is that we consider an AIL busy as long we still have buffers to push, and the other one is that we do increment the pushed LSN for buffers that are under flushing at this moment, but still count them towards the stuck items for restart purposes. Without this we could hammer on stuck items without ever forcing the log and not make progress under heavy random delete workloads on fast flash storage devices. [ Dave Chinner: - rebase on previous patches. - improved comments for XBF_DELWRI_Q handling - fix XBF_ASYNC handling in queue submission (test 106 failure) - rename delwri submit function buffer list parameters for clarity - xfs_efd_item_push() should return XFS_ITEM_PINNED ] Signed-off-by: Christoph Hellwig <hch@lst.de> Reviewed-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Mark Tinguely <tinguely@sgi.com> Signed-off-by: Ben Myers <bpm@sgi.com>
2012-04-23 13:58:39 +08:00
uint rval = XFS_ITEM_SUCCESS;
if (xfs_buf_ispinned(bp))
return XFS_ITEM_PINNED;
if (!xfs_buf_trylock(bp)) {
/*
* If we have just raced with a buffer being pinned and it has
* been marked stale, we could end up stalling until someone else
* issues a log force to unpin the stale buffer. Check for the
* race condition here so xfsaild recognizes the buffer is pinned
* and queues a log force to move it along.
*/
if (xfs_buf_ispinned(bp))
return XFS_ITEM_PINNED;
return XFS_ITEM_LOCKED;
}
ASSERT(!(bip->bli_flags & XFS_BLI_STALE));
xfs: on-stack delayed write buffer lists Queue delwri buffers on a local on-stack list instead of a per-buftarg one, and write back the buffers per-process instead of by waking up xfsbufd. This is now easily doable given that we have very few places left that write delwri buffers: - log recovery: Only done at mount time, and already forcing out the buffers synchronously using xfs_flush_buftarg - quotacheck: Same story. - dquot reclaim: Writes out dirty dquots on the LRU under memory pressure. We might want to look into doing more of this via xfsaild, but it's already more optimal than the synchronous inode reclaim that writes each buffer synchronously. - xfsaild: This is the main beneficiary of the change. By keeping a local list of buffers to write we reduce latency of writing out buffers, and more importably we can remove all the delwri list promotions which were hitting the buffer cache hard under sustained metadata loads. The implementation is very straight forward - xfs_buf_delwri_queue now gets a new list_head pointer that it adds the delwri buffers to, and all callers need to eventually submit the list using xfs_buf_delwi_submit or xfs_buf_delwi_submit_nowait. Buffers that already are on a delwri list are skipped in xfs_buf_delwri_queue, assuming they already are on another delwri list. The biggest change to pass down the buffer list was done to the AIL pushing. Now that we operate on buffers the trylock, push and pushbuf log item methods are merged into a single push routine, which tries to lock the item, and if possible add the buffer that needs writeback to the buffer list. This leads to much simpler code than the previous split but requires the individual IOP_PUSH instances to unlock and reacquire the AIL around calls to blocking routines. Given that xfsailds now also handle writing out buffers, the conditions for log forcing and the sleep times needed some small changes. The most important one is that we consider an AIL busy as long we still have buffers to push, and the other one is that we do increment the pushed LSN for buffers that are under flushing at this moment, but still count them towards the stuck items for restart purposes. Without this we could hammer on stuck items without ever forcing the log and not make progress under heavy random delete workloads on fast flash storage devices. [ Dave Chinner: - rebase on previous patches. - improved comments for XBF_DELWRI_Q handling - fix XBF_ASYNC handling in queue submission (test 106 failure) - rename delwri submit function buffer list parameters for clarity - xfs_efd_item_push() should return XFS_ITEM_PINNED ] Signed-off-by: Christoph Hellwig <hch@lst.de> Reviewed-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Mark Tinguely <tinguely@sgi.com> Signed-off-by: Ben Myers <bpm@sgi.com>
2012-04-23 13:58:39 +08:00
trace_xfs_buf_item_push(bip);
xfs: abort metadata writeback on permanent errors If we are doing aysnc writeback of metadata, we can get write errors but have nobody to report them to. At the moment, we simply attempt to reissue the write from io completion in the hope that it's a transient error. When it's not a transient error, the buffer is stuck forever in this loop, and we cannot break out of it. Eventually, unmount will hang because the AIL cannot be emptied and everything goes downhill from them. To solve this problem, only retry the write IO once before aborting it. We don't throw the buffer away because some transient errors can last minutes (e.g. FC path failover) or even hours (thin provisioned devices that have run out of backing space) before they go away. Hence we really want to keep trying until we can't try any more. Because the buffer was not cleaned, however, it does not get removed from the AIL and hence the next pass across the AIL will start IO on it again. As such, we still get the "retry forever" semantics that we currently have, but we allow other access to the buffer in the mean time. Meanwhile the filesystem can continue to modify the buffer and relog it, so the IO errors won't hang the log or the filesystem. Now when we are pushing the AIL, we can see all these "permanent IO error" buffers and we can issue a warning about failures before we retry the IO. We can also catch these buffers when unmounting an issue a corruption warning, too. Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Ben Myers <bpm@sgi.com>
2013-12-12 13:34:38 +08:00
/* has a previous flush failed due to IO errors? */
if (bp->b_flags & XBF_WRITE_FAIL) {
xfs_buf_alert_ratelimited(bp, "XFS: Failing async write",
"Failing async write on buffer block 0x%llx. Retrying async write.",
(long long)xfs_buf_daddr(bp));
xfs: abort metadata writeback on permanent errors If we are doing aysnc writeback of metadata, we can get write errors but have nobody to report them to. At the moment, we simply attempt to reissue the write from io completion in the hope that it's a transient error. When it's not a transient error, the buffer is stuck forever in this loop, and we cannot break out of it. Eventually, unmount will hang because the AIL cannot be emptied and everything goes downhill from them. To solve this problem, only retry the write IO once before aborting it. We don't throw the buffer away because some transient errors can last minutes (e.g. FC path failover) or even hours (thin provisioned devices that have run out of backing space) before they go away. Hence we really want to keep trying until we can't try any more. Because the buffer was not cleaned, however, it does not get removed from the AIL and hence the next pass across the AIL will start IO on it again. As such, we still get the "retry forever" semantics that we currently have, but we allow other access to the buffer in the mean time. Meanwhile the filesystem can continue to modify the buffer and relog it, so the IO errors won't hang the log or the filesystem. Now when we are pushing the AIL, we can see all these "permanent IO error" buffers and we can issue a warning about failures before we retry the IO. We can also catch these buffers when unmounting an issue a corruption warning, too. Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Ben Myers <bpm@sgi.com>
2013-12-12 13:34:38 +08:00
}
xfs: on-stack delayed write buffer lists Queue delwri buffers on a local on-stack list instead of a per-buftarg one, and write back the buffers per-process instead of by waking up xfsbufd. This is now easily doable given that we have very few places left that write delwri buffers: - log recovery: Only done at mount time, and already forcing out the buffers synchronously using xfs_flush_buftarg - quotacheck: Same story. - dquot reclaim: Writes out dirty dquots on the LRU under memory pressure. We might want to look into doing more of this via xfsaild, but it's already more optimal than the synchronous inode reclaim that writes each buffer synchronously. - xfsaild: This is the main beneficiary of the change. By keeping a local list of buffers to write we reduce latency of writing out buffers, and more importably we can remove all the delwri list promotions which were hitting the buffer cache hard under sustained metadata loads. The implementation is very straight forward - xfs_buf_delwri_queue now gets a new list_head pointer that it adds the delwri buffers to, and all callers need to eventually submit the list using xfs_buf_delwi_submit or xfs_buf_delwi_submit_nowait. Buffers that already are on a delwri list are skipped in xfs_buf_delwri_queue, assuming they already are on another delwri list. The biggest change to pass down the buffer list was done to the AIL pushing. Now that we operate on buffers the trylock, push and pushbuf log item methods are merged into a single push routine, which tries to lock the item, and if possible add the buffer that needs writeback to the buffer list. This leads to much simpler code than the previous split but requires the individual IOP_PUSH instances to unlock and reacquire the AIL around calls to blocking routines. Given that xfsailds now also handle writing out buffers, the conditions for log forcing and the sleep times needed some small changes. The most important one is that we consider an AIL busy as long we still have buffers to push, and the other one is that we do increment the pushed LSN for buffers that are under flushing at this moment, but still count them towards the stuck items for restart purposes. Without this we could hammer on stuck items without ever forcing the log and not make progress under heavy random delete workloads on fast flash storage devices. [ Dave Chinner: - rebase on previous patches. - improved comments for XBF_DELWRI_Q handling - fix XBF_ASYNC handling in queue submission (test 106 failure) - rename delwri submit function buffer list parameters for clarity - xfs_efd_item_push() should return XFS_ITEM_PINNED ] Signed-off-by: Christoph Hellwig <hch@lst.de> Reviewed-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Mark Tinguely <tinguely@sgi.com> Signed-off-by: Ben Myers <bpm@sgi.com>
2012-04-23 13:58:39 +08:00
if (!xfs_buf_delwri_queue(bp, buffer_list))
rval = XFS_ITEM_FLUSHING;
xfs_buf_unlock(bp);
return rval;
}
xfs: refactor xfs_buf_log_item reference count handling The xfs_buf_log_item structure has a reference counter with slightly tricky semantics. In the common case, a buffer is logged and committed in a transaction, committed to the on-disk log (added to the AIL) and then finally written back and removed from the AIL. The bli refcount covers two potentially overlapping timeframes: 1. the bli is held in an active transaction 2. the bli is pinned by the log The caveat to this approach is that the reference counter does not purely dictate the lifetime of the bli. IOW, when a dirty buffer is physically logged and unpinned, the bli refcount may go to zero as the log item is inserted into the AIL. Only once the buffer is written back can the bli finally be freed. The above semantics means that it is not enough for the various refcount decrementing contexts to release the bli on decrement to zero. xfs_trans_brelse(), transaction commit (->iop_unlock()) and unpin (->iop_unpin()) must all drop the associated reference and make additional checks to determine if the current context is responsible for freeing the item. For example, if a transaction holds but does not dirty a particular bli, the commit may drop the refcount to zero. If the bli itself is clean, it is also not AIL resident and must be freed at this time. The same is true for xfs_trans_brelse(). If the transaction dirties a bli and then aborts or an unpin results in an abort due to a log I/O error, the last reference count holder is expected to explicitly remove the item from the AIL and release it (since an abort means filesystem shutdown and metadata writeback will never occur). This leads to fairly complex checks being replicated in a few different places. Since ->iop_unlock() and xfs_trans_brelse() are nearly identical, refactor the logic into a common helper that implements and documents the semantics in one place. This patch does not change behavior. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Dave Chinner <dchinner@redhat.com> Signed-off-by: Dave Chinner <david@fromorbit.com>
2018-09-29 11:45:26 +08:00
/*
* Drop the buffer log item refcount and take appropriate action. This helper
* determines whether the bli must be freed or not, since a decrement to zero
* does not necessarily mean the bli is unused.
*
* Return true if the bli is freed, false otherwise.
*/
bool
xfs_buf_item_put(
struct xfs_buf_log_item *bip)
{
struct xfs_log_item *lip = &bip->bli_item;
bool aborted;
bool dirty;
/* drop the bli ref and return if it wasn't the last one */
if (!atomic_dec_and_test(&bip->bli_refcount))
return false;
/*
* We dropped the last ref and must free the item if clean or aborted.
* If the bli is dirty and non-aborted, the buffer was clean in the
* transaction but still awaiting writeback from previous changes. In
* that case, the bli is freed on buffer writeback completion.
*/
aborted = test_bit(XFS_LI_ABORTED, &lip->li_flags) ||
xlog_is_shutdown(lip->li_log);
xfs: refactor xfs_buf_log_item reference count handling The xfs_buf_log_item structure has a reference counter with slightly tricky semantics. In the common case, a buffer is logged and committed in a transaction, committed to the on-disk log (added to the AIL) and then finally written back and removed from the AIL. The bli refcount covers two potentially overlapping timeframes: 1. the bli is held in an active transaction 2. the bli is pinned by the log The caveat to this approach is that the reference counter does not purely dictate the lifetime of the bli. IOW, when a dirty buffer is physically logged and unpinned, the bli refcount may go to zero as the log item is inserted into the AIL. Only once the buffer is written back can the bli finally be freed. The above semantics means that it is not enough for the various refcount decrementing contexts to release the bli on decrement to zero. xfs_trans_brelse(), transaction commit (->iop_unlock()) and unpin (->iop_unpin()) must all drop the associated reference and make additional checks to determine if the current context is responsible for freeing the item. For example, if a transaction holds but does not dirty a particular bli, the commit may drop the refcount to zero. If the bli itself is clean, it is also not AIL resident and must be freed at this time. The same is true for xfs_trans_brelse(). If the transaction dirties a bli and then aborts or an unpin results in an abort due to a log I/O error, the last reference count holder is expected to explicitly remove the item from the AIL and release it (since an abort means filesystem shutdown and metadata writeback will never occur). This leads to fairly complex checks being replicated in a few different places. Since ->iop_unlock() and xfs_trans_brelse() are nearly identical, refactor the logic into a common helper that implements and documents the semantics in one place. This patch does not change behavior. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Dave Chinner <dchinner@redhat.com> Signed-off-by: Dave Chinner <david@fromorbit.com>
2018-09-29 11:45:26 +08:00
dirty = bip->bli_flags & XFS_BLI_DIRTY;
if (dirty && !aborted)
return false;
/*
* The bli is aborted or clean. An aborted item may be in the AIL
* regardless of dirty state. For example, consider an aborted
* transaction that invalidated a dirty bli and cleared the dirty
* state.
*/
if (aborted)
xfs_trans_ail_delete(lip, 0);
xfs: refactor xfs_buf_log_item reference count handling The xfs_buf_log_item structure has a reference counter with slightly tricky semantics. In the common case, a buffer is logged and committed in a transaction, committed to the on-disk log (added to the AIL) and then finally written back and removed from the AIL. The bli refcount covers two potentially overlapping timeframes: 1. the bli is held in an active transaction 2. the bli is pinned by the log The caveat to this approach is that the reference counter does not purely dictate the lifetime of the bli. IOW, when a dirty buffer is physically logged and unpinned, the bli refcount may go to zero as the log item is inserted into the AIL. Only once the buffer is written back can the bli finally be freed. The above semantics means that it is not enough for the various refcount decrementing contexts to release the bli on decrement to zero. xfs_trans_brelse(), transaction commit (->iop_unlock()) and unpin (->iop_unpin()) must all drop the associated reference and make additional checks to determine if the current context is responsible for freeing the item. For example, if a transaction holds but does not dirty a particular bli, the commit may drop the refcount to zero. If the bli itself is clean, it is also not AIL resident and must be freed at this time. The same is true for xfs_trans_brelse(). If the transaction dirties a bli and then aborts or an unpin results in an abort due to a log I/O error, the last reference count holder is expected to explicitly remove the item from the AIL and release it (since an abort means filesystem shutdown and metadata writeback will never occur). This leads to fairly complex checks being replicated in a few different places. Since ->iop_unlock() and xfs_trans_brelse() are nearly identical, refactor the logic into a common helper that implements and documents the semantics in one place. This patch does not change behavior. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Dave Chinner <dchinner@redhat.com> Signed-off-by: Dave Chinner <david@fromorbit.com>
2018-09-29 11:45:26 +08:00
xfs_buf_item_relse(bip->bli_buf);
return true;
}
/*
* Release the buffer associated with the buf log item. If there is no dirty
* logged data associated with the buffer recorded in the buf log item, then
* free the buf log item and remove the reference to it in the buffer.
*
* This call ignores the recursion count. It is only called when the buffer
* should REALLY be unlocked, regardless of the recursion count.
*
* We unconditionally drop the transaction's reference to the log item. If the
* item was logged, then another reference was taken when it was pinned, so we
* can safely drop the transaction reference now. This also allows us to avoid
* potential races with the unpin code freeing the bli by not referencing the
* bli after we've dropped the reference count.
*
* If the XFS_BLI_HOLD flag is set in the buf log item, then free the log item
* if necessary but do not unlock the buffer. This is for support of
* xfs_trans_bhold(). Make sure the XFS_BLI_HOLD field is cleared if we don't
* free the item.
*/
STATIC void
xfs: split iop_unlock The iop_unlock method is called when comitting or cancelling a transaction. In the latter case, the transaction may or may not be aborted. While there is no known problem with the current code in practice, this implementation is limited in that any log item implementation that might want to differentiate between a commit and a cancellation must rely on the aborted state. The aborted bit is only set when the cancelled transaction is dirty, however. This means that there is no way to distinguish between a commit and a clean transaction cancellation. For example, intent log items currently rely on this distinction. The log item is either transferred to the CIL on commit or released on transaction cancel. There is currently no possibility for a clean intent log item in a transaction, but if that state is ever introduced a cancel of such a transaction will immediately result in memory leaks of the associated log item(s). This is an interface deficiency and landmine. To clean this up, replace the iop_unlock method with an iop_release method that is specific to transaction cancel. The existing iop_committing method occurs at the same time as iop_unlock in the commit path and there is no need for two separate callbacks here. Overload the iop_committing method with the current commit time iop_unlock implementations to eliminate the need for the latter and further simplify the interface. Signed-off-by: Christoph Hellwig <hch@lst.de> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Darrick J. Wong <darrick.wong@oracle.com> Signed-off-by: Darrick J. Wong <darrick.wong@oracle.com>
2019-06-29 10:27:32 +08:00
xfs_buf_item_release(
struct xfs_log_item *lip)
{
struct xfs_buf_log_item *bip = BUF_ITEM(lip);
struct xfs_buf *bp = bip->bli_buf;
xfs: refactor xfs_buf_log_item reference count handling The xfs_buf_log_item structure has a reference counter with slightly tricky semantics. In the common case, a buffer is logged and committed in a transaction, committed to the on-disk log (added to the AIL) and then finally written back and removed from the AIL. The bli refcount covers two potentially overlapping timeframes: 1. the bli is held in an active transaction 2. the bli is pinned by the log The caveat to this approach is that the reference counter does not purely dictate the lifetime of the bli. IOW, when a dirty buffer is physically logged and unpinned, the bli refcount may go to zero as the log item is inserted into the AIL. Only once the buffer is written back can the bli finally be freed. The above semantics means that it is not enough for the various refcount decrementing contexts to release the bli on decrement to zero. xfs_trans_brelse(), transaction commit (->iop_unlock()) and unpin (->iop_unpin()) must all drop the associated reference and make additional checks to determine if the current context is responsible for freeing the item. For example, if a transaction holds but does not dirty a particular bli, the commit may drop the refcount to zero. If the bli itself is clean, it is also not AIL resident and must be freed at this time. The same is true for xfs_trans_brelse(). If the transaction dirties a bli and then aborts or an unpin results in an abort due to a log I/O error, the last reference count holder is expected to explicitly remove the item from the AIL and release it (since an abort means filesystem shutdown and metadata writeback will never occur). This leads to fairly complex checks being replicated in a few different places. Since ->iop_unlock() and xfs_trans_brelse() are nearly identical, refactor the logic into a common helper that implements and documents the semantics in one place. This patch does not change behavior. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Dave Chinner <dchinner@redhat.com> Signed-off-by: Dave Chinner <david@fromorbit.com>
2018-09-29 11:45:26 +08:00
bool released;
xfs: don't unlock invalidated buf on aborted tx commit xfstests generic/388,475 occasionally reproduce assertion failures in xfs_buf_item_unpin() when the final bli reference is dropped on an invalidated buffer and the buffer is not locked as it is expected to be. Invalidated buffers should remain locked on transaction commit until the final unpin, at which point the buffer is removed from the AIL and the bli is freed since stale buffers are not written back. The assert failures are associated with filesystem shutdown, typically due to log I/O errors injected by the test. The problematic situation can occur if the shutdown happens to cause a race between an active transaction that has invalidated a particular buffer and an I/O error on a log buffer that contains the bli associated with the same (now stale) buffer. Both transaction and log contexts acquire a bli reference. If the transaction has already invalidated the buffer by the time the I/O error occurs and ends up aborting due to shutdown, the transaction and log hold the last two references to a stale bli. If the transaction cancel occurs first, it treats the buffer as non-stale due to the aborted state: the bli reference is dropped and the buffer is released/unlocked. The log buffer I/O error handling eventually calls into xfs_buf_item_unpin(), drops the final reference to the bli and treats it as stale. The buffer wasn't left locked by xfs_buf_item_unlock(), however, so the assert fails and the buffer is double unlocked. The latter problem is mitigated by the fact that the fs is shutdown and no further damage is possible. ->iop_unlock() of an invalidated buffer should behave consistently with respect to the bli refcount, regardless of aborted state. If the refcount remains elevated on commit, we know the bli is awaiting an unpin (since it can't be in another transaction) and will be handled appropriately on log buffer completion. If the final bli reference of an invalidated buffer is dropped in ->iop_unlock(), we can assume the transaction has aborted because invalidation implies a dirty transaction. In the non-abort case, the log would have acquired a bli reference in ->iop_pin() and prevented bli release at ->iop_unlock() time. In the abort case the item must be freed and buffer unlocked because it wasn't pinned by the log. Rework xfs_buf_item_unlock() to simplify the currently circuitous and duplicate logic and leave invalidated buffers locked based on bli refcount, regardless of aborted state. This ensures that a pinned, stale buffer is always found locked when eventually unpinned. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Dave Chinner <dchinner@redhat.com> Signed-off-by: Dave Chinner <david@fromorbit.com>
2018-09-29 11:44:40 +08:00
bool hold = bip->bli_flags & XFS_BLI_HOLD;
bool stale = bip->bli_flags & XFS_BLI_STALE;
#if defined(DEBUG) || defined(XFS_WARN)
xfs: don't unlock invalidated buf on aborted tx commit xfstests generic/388,475 occasionally reproduce assertion failures in xfs_buf_item_unpin() when the final bli reference is dropped on an invalidated buffer and the buffer is not locked as it is expected to be. Invalidated buffers should remain locked on transaction commit until the final unpin, at which point the buffer is removed from the AIL and the bli is freed since stale buffers are not written back. The assert failures are associated with filesystem shutdown, typically due to log I/O errors injected by the test. The problematic situation can occur if the shutdown happens to cause a race between an active transaction that has invalidated a particular buffer and an I/O error on a log buffer that contains the bli associated with the same (now stale) buffer. Both transaction and log contexts acquire a bli reference. If the transaction has already invalidated the buffer by the time the I/O error occurs and ends up aborting due to shutdown, the transaction and log hold the last two references to a stale bli. If the transaction cancel occurs first, it treats the buffer as non-stale due to the aborted state: the bli reference is dropped and the buffer is released/unlocked. The log buffer I/O error handling eventually calls into xfs_buf_item_unpin(), drops the final reference to the bli and treats it as stale. The buffer wasn't left locked by xfs_buf_item_unlock(), however, so the assert fails and the buffer is double unlocked. The latter problem is mitigated by the fact that the fs is shutdown and no further damage is possible. ->iop_unlock() of an invalidated buffer should behave consistently with respect to the bli refcount, regardless of aborted state. If the refcount remains elevated on commit, we know the bli is awaiting an unpin (since it can't be in another transaction) and will be handled appropriately on log buffer completion. If the final bli reference of an invalidated buffer is dropped in ->iop_unlock(), we can assume the transaction has aborted because invalidation implies a dirty transaction. In the non-abort case, the log would have acquired a bli reference in ->iop_pin() and prevented bli release at ->iop_unlock() time. In the abort case the item must be freed and buffer unlocked because it wasn't pinned by the log. Rework xfs_buf_item_unlock() to simplify the currently circuitous and duplicate logic and leave invalidated buffers locked based on bli refcount, regardless of aborted state. This ensures that a pinned, stale buffer is always found locked when eventually unpinned. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Dave Chinner <dchinner@redhat.com> Signed-off-by: Dave Chinner <david@fromorbit.com>
2018-09-29 11:44:40 +08:00
bool ordered = bip->bli_flags & XFS_BLI_ORDERED;
xfs: refactor xfs_buf_log_item reference count handling The xfs_buf_log_item structure has a reference counter with slightly tricky semantics. In the common case, a buffer is logged and committed in a transaction, committed to the on-disk log (added to the AIL) and then finally written back and removed from the AIL. The bli refcount covers two potentially overlapping timeframes: 1. the bli is held in an active transaction 2. the bli is pinned by the log The caveat to this approach is that the reference counter does not purely dictate the lifetime of the bli. IOW, when a dirty buffer is physically logged and unpinned, the bli refcount may go to zero as the log item is inserted into the AIL. Only once the buffer is written back can the bli finally be freed. The above semantics means that it is not enough for the various refcount decrementing contexts to release the bli on decrement to zero. xfs_trans_brelse(), transaction commit (->iop_unlock()) and unpin (->iop_unpin()) must all drop the associated reference and make additional checks to determine if the current context is responsible for freeing the item. For example, if a transaction holds but does not dirty a particular bli, the commit may drop the refcount to zero. If the bli itself is clean, it is also not AIL resident and must be freed at this time. The same is true for xfs_trans_brelse(). If the transaction dirties a bli and then aborts or an unpin results in an abort due to a log I/O error, the last reference count holder is expected to explicitly remove the item from the AIL and release it (since an abort means filesystem shutdown and metadata writeback will never occur). This leads to fairly complex checks being replicated in a few different places. Since ->iop_unlock() and xfs_trans_brelse() are nearly identical, refactor the logic into a common helper that implements and documents the semantics in one place. This patch does not change behavior. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Dave Chinner <dchinner@redhat.com> Signed-off-by: Dave Chinner <david@fromorbit.com>
2018-09-29 11:45:26 +08:00
bool dirty = bip->bli_flags & XFS_BLI_DIRTY;
bool aborted = test_bit(XFS_LI_ABORTED,
&lip->li_flags);
#endif
xfs: split iop_unlock The iop_unlock method is called when comitting or cancelling a transaction. In the latter case, the transaction may or may not be aborted. While there is no known problem with the current code in practice, this implementation is limited in that any log item implementation that might want to differentiate between a commit and a cancellation must rely on the aborted state. The aborted bit is only set when the cancelled transaction is dirty, however. This means that there is no way to distinguish between a commit and a clean transaction cancellation. For example, intent log items currently rely on this distinction. The log item is either transferred to the CIL on commit or released on transaction cancel. There is currently no possibility for a clean intent log item in a transaction, but if that state is ever introduced a cancel of such a transaction will immediately result in memory leaks of the associated log item(s). This is an interface deficiency and landmine. To clean this up, replace the iop_unlock method with an iop_release method that is specific to transaction cancel. The existing iop_committing method occurs at the same time as iop_unlock in the commit path and there is no need for two separate callbacks here. Overload the iop_committing method with the current commit time iop_unlock implementations to eliminate the need for the latter and further simplify the interface. Signed-off-by: Christoph Hellwig <hch@lst.de> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Darrick J. Wong <darrick.wong@oracle.com> Signed-off-by: Darrick J. Wong <darrick.wong@oracle.com>
2019-06-29 10:27:32 +08:00
trace_xfs_buf_item_release(bip);
/*
* The bli dirty state should match whether the blf has logged segments
* except for ordered buffers, where only the bli should be dirty.
*/
ASSERT((!ordered && dirty == xfs_buf_item_dirty_format(bip)) ||
(ordered && dirty && !xfs_buf_item_dirty_format(bip)));
xfs: don't unlock invalidated buf on aborted tx commit xfstests generic/388,475 occasionally reproduce assertion failures in xfs_buf_item_unpin() when the final bli reference is dropped on an invalidated buffer and the buffer is not locked as it is expected to be. Invalidated buffers should remain locked on transaction commit until the final unpin, at which point the buffer is removed from the AIL and the bli is freed since stale buffers are not written back. The assert failures are associated with filesystem shutdown, typically due to log I/O errors injected by the test. The problematic situation can occur if the shutdown happens to cause a race between an active transaction that has invalidated a particular buffer and an I/O error on a log buffer that contains the bli associated with the same (now stale) buffer. Both transaction and log contexts acquire a bli reference. If the transaction has already invalidated the buffer by the time the I/O error occurs and ends up aborting due to shutdown, the transaction and log hold the last two references to a stale bli. If the transaction cancel occurs first, it treats the buffer as non-stale due to the aborted state: the bli reference is dropped and the buffer is released/unlocked. The log buffer I/O error handling eventually calls into xfs_buf_item_unpin(), drops the final reference to the bli and treats it as stale. The buffer wasn't left locked by xfs_buf_item_unlock(), however, so the assert fails and the buffer is double unlocked. The latter problem is mitigated by the fact that the fs is shutdown and no further damage is possible. ->iop_unlock() of an invalidated buffer should behave consistently with respect to the bli refcount, regardless of aborted state. If the refcount remains elevated on commit, we know the bli is awaiting an unpin (since it can't be in another transaction) and will be handled appropriately on log buffer completion. If the final bli reference of an invalidated buffer is dropped in ->iop_unlock(), we can assume the transaction has aborted because invalidation implies a dirty transaction. In the non-abort case, the log would have acquired a bli reference in ->iop_pin() and prevented bli release at ->iop_unlock() time. In the abort case the item must be freed and buffer unlocked because it wasn't pinned by the log. Rework xfs_buf_item_unlock() to simplify the currently circuitous and duplicate logic and leave invalidated buffers locked based on bli refcount, regardless of aborted state. This ensures that a pinned, stale buffer is always found locked when eventually unpinned. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Dave Chinner <dchinner@redhat.com> Signed-off-by: Dave Chinner <david@fromorbit.com>
2018-09-29 11:44:40 +08:00
ASSERT(!stale || (bip->__bli_format.blf_flags & XFS_BLF_CANCEL));
/*
xfs: don't unlock invalidated buf on aborted tx commit xfstests generic/388,475 occasionally reproduce assertion failures in xfs_buf_item_unpin() when the final bli reference is dropped on an invalidated buffer and the buffer is not locked as it is expected to be. Invalidated buffers should remain locked on transaction commit until the final unpin, at which point the buffer is removed from the AIL and the bli is freed since stale buffers are not written back. The assert failures are associated with filesystem shutdown, typically due to log I/O errors injected by the test. The problematic situation can occur if the shutdown happens to cause a race between an active transaction that has invalidated a particular buffer and an I/O error on a log buffer that contains the bli associated with the same (now stale) buffer. Both transaction and log contexts acquire a bli reference. If the transaction has already invalidated the buffer by the time the I/O error occurs and ends up aborting due to shutdown, the transaction and log hold the last two references to a stale bli. If the transaction cancel occurs first, it treats the buffer as non-stale due to the aborted state: the bli reference is dropped and the buffer is released/unlocked. The log buffer I/O error handling eventually calls into xfs_buf_item_unpin(), drops the final reference to the bli and treats it as stale. The buffer wasn't left locked by xfs_buf_item_unlock(), however, so the assert fails and the buffer is double unlocked. The latter problem is mitigated by the fact that the fs is shutdown and no further damage is possible. ->iop_unlock() of an invalidated buffer should behave consistently with respect to the bli refcount, regardless of aborted state. If the refcount remains elevated on commit, we know the bli is awaiting an unpin (since it can't be in another transaction) and will be handled appropriately on log buffer completion. If the final bli reference of an invalidated buffer is dropped in ->iop_unlock(), we can assume the transaction has aborted because invalidation implies a dirty transaction. In the non-abort case, the log would have acquired a bli reference in ->iop_pin() and prevented bli release at ->iop_unlock() time. In the abort case the item must be freed and buffer unlocked because it wasn't pinned by the log. Rework xfs_buf_item_unlock() to simplify the currently circuitous and duplicate logic and leave invalidated buffers locked based on bli refcount, regardless of aborted state. This ensures that a pinned, stale buffer is always found locked when eventually unpinned. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Dave Chinner <dchinner@redhat.com> Signed-off-by: Dave Chinner <david@fromorbit.com>
2018-09-29 11:44:40 +08:00
* Clear the buffer's association with this transaction and
* per-transaction state from the bli, which has been copied above.
*/
bp->b_transp = NULL;
bip->bli_flags &= ~(XFS_BLI_LOGGED | XFS_BLI_HOLD | XFS_BLI_ORDERED);
/*
xfs: refactor xfs_buf_log_item reference count handling The xfs_buf_log_item structure has a reference counter with slightly tricky semantics. In the common case, a buffer is logged and committed in a transaction, committed to the on-disk log (added to the AIL) and then finally written back and removed from the AIL. The bli refcount covers two potentially overlapping timeframes: 1. the bli is held in an active transaction 2. the bli is pinned by the log The caveat to this approach is that the reference counter does not purely dictate the lifetime of the bli. IOW, when a dirty buffer is physically logged and unpinned, the bli refcount may go to zero as the log item is inserted into the AIL. Only once the buffer is written back can the bli finally be freed. The above semantics means that it is not enough for the various refcount decrementing contexts to release the bli on decrement to zero. xfs_trans_brelse(), transaction commit (->iop_unlock()) and unpin (->iop_unpin()) must all drop the associated reference and make additional checks to determine if the current context is responsible for freeing the item. For example, if a transaction holds but does not dirty a particular bli, the commit may drop the refcount to zero. If the bli itself is clean, it is also not AIL resident and must be freed at this time. The same is true for xfs_trans_brelse(). If the transaction dirties a bli and then aborts or an unpin results in an abort due to a log I/O error, the last reference count holder is expected to explicitly remove the item from the AIL and release it (since an abort means filesystem shutdown and metadata writeback will never occur). This leads to fairly complex checks being replicated in a few different places. Since ->iop_unlock() and xfs_trans_brelse() are nearly identical, refactor the logic into a common helper that implements and documents the semantics in one place. This patch does not change behavior. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Dave Chinner <dchinner@redhat.com> Signed-off-by: Dave Chinner <david@fromorbit.com>
2018-09-29 11:45:26 +08:00
* Unref the item and unlock the buffer unless held or stale. Stale
* buffers remain locked until final unpin unless the bli is freed by
* the unref call. The latter implies shutdown because buffer
* invalidation dirties the bli and transaction.
*/
xfs: refactor xfs_buf_log_item reference count handling The xfs_buf_log_item structure has a reference counter with slightly tricky semantics. In the common case, a buffer is logged and committed in a transaction, committed to the on-disk log (added to the AIL) and then finally written back and removed from the AIL. The bli refcount covers two potentially overlapping timeframes: 1. the bli is held in an active transaction 2. the bli is pinned by the log The caveat to this approach is that the reference counter does not purely dictate the lifetime of the bli. IOW, when a dirty buffer is physically logged and unpinned, the bli refcount may go to zero as the log item is inserted into the AIL. Only once the buffer is written back can the bli finally be freed. The above semantics means that it is not enough for the various refcount decrementing contexts to release the bli on decrement to zero. xfs_trans_brelse(), transaction commit (->iop_unlock()) and unpin (->iop_unpin()) must all drop the associated reference and make additional checks to determine if the current context is responsible for freeing the item. For example, if a transaction holds but does not dirty a particular bli, the commit may drop the refcount to zero. If the bli itself is clean, it is also not AIL resident and must be freed at this time. The same is true for xfs_trans_brelse(). If the transaction dirties a bli and then aborts or an unpin results in an abort due to a log I/O error, the last reference count holder is expected to explicitly remove the item from the AIL and release it (since an abort means filesystem shutdown and metadata writeback will never occur). This leads to fairly complex checks being replicated in a few different places. Since ->iop_unlock() and xfs_trans_brelse() are nearly identical, refactor the logic into a common helper that implements and documents the semantics in one place. This patch does not change behavior. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Dave Chinner <dchinner@redhat.com> Signed-off-by: Dave Chinner <david@fromorbit.com>
2018-09-29 11:45:26 +08:00
released = xfs_buf_item_put(bip);
if (hold || (stale && !released))
xfs: don't unlock invalidated buf on aborted tx commit xfstests generic/388,475 occasionally reproduce assertion failures in xfs_buf_item_unpin() when the final bli reference is dropped on an invalidated buffer and the buffer is not locked as it is expected to be. Invalidated buffers should remain locked on transaction commit until the final unpin, at which point the buffer is removed from the AIL and the bli is freed since stale buffers are not written back. The assert failures are associated with filesystem shutdown, typically due to log I/O errors injected by the test. The problematic situation can occur if the shutdown happens to cause a race between an active transaction that has invalidated a particular buffer and an I/O error on a log buffer that contains the bli associated with the same (now stale) buffer. Both transaction and log contexts acquire a bli reference. If the transaction has already invalidated the buffer by the time the I/O error occurs and ends up aborting due to shutdown, the transaction and log hold the last two references to a stale bli. If the transaction cancel occurs first, it treats the buffer as non-stale due to the aborted state: the bli reference is dropped and the buffer is released/unlocked. The log buffer I/O error handling eventually calls into xfs_buf_item_unpin(), drops the final reference to the bli and treats it as stale. The buffer wasn't left locked by xfs_buf_item_unlock(), however, so the assert fails and the buffer is double unlocked. The latter problem is mitigated by the fact that the fs is shutdown and no further damage is possible. ->iop_unlock() of an invalidated buffer should behave consistently with respect to the bli refcount, regardless of aborted state. If the refcount remains elevated on commit, we know the bli is awaiting an unpin (since it can't be in another transaction) and will be handled appropriately on log buffer completion. If the final bli reference of an invalidated buffer is dropped in ->iop_unlock(), we can assume the transaction has aborted because invalidation implies a dirty transaction. In the non-abort case, the log would have acquired a bli reference in ->iop_pin() and prevented bli release at ->iop_unlock() time. In the abort case the item must be freed and buffer unlocked because it wasn't pinned by the log. Rework xfs_buf_item_unlock() to simplify the currently circuitous and duplicate logic and leave invalidated buffers locked based on bli refcount, regardless of aborted state. This ensures that a pinned, stale buffer is always found locked when eventually unpinned. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Dave Chinner <dchinner@redhat.com> Signed-off-by: Dave Chinner <david@fromorbit.com>
2018-09-29 11:44:40 +08:00
return;
ASSERT(!stale || aborted);
xfs: refactor xfs_buf_log_item reference count handling The xfs_buf_log_item structure has a reference counter with slightly tricky semantics. In the common case, a buffer is logged and committed in a transaction, committed to the on-disk log (added to the AIL) and then finally written back and removed from the AIL. The bli refcount covers two potentially overlapping timeframes: 1. the bli is held in an active transaction 2. the bli is pinned by the log The caveat to this approach is that the reference counter does not purely dictate the lifetime of the bli. IOW, when a dirty buffer is physically logged and unpinned, the bli refcount may go to zero as the log item is inserted into the AIL. Only once the buffer is written back can the bli finally be freed. The above semantics means that it is not enough for the various refcount decrementing contexts to release the bli on decrement to zero. xfs_trans_brelse(), transaction commit (->iop_unlock()) and unpin (->iop_unpin()) must all drop the associated reference and make additional checks to determine if the current context is responsible for freeing the item. For example, if a transaction holds but does not dirty a particular bli, the commit may drop the refcount to zero. If the bli itself is clean, it is also not AIL resident and must be freed at this time. The same is true for xfs_trans_brelse(). If the transaction dirties a bli and then aborts or an unpin results in an abort due to a log I/O error, the last reference count holder is expected to explicitly remove the item from the AIL and release it (since an abort means filesystem shutdown and metadata writeback will never occur). This leads to fairly complex checks being replicated in a few different places. Since ->iop_unlock() and xfs_trans_brelse() are nearly identical, refactor the logic into a common helper that implements and documents the semantics in one place. This patch does not change behavior. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Dave Chinner <dchinner@redhat.com> Signed-off-by: Dave Chinner <david@fromorbit.com>
2018-09-29 11:45:26 +08:00
xfs_buf_relse(bp);
}
xfs: split iop_unlock The iop_unlock method is called when comitting or cancelling a transaction. In the latter case, the transaction may or may not be aborted. While there is no known problem with the current code in practice, this implementation is limited in that any log item implementation that might want to differentiate between a commit and a cancellation must rely on the aborted state. The aborted bit is only set when the cancelled transaction is dirty, however. This means that there is no way to distinguish between a commit and a clean transaction cancellation. For example, intent log items currently rely on this distinction. The log item is either transferred to the CIL on commit or released on transaction cancel. There is currently no possibility for a clean intent log item in a transaction, but if that state is ever introduced a cancel of such a transaction will immediately result in memory leaks of the associated log item(s). This is an interface deficiency and landmine. To clean this up, replace the iop_unlock method with an iop_release method that is specific to transaction cancel. The existing iop_committing method occurs at the same time as iop_unlock in the commit path and there is no need for two separate callbacks here. Overload the iop_committing method with the current commit time iop_unlock implementations to eliminate the need for the latter and further simplify the interface. Signed-off-by: Christoph Hellwig <hch@lst.de> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Darrick J. Wong <darrick.wong@oracle.com> Signed-off-by: Darrick J. Wong <darrick.wong@oracle.com>
2019-06-29 10:27:32 +08:00
STATIC void
xfs_buf_item_committing(
struct xfs_log_item *lip,
xfs: xfs_log_force_lsn isn't passed a LSN In doing an investigation into AIL push stalls, I was looking at the log force code to see if an async CIL push could be done instead. This lead me to xfs_log_force_lsn() and looking at how it works. xfs_log_force_lsn() is only called from inode synchronisation contexts such as fsync(), and it takes the ip->i_itemp->ili_last_lsn value as the LSN to sync the log to. This gets passed to xlog_cil_force_lsn() via xfs_log_force_lsn() to flush the CIL to the journal, and then used by xfs_log_force_lsn() to flush the iclogs to the journal. The problem is that ip->i_itemp->ili_last_lsn does not store a log sequence number. What it stores is passed to it from the ->iop_committing method, which is called by xfs_log_commit_cil(). The value this passes to the iop_committing method is the CIL context sequence number that the item was committed to. As it turns out, xlog_cil_force_lsn() converts the sequence to an actual commit LSN for the related context and returns that to xfs_log_force_lsn(). xfs_log_force_lsn() overwrites it's "lsn" variable that contained a sequence with an actual LSN and then uses that to sync the iclogs. This caused me some confusion for a while, even though I originally wrote all this code a decade ago. ->iop_committing is only used by a couple of log item types, and only inode items use the sequence number it is passed. Let's clean up the API, CIL structures and inode log item to call it a sequence number, and make it clear that the high level code is using CIL sequence numbers and not on-disk LSNs for integrity synchronisation purposes. Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Darrick J. Wong <djwong@kernel.org> Reviewed-by: Allison Henderson <allison.henderson@oracle.com> Signed-off-by: Darrick J. Wong <djwong@kernel.org>
2021-06-18 23:21:52 +08:00
xfs_csn_t seq)
xfs: split iop_unlock The iop_unlock method is called when comitting or cancelling a transaction. In the latter case, the transaction may or may not be aborted. While there is no known problem with the current code in practice, this implementation is limited in that any log item implementation that might want to differentiate between a commit and a cancellation must rely on the aborted state. The aborted bit is only set when the cancelled transaction is dirty, however. This means that there is no way to distinguish between a commit and a clean transaction cancellation. For example, intent log items currently rely on this distinction. The log item is either transferred to the CIL on commit or released on transaction cancel. There is currently no possibility for a clean intent log item in a transaction, but if that state is ever introduced a cancel of such a transaction will immediately result in memory leaks of the associated log item(s). This is an interface deficiency and landmine. To clean this up, replace the iop_unlock method with an iop_release method that is specific to transaction cancel. The existing iop_committing method occurs at the same time as iop_unlock in the commit path and there is no need for two separate callbacks here. Overload the iop_committing method with the current commit time iop_unlock implementations to eliminate the need for the latter and further simplify the interface. Signed-off-by: Christoph Hellwig <hch@lst.de> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Darrick J. Wong <darrick.wong@oracle.com> Signed-off-by: Darrick J. Wong <darrick.wong@oracle.com>
2019-06-29 10:27:32 +08:00
{
return xfs_buf_item_release(lip);
}
/*
* This is called to find out where the oldest active copy of the
* buf log item in the on disk log resides now that the last log
* write of it completed at the given lsn.
* We always re-log all the dirty data in a buffer, so usually the
* latest copy in the on disk log is the only one that matters. For
* those cases we simply return the given lsn.
*
* The one exception to this is for buffers full of newly allocated
* inodes. These buffers are only relogged with the XFS_BLI_INODE_BUF
* flag set, indicating that only the di_next_unlinked fields from the
* inodes in the buffers will be replayed during recovery. If the
* original newly allocated inode images have not yet been flushed
* when the buffer is so relogged, then we need to make sure that we
* keep the old images in the 'active' portion of the log. We do this
* by returning the original lsn of that transaction here rather than
* the current one.
*/
STATIC xfs_lsn_t
xfs_buf_item_committed(
struct xfs_log_item *lip,
xfs_lsn_t lsn)
{
struct xfs_buf_log_item *bip = BUF_ITEM(lip);
xfs: event tracing support Convert the old xfs tracing support that could only be used with the out of tree kdb and xfsidbg patches to use the generic event tracer. To use it make sure CONFIG_EVENT_TRACING is enabled and then enable all xfs trace channels by: echo 1 > /sys/kernel/debug/tracing/events/xfs/enable or alternatively enable single events by just doing the same in one event subdirectory, e.g. echo 1 > /sys/kernel/debug/tracing/events/xfs/xfs_ihold/enable or set more complex filters, etc. In Documentation/trace/events.txt all this is desctribed in more detail. To reads the events do a cat /sys/kernel/debug/tracing/trace Compared to the last posting this patch converts the tracing mostly to the one tracepoint per callsite model that other users of the new tracing facility also employ. This allows a very fine-grained control of the tracing, a cleaner output of the traces and also enables the perf tool to use each tracepoint as a virtual performance counter, allowing us to e.g. count how often certain workloads git various spots in XFS. Take a look at http://lwn.net/Articles/346470/ for some examples. Also the btree tracing isn't included at all yet, as it will require additional core tracing features not in mainline yet, I plan to deliver it later. And the really nice thing about this patch is that it actually removes many lines of code while adding this nice functionality: fs/xfs/Makefile | 8 fs/xfs/linux-2.6/xfs_acl.c | 1 fs/xfs/linux-2.6/xfs_aops.c | 52 - fs/xfs/linux-2.6/xfs_aops.h | 2 fs/xfs/linux-2.6/xfs_buf.c | 117 +-- fs/xfs/linux-2.6/xfs_buf.h | 33 fs/xfs/linux-2.6/xfs_fs_subr.c | 3 fs/xfs/linux-2.6/xfs_ioctl.c | 1 fs/xfs/linux-2.6/xfs_ioctl32.c | 1 fs/xfs/linux-2.6/xfs_iops.c | 1 fs/xfs/linux-2.6/xfs_linux.h | 1 fs/xfs/linux-2.6/xfs_lrw.c | 87 -- fs/xfs/linux-2.6/xfs_lrw.h | 45 - fs/xfs/linux-2.6/xfs_super.c | 104 --- fs/xfs/linux-2.6/xfs_super.h | 7 fs/xfs/linux-2.6/xfs_sync.c | 1 fs/xfs/linux-2.6/xfs_trace.c | 75 ++ fs/xfs/linux-2.6/xfs_trace.h | 1369 +++++++++++++++++++++++++++++++++++++++++ fs/xfs/linux-2.6/xfs_vnode.h | 4 fs/xfs/quota/xfs_dquot.c | 110 --- fs/xfs/quota/xfs_dquot.h | 21 fs/xfs/quota/xfs_qm.c | 40 - fs/xfs/quota/xfs_qm_syscalls.c | 4 fs/xfs/support/ktrace.c | 323 --------- fs/xfs/support/ktrace.h | 85 -- fs/xfs/xfs.h | 16 fs/xfs/xfs_ag.h | 14 fs/xfs/xfs_alloc.c | 230 +----- fs/xfs/xfs_alloc.h | 27 fs/xfs/xfs_alloc_btree.c | 1 fs/xfs/xfs_attr.c | 107 --- fs/xfs/xfs_attr.h | 10 fs/xfs/xfs_attr_leaf.c | 14 fs/xfs/xfs_attr_sf.h | 40 - fs/xfs/xfs_bmap.c | 507 +++------------ fs/xfs/xfs_bmap.h | 49 - fs/xfs/xfs_bmap_btree.c | 6 fs/xfs/xfs_btree.c | 5 fs/xfs/xfs_btree_trace.h | 17 fs/xfs/xfs_buf_item.c | 87 -- fs/xfs/xfs_buf_item.h | 20 fs/xfs/xfs_da_btree.c | 3 fs/xfs/xfs_da_btree.h | 7 fs/xfs/xfs_dfrag.c | 2 fs/xfs/xfs_dir2.c | 8 fs/xfs/xfs_dir2_block.c | 20 fs/xfs/xfs_dir2_leaf.c | 21 fs/xfs/xfs_dir2_node.c | 27 fs/xfs/xfs_dir2_sf.c | 26 fs/xfs/xfs_dir2_trace.c | 216 ------ fs/xfs/xfs_dir2_trace.h | 72 -- fs/xfs/xfs_filestream.c | 8 fs/xfs/xfs_fsops.c | 2 fs/xfs/xfs_iget.c | 111 --- fs/xfs/xfs_inode.c | 67 -- fs/xfs/xfs_inode.h | 76 -- fs/xfs/xfs_inode_item.c | 5 fs/xfs/xfs_iomap.c | 85 -- fs/xfs/xfs_iomap.h | 8 fs/xfs/xfs_log.c | 181 +---- fs/xfs/xfs_log_priv.h | 20 fs/xfs/xfs_log_recover.c | 1 fs/xfs/xfs_mount.c | 2 fs/xfs/xfs_quota.h | 8 fs/xfs/xfs_rename.c | 1 fs/xfs/xfs_rtalloc.c | 1 fs/xfs/xfs_rw.c | 3 fs/xfs/xfs_trans.h | 47 + fs/xfs/xfs_trans_buf.c | 62 - fs/xfs/xfs_vnodeops.c | 8 70 files changed, 2151 insertions(+), 2592 deletions(-) Signed-off-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Alex Elder <aelder@sgi.com>
2009-12-15 07:14:59 +08:00
trace_xfs_buf_item_committed(bip);
if ((bip->bli_flags & XFS_BLI_INODE_ALLOC_BUF) && lip->li_lsn != 0)
return lip->li_lsn;
return lsn;
}
static const struct xfs_item_ops xfs_buf_item_ops = {
.iop_size = xfs_buf_item_size,
.iop_format = xfs_buf_item_format,
.iop_pin = xfs_buf_item_pin,
.iop_unpin = xfs_buf_item_unpin,
xfs: split iop_unlock The iop_unlock method is called when comitting or cancelling a transaction. In the latter case, the transaction may or may not be aborted. While there is no known problem with the current code in practice, this implementation is limited in that any log item implementation that might want to differentiate between a commit and a cancellation must rely on the aborted state. The aborted bit is only set when the cancelled transaction is dirty, however. This means that there is no way to distinguish between a commit and a clean transaction cancellation. For example, intent log items currently rely on this distinction. The log item is either transferred to the CIL on commit or released on transaction cancel. There is currently no possibility for a clean intent log item in a transaction, but if that state is ever introduced a cancel of such a transaction will immediately result in memory leaks of the associated log item(s). This is an interface deficiency and landmine. To clean this up, replace the iop_unlock method with an iop_release method that is specific to transaction cancel. The existing iop_committing method occurs at the same time as iop_unlock in the commit path and there is no need for two separate callbacks here. Overload the iop_committing method with the current commit time iop_unlock implementations to eliminate the need for the latter and further simplify the interface. Signed-off-by: Christoph Hellwig <hch@lst.de> Reviewed-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Darrick J. Wong <darrick.wong@oracle.com> Signed-off-by: Darrick J. Wong <darrick.wong@oracle.com>
2019-06-29 10:27:32 +08:00
.iop_release = xfs_buf_item_release,
.iop_committing = xfs_buf_item_committing,
.iop_committed = xfs_buf_item_committed,
.iop_push = xfs_buf_item_push,
};
STATIC void
xfs_buf_item_get_format(
struct xfs_buf_log_item *bip,
int count)
{
ASSERT(bip->bli_formats == NULL);
bip->bli_format_count = count;
if (count == 1) {
bip->bli_formats = &bip->__bli_format;
return;
}
bip->bli_formats = kmem_zalloc(count * sizeof(struct xfs_buf_log_format),
0);
}
STATIC void
xfs_buf_item_free_format(
struct xfs_buf_log_item *bip)
{
if (bip->bli_formats != &bip->__bli_format) {
kmem_free(bip->bli_formats);
bip->bli_formats = NULL;
}
}
/*
* Allocate a new buf log item to go with the given buffer.
* Set the buffer's b_log_item field to point to the new
* buf log item.
*/
int
xfs_buf_item_init(
struct xfs_buf *bp,
struct xfs_mount *mp)
{
struct xfs_buf_log_item *bip = bp->b_log_item;
int chunks;
int map_size;
int i;
/*
* Check to see if there is already a buf log item for
* this buffer. If we do already have one, there is
* nothing to do here so return.
*/
ASSERT(bp->b_mount == mp);
if (bip) {
ASSERT(bip->bli_item.li_type == XFS_LI_BUF);
ASSERT(!bp->b_transp);
ASSERT(bip->bli_buf == bp);
return 0;
}
bip = kmem_cache_zalloc(xfs_buf_item_cache, GFP_KERNEL | __GFP_NOFAIL);
xfs_log_item_init(mp, &bip->bli_item, XFS_LI_BUF, &xfs_buf_item_ops);
bip->bli_buf = bp;
/*
* chunks is the number of XFS_BLF_CHUNK size pieces the buffer
* can be divided into. Make sure not to truncate any pieces.
* map_size is the size of the bitmap needed to describe the
* chunks of the buffer.
*
* Discontiguous buffer support follows the layout of the underlying
* buffer. This makes the implementation as simple as possible.
*/
xfs_buf_item_get_format(bip, bp->b_map_count);
for (i = 0; i < bip->bli_format_count; i++) {
chunks = DIV_ROUND_UP(BBTOB(bp->b_maps[i].bm_len),
XFS_BLF_CHUNK);
map_size = DIV_ROUND_UP(chunks, NBWORD);
if (map_size > XFS_BLF_DATAMAP_SIZE) {
kmem_cache_free(xfs_buf_item_cache, bip);
xfs_err(mp,
"buffer item dirty bitmap (%u uints) too small to reflect %u bytes!",
map_size,
BBTOB(bp->b_maps[i].bm_len));
return -EFSCORRUPTED;
}
bip->bli_formats[i].blf_type = XFS_LI_BUF;
bip->bli_formats[i].blf_blkno = bp->b_maps[i].bm_bn;
bip->bli_formats[i].blf_len = bp->b_maps[i].bm_len;
bip->bli_formats[i].blf_map_size = map_size;
}
bp->b_log_item = bip;
xfs_buf_hold(bp);
return 0;
}
/*
* Mark bytes first through last inclusive as dirty in the buf
* item's bitmap.
*/
static void
xfs_buf_item_log_segment(
uint first,
uint last,
uint *map)
{
uint first_bit;
uint last_bit;
uint bits_to_set;
uint bits_set;
uint word_num;
uint *wordp;
uint bit;
uint end_bit;
uint mask;
ASSERT(first < XFS_BLF_DATAMAP_SIZE * XFS_BLF_CHUNK * NBWORD);
ASSERT(last < XFS_BLF_DATAMAP_SIZE * XFS_BLF_CHUNK * NBWORD);
/*
* Convert byte offsets to bit numbers.
*/
first_bit = first >> XFS_BLF_SHIFT;
last_bit = last >> XFS_BLF_SHIFT;
/*
* Calculate the total number of bits to be set.
*/
bits_to_set = last_bit - first_bit + 1;
/*
* Get a pointer to the first word in the bitmap
* to set a bit in.
*/
word_num = first_bit >> BIT_TO_WORD_SHIFT;
wordp = &map[word_num];
/*
* Calculate the starting bit in the first word.
*/
bit = first_bit & (uint)(NBWORD - 1);
/*
* First set any bits in the first word of our range.
* If it starts at bit 0 of the word, it will be
* set below rather than here. That is what the variable
* bit tells us. The variable bits_set tracks the number
* of bits that have been set so far. End_bit is the number
* of the last bit to be set in this word plus one.
*/
if (bit) {
end_bit = min(bit + bits_to_set, (uint)NBWORD);
xfs: fix signed integer overflow Use 1U for unsigned int to avoid a overflow warning from UBSAN. [ 31.910858] UBSAN: Undefined behaviour in fs/xfs/xfs_buf_item.c:889:25 [ 31.911252] signed integer overflow: [ 31.911478] -2147483648 - 1 cannot be represented in type 'int' [ 31.911846] CPU: 1 PID: 1011 Comm: tuned Tainted: G B ---- ------- 3.10.0-327.28.3.el7.x86_64 #1 [ 31.911857] Hardware name: VMware, Inc. VMware Virtual Platform/440BX Desktop Reference Platform, BIOS 6.00 01/07/2011 [ 31.911866] 1ffff1004069cd3b 0000000076bec3fd ffff8802034e69a0 ffffffff81ee3140 [ 31.911883] ffff8802034e69b8 ffffffff81ee31fd ffffffffa0ad79e0 ffff8802034e6b20 [ 31.911898] ffffffff81ee46e2 0000002d515470c0 0000000000000001 0000000041b58ab3 [ 31.911913] Call Trace: [ 31.911932] [<ffffffff81ee3140>] dump_stack+0x1e/0x20 [ 31.911947] [<ffffffff81ee31fd>] ubsan_epilogue+0x12/0x55 [ 31.911964] [<ffffffff81ee46e2>] handle_overflow+0x1ba/0x215 [ 31.912083] [<ffffffff81ee4798>] __ubsan_handle_sub_overflow+0x2a/0x31 [ 31.912204] [<ffffffffa08676fb>] xfs_buf_item_log+0x34b/0x3f0 [xfs] [ 31.912314] [<ffffffffa0880490>] xfs_trans_log_buf+0x120/0x260 [xfs] [ 31.912402] [<ffffffffa079a890>] xfs_btree_log_recs+0x80/0xc0 [xfs] [ 31.912490] [<ffffffffa07a29f8>] xfs_btree_delrec+0x11a8/0x2d50 [xfs] [ 31.913589] [<ffffffffa07a86f9>] xfs_btree_delete+0xc9/0x260 [xfs] [ 31.913762] [<ffffffffa075b5cf>] xfs_free_ag_extent+0x63f/0xe20 [xfs] [ 31.914339] [<ffffffffa075ec0f>] xfs_free_extent+0x2af/0x3e0 [xfs] [ 31.914641] [<ffffffffa0801b2b>] xfs_bmap_finish+0x32b/0x4b0 [xfs] [ 31.914841] [<ffffffffa083c2e7>] xfs_itruncate_extents+0x3b7/0x740 [xfs] [ 31.915216] [<ffffffffa08342fa>] xfs_setattr_size+0x60a/0x860 [xfs] [ 31.915471] [<ffffffffa08345ea>] xfs_vn_setattr+0x9a/0xe0 [xfs] [ 31.915590] [<ffffffff8149ad38>] notify_change+0x5c8/0x8a0 [ 31.915607] [<ffffffff81450f22>] do_truncate+0x122/0x1d0 [ 31.915640] [<ffffffff8147beee>] do_last+0x15de/0x2c80 [ 31.915707] [<ffffffff8147d777>] path_openat+0x1e7/0xcc0 [ 31.915802] [<ffffffff81480824>] do_filp_open+0xa4/0x160 [ 31.915848] [<ffffffff81453127>] do_sys_open+0x1b7/0x3f0 [ 31.915879] [<ffffffff81453392>] SyS_open+0x32/0x40 [ 31.915897] [<ffffffff81f08989>] system_call_fastpath+0x16/0x1b [ 240.086809] UBSAN: Undefined behaviour in fs/xfs/xfs_buf_item.c:866:34 [ 240.086820] signed integer overflow: [ 240.086830] -2147483648 - 1 cannot be represented in type 'int' [ 240.086846] CPU: 1 PID: 12969 Comm: rm Tainted: G B ---- ------- 3.10.0-327.28.3.el7.x86_64 #1 [ 240.086857] Hardware name: VMware, Inc. VMware Virtual Platform/440BX Desktop Reference Platform, BIOS 6.00 01/07/2011 [ 240.086868] 1ffff10040491def 00000000e2ea59c1 ffff88020248ef40 ffffffff81ee3140 [ 240.086885] ffff88020248ef58 ffffffff81ee31fd ffffffffa0ad79e0 ffff88020248f0c0 [ 240.086901] ffffffff81ee46e2 0000002d02488000 0000000000000001 0000000041b58ab3 [ 240.086915] Call Trace: [ 240.086938] [<ffffffff81ee3140>] dump_stack+0x1e/0x20 [ 240.086953] [<ffffffff81ee31fd>] ubsan_epilogue+0x12/0x55 [ 240.086971] [<ffffffff81ee46e2>] handle_overflow+0x1ba/0x215 ... Signed-off-by: Xie XiuQi <xiexiuqi@huawei.com> Reviewed-by: Dave Chinner <dchinner@redhat.com> Signed-off-by: Dave Chinner <david@fromorbit.com>
2016-09-14 05:41:16 +08:00
mask = ((1U << (end_bit - bit)) - 1) << bit;
*wordp |= mask;
wordp++;
bits_set = end_bit - bit;
} else {
bits_set = 0;
}
/*
* Now set bits a whole word at a time that are between
* first_bit and last_bit.
*/
while ((bits_to_set - bits_set) >= NBWORD) {
*wordp = 0xffffffff;
bits_set += NBWORD;
wordp++;
}
/*
* Finally, set any bits left to be set in one last partial word.
*/
end_bit = bits_to_set - bits_set;
if (end_bit) {
xfs: fix signed integer overflow Use 1U for unsigned int to avoid a overflow warning from UBSAN. [ 31.910858] UBSAN: Undefined behaviour in fs/xfs/xfs_buf_item.c:889:25 [ 31.911252] signed integer overflow: [ 31.911478] -2147483648 - 1 cannot be represented in type 'int' [ 31.911846] CPU: 1 PID: 1011 Comm: tuned Tainted: G B ---- ------- 3.10.0-327.28.3.el7.x86_64 #1 [ 31.911857] Hardware name: VMware, Inc. VMware Virtual Platform/440BX Desktop Reference Platform, BIOS 6.00 01/07/2011 [ 31.911866] 1ffff1004069cd3b 0000000076bec3fd ffff8802034e69a0 ffffffff81ee3140 [ 31.911883] ffff8802034e69b8 ffffffff81ee31fd ffffffffa0ad79e0 ffff8802034e6b20 [ 31.911898] ffffffff81ee46e2 0000002d515470c0 0000000000000001 0000000041b58ab3 [ 31.911913] Call Trace: [ 31.911932] [<ffffffff81ee3140>] dump_stack+0x1e/0x20 [ 31.911947] [<ffffffff81ee31fd>] ubsan_epilogue+0x12/0x55 [ 31.911964] [<ffffffff81ee46e2>] handle_overflow+0x1ba/0x215 [ 31.912083] [<ffffffff81ee4798>] __ubsan_handle_sub_overflow+0x2a/0x31 [ 31.912204] [<ffffffffa08676fb>] xfs_buf_item_log+0x34b/0x3f0 [xfs] [ 31.912314] [<ffffffffa0880490>] xfs_trans_log_buf+0x120/0x260 [xfs] [ 31.912402] [<ffffffffa079a890>] xfs_btree_log_recs+0x80/0xc0 [xfs] [ 31.912490] [<ffffffffa07a29f8>] xfs_btree_delrec+0x11a8/0x2d50 [xfs] [ 31.913589] [<ffffffffa07a86f9>] xfs_btree_delete+0xc9/0x260 [xfs] [ 31.913762] [<ffffffffa075b5cf>] xfs_free_ag_extent+0x63f/0xe20 [xfs] [ 31.914339] [<ffffffffa075ec0f>] xfs_free_extent+0x2af/0x3e0 [xfs] [ 31.914641] [<ffffffffa0801b2b>] xfs_bmap_finish+0x32b/0x4b0 [xfs] [ 31.914841] [<ffffffffa083c2e7>] xfs_itruncate_extents+0x3b7/0x740 [xfs] [ 31.915216] [<ffffffffa08342fa>] xfs_setattr_size+0x60a/0x860 [xfs] [ 31.915471] [<ffffffffa08345ea>] xfs_vn_setattr+0x9a/0xe0 [xfs] [ 31.915590] [<ffffffff8149ad38>] notify_change+0x5c8/0x8a0 [ 31.915607] [<ffffffff81450f22>] do_truncate+0x122/0x1d0 [ 31.915640] [<ffffffff8147beee>] do_last+0x15de/0x2c80 [ 31.915707] [<ffffffff8147d777>] path_openat+0x1e7/0xcc0 [ 31.915802] [<ffffffff81480824>] do_filp_open+0xa4/0x160 [ 31.915848] [<ffffffff81453127>] do_sys_open+0x1b7/0x3f0 [ 31.915879] [<ffffffff81453392>] SyS_open+0x32/0x40 [ 31.915897] [<ffffffff81f08989>] system_call_fastpath+0x16/0x1b [ 240.086809] UBSAN: Undefined behaviour in fs/xfs/xfs_buf_item.c:866:34 [ 240.086820] signed integer overflow: [ 240.086830] -2147483648 - 1 cannot be represented in type 'int' [ 240.086846] CPU: 1 PID: 12969 Comm: rm Tainted: G B ---- ------- 3.10.0-327.28.3.el7.x86_64 #1 [ 240.086857] Hardware name: VMware, Inc. VMware Virtual Platform/440BX Desktop Reference Platform, BIOS 6.00 01/07/2011 [ 240.086868] 1ffff10040491def 00000000e2ea59c1 ffff88020248ef40 ffffffff81ee3140 [ 240.086885] ffff88020248ef58 ffffffff81ee31fd ffffffffa0ad79e0 ffff88020248f0c0 [ 240.086901] ffffffff81ee46e2 0000002d02488000 0000000000000001 0000000041b58ab3 [ 240.086915] Call Trace: [ 240.086938] [<ffffffff81ee3140>] dump_stack+0x1e/0x20 [ 240.086953] [<ffffffff81ee31fd>] ubsan_epilogue+0x12/0x55 [ 240.086971] [<ffffffff81ee46e2>] handle_overflow+0x1ba/0x215 ... Signed-off-by: Xie XiuQi <xiexiuqi@huawei.com> Reviewed-by: Dave Chinner <dchinner@redhat.com> Signed-off-by: Dave Chinner <david@fromorbit.com>
2016-09-14 05:41:16 +08:00
mask = (1U << end_bit) - 1;
*wordp |= mask;
}
}
/*
* Mark bytes first through last inclusive as dirty in the buf
* item's bitmap.
*/
void
xfs_buf_item_log(
struct xfs_buf_log_item *bip,
uint first,
uint last)
{
int i;
uint start;
uint end;
struct xfs_buf *bp = bip->bli_buf;
/*
* walk each buffer segment and mark them dirty appropriately.
*/
start = 0;
for (i = 0; i < bip->bli_format_count; i++) {
if (start > last)
break;
xfs: fix broken multi-fsb buffer logging Multi-block buffers are logged based on buffer offset in xfs_trans_log_buf(). xfs_buf_item_log() ultimately walks each mapping in the buffer and marks the associated range to be logged in the xfs_buf_log_format bitmap for that mapping. This code is broken, however, in that it marks the actual buffer offsets of the associated range in each bitmap rather than shifting to the byte range for that particular mapping. For example, on a 4k fsb fs, buffer offset 4096 refers to the first byte of the second mapping in the buffer. This means byte 0 of the second log format bitmap should be tagged as dirty. Instead, the current code marks byte offset 4096 of the second log format bitmap, which is invalid and potentially out of range of the mapping. As a result of this, the log item format code invoked at transaction commit time is not be able to correctly identify what parts of the buffer to copy into log vectors. This can lead to NULL log vector pointer dereferences in CIL push context if the item format code was not able to locate any dirty ranges at all. This crash has been reproduced on a 4k FSB filesystem using 16k directory blocks where an unlink operation happened not to log anything in the first block of the mapping. The logged offsets were all over 4k, marked as such in the subsequent log format mappings, and thus left the transaction with an xfs_log_item that is marked DIRTY but without any logged regions. Further, even when the logged regions are marked correctly in the buffer log format bitmaps, the format code doesn't copy the correct ranges of the buffer into the log. This means that any logged region beyond the first block of a multi-block buffer is subject to corruption after a crash and log recovery sequence. This is due to a failure to convert the mapping bm_len field from basic blocks to bytes in the buffer offset tracking code in xfs_buf_item_format(). Update xfs_buf_item_log() to convert buffer offsets to segment relative offsets when logging multi-block buffers. This ensures that the modified regions of a buffer are logged correctly and avoids the aforementioned crash. Also update xfs_buf_item_format() to correctly track the source offset into the buffer for the log vector formatting code. This ensures that the correct data is copied into the log. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Eric Sandeen <sandeen@redhat.com> Reviewed-by: Dave Chinner <dchinner@redhat.com> Signed-off-by: Dave Chinner <david@fromorbit.com>
2016-06-01 15:38:12 +08:00
end = start + BBTOB(bp->b_maps[i].bm_len) - 1;
/* skip to the map that includes the first byte to log */
if (first > end) {
start += BBTOB(bp->b_maps[i].bm_len);
continue;
}
xfs: fix broken multi-fsb buffer logging Multi-block buffers are logged based on buffer offset in xfs_trans_log_buf(). xfs_buf_item_log() ultimately walks each mapping in the buffer and marks the associated range to be logged in the xfs_buf_log_format bitmap for that mapping. This code is broken, however, in that it marks the actual buffer offsets of the associated range in each bitmap rather than shifting to the byte range for that particular mapping. For example, on a 4k fsb fs, buffer offset 4096 refers to the first byte of the second mapping in the buffer. This means byte 0 of the second log format bitmap should be tagged as dirty. Instead, the current code marks byte offset 4096 of the second log format bitmap, which is invalid and potentially out of range of the mapping. As a result of this, the log item format code invoked at transaction commit time is not be able to correctly identify what parts of the buffer to copy into log vectors. This can lead to NULL log vector pointer dereferences in CIL push context if the item format code was not able to locate any dirty ranges at all. This crash has been reproduced on a 4k FSB filesystem using 16k directory blocks where an unlink operation happened not to log anything in the first block of the mapping. The logged offsets were all over 4k, marked as such in the subsequent log format mappings, and thus left the transaction with an xfs_log_item that is marked DIRTY but without any logged regions. Further, even when the logged regions are marked correctly in the buffer log format bitmaps, the format code doesn't copy the correct ranges of the buffer into the log. This means that any logged region beyond the first block of a multi-block buffer is subject to corruption after a crash and log recovery sequence. This is due to a failure to convert the mapping bm_len field from basic blocks to bytes in the buffer offset tracking code in xfs_buf_item_format(). Update xfs_buf_item_log() to convert buffer offsets to segment relative offsets when logging multi-block buffers. This ensures that the modified regions of a buffer are logged correctly and avoids the aforementioned crash. Also update xfs_buf_item_format() to correctly track the source offset into the buffer for the log vector formatting code. This ensures that the correct data is copied into the log. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Eric Sandeen <sandeen@redhat.com> Reviewed-by: Dave Chinner <dchinner@redhat.com> Signed-off-by: Dave Chinner <david@fromorbit.com>
2016-06-01 15:38:12 +08:00
/*
* Trim the range to this segment and mark it in the bitmap.
* Note that we must convert buffer offsets to segment relative
* offsets (e.g., the first byte of each segment is byte 0 of
* that segment).
*/
if (first < start)
first = start;
if (end > last)
end = last;
xfs: fix broken multi-fsb buffer logging Multi-block buffers are logged based on buffer offset in xfs_trans_log_buf(). xfs_buf_item_log() ultimately walks each mapping in the buffer and marks the associated range to be logged in the xfs_buf_log_format bitmap for that mapping. This code is broken, however, in that it marks the actual buffer offsets of the associated range in each bitmap rather than shifting to the byte range for that particular mapping. For example, on a 4k fsb fs, buffer offset 4096 refers to the first byte of the second mapping in the buffer. This means byte 0 of the second log format bitmap should be tagged as dirty. Instead, the current code marks byte offset 4096 of the second log format bitmap, which is invalid and potentially out of range of the mapping. As a result of this, the log item format code invoked at transaction commit time is not be able to correctly identify what parts of the buffer to copy into log vectors. This can lead to NULL log vector pointer dereferences in CIL push context if the item format code was not able to locate any dirty ranges at all. This crash has been reproduced on a 4k FSB filesystem using 16k directory blocks where an unlink operation happened not to log anything in the first block of the mapping. The logged offsets were all over 4k, marked as such in the subsequent log format mappings, and thus left the transaction with an xfs_log_item that is marked DIRTY but without any logged regions. Further, even when the logged regions are marked correctly in the buffer log format bitmaps, the format code doesn't copy the correct ranges of the buffer into the log. This means that any logged region beyond the first block of a multi-block buffer is subject to corruption after a crash and log recovery sequence. This is due to a failure to convert the mapping bm_len field from basic blocks to bytes in the buffer offset tracking code in xfs_buf_item_format(). Update xfs_buf_item_log() to convert buffer offsets to segment relative offsets when logging multi-block buffers. This ensures that the modified regions of a buffer are logged correctly and avoids the aforementioned crash. Also update xfs_buf_item_format() to correctly track the source offset into the buffer for the log vector formatting code. This ensures that the correct data is copied into the log. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Eric Sandeen <sandeen@redhat.com> Reviewed-by: Dave Chinner <dchinner@redhat.com> Signed-off-by: Dave Chinner <david@fromorbit.com>
2016-06-01 15:38:12 +08:00
xfs_buf_item_log_segment(first - start, end - start,
&bip->bli_formats[i].blf_data_map[0]);
xfs: fix broken multi-fsb buffer logging Multi-block buffers are logged based on buffer offset in xfs_trans_log_buf(). xfs_buf_item_log() ultimately walks each mapping in the buffer and marks the associated range to be logged in the xfs_buf_log_format bitmap for that mapping. This code is broken, however, in that it marks the actual buffer offsets of the associated range in each bitmap rather than shifting to the byte range for that particular mapping. For example, on a 4k fsb fs, buffer offset 4096 refers to the first byte of the second mapping in the buffer. This means byte 0 of the second log format bitmap should be tagged as dirty. Instead, the current code marks byte offset 4096 of the second log format bitmap, which is invalid and potentially out of range of the mapping. As a result of this, the log item format code invoked at transaction commit time is not be able to correctly identify what parts of the buffer to copy into log vectors. This can lead to NULL log vector pointer dereferences in CIL push context if the item format code was not able to locate any dirty ranges at all. This crash has been reproduced on a 4k FSB filesystem using 16k directory blocks where an unlink operation happened not to log anything in the first block of the mapping. The logged offsets were all over 4k, marked as such in the subsequent log format mappings, and thus left the transaction with an xfs_log_item that is marked DIRTY but without any logged regions. Further, even when the logged regions are marked correctly in the buffer log format bitmaps, the format code doesn't copy the correct ranges of the buffer into the log. This means that any logged region beyond the first block of a multi-block buffer is subject to corruption after a crash and log recovery sequence. This is due to a failure to convert the mapping bm_len field from basic blocks to bytes in the buffer offset tracking code in xfs_buf_item_format(). Update xfs_buf_item_log() to convert buffer offsets to segment relative offsets when logging multi-block buffers. This ensures that the modified regions of a buffer are logged correctly and avoids the aforementioned crash. Also update xfs_buf_item_format() to correctly track the source offset into the buffer for the log vector formatting code. This ensures that the correct data is copied into the log. Signed-off-by: Brian Foster <bfoster@redhat.com> Reviewed-by: Eric Sandeen <sandeen@redhat.com> Reviewed-by: Dave Chinner <dchinner@redhat.com> Signed-off-by: Dave Chinner <david@fromorbit.com>
2016-06-01 15:38:12 +08:00
start += BBTOB(bp->b_maps[i].bm_len);
}
}
/*
* Return true if the buffer has any ranges logged/dirtied by a transaction,
* false otherwise.
*/
bool
xfs_buf_item_dirty_format(
struct xfs_buf_log_item *bip)
{
int i;
for (i = 0; i < bip->bli_format_count; i++) {
if (!xfs_bitmap_empty(bip->bli_formats[i].blf_data_map,
bip->bli_formats[i].blf_map_size))
return true;
}
return false;
}
STATIC void
xfs_buf_item_free(
struct xfs_buf_log_item *bip)
{
xfs_buf_item_free_format(bip);
xfs: allocate log vector buffers outside CIL context lock One of the problems we currently have with delayed logging is that under serious memory pressure we can deadlock memory reclaim. THis occurs when memory reclaim (such as run by kswapd) is reclaiming XFS inodes and issues a log force to unpin inodes that are dirty in the CIL. The CIL is pushed, but this will only occur once it gets the CIL context lock to ensure that all committing transactions are complete and no new transactions start being committed to the CIL while the push switches to a new context. The deadlock occurs when the CIL context lock is held by a committing process that is doing memory allocation for log vector buffers, and that allocation is then blocked on memory reclaim making progress. Memory reclaim, however, is blocked waiting for a log force to make progress, and so we effectively deadlock at this point. To solve this problem, we have to move the CIL log vector buffer allocation outside of the context lock so that memory reclaim can always make progress when it needs to force the log. The problem with doing this is that a CIL push can take place while we are determining if we need to allocate a new log vector buffer for an item and hence the current log vector may go away without warning. That means we canot rely on the existing log vector being present when we finally grab the context lock and so we must have a replacement buffer ready to go at all times. To ensure this, introduce a "shadow log vector" buffer that is always guaranteed to be present when we gain the CIL context lock and format the item. This shadow buffer may or may not be used during the formatting, but if the log item does not have an existing log vector buffer or that buffer is too small for the new modifications, we swap it for the new shadow buffer and format the modifications into that new log vector buffer. The result of this is that for any object we modify more than once in a given CIL checkpoint, we double the memory required to track dirty regions in the log. For single modifications then we consume the shadow log vectorwe allocate on commit, and that gets consumed by the checkpoint. However, if we make multiple modifications, then the second transaction commit will allocate a shadow log vector and hence we will end up with double the memory usage as only one of the log vectors is consumed by the CIL checkpoint. The remaining shadow vector will be freed when th elog item is freed. This can probably be optimised in future - access to the shadow log vector is serialised by the object lock (as opposited to the active log vector, which is controlled by the CIL context lock) and so we can probably free shadow log vector from some objects when the log item is marked clean on removal from the AIL. Signed-off-by: Dave Chinner <dchinner@redhat.com> Reviewed-by: Brian Foster <bfoster@redhat.com> Signed-off-by: Dave Chinner <david@fromorbit.com>
2016-07-22 07:52:35 +08:00
kmem_free(bip->bli_item.li_lv_shadow);
kmem_cache_free(xfs_buf_item_cache, bip);
}
/*
* xfs_buf_item_relse() is called when the buf log item is no longer needed.
*/
void
xfs_buf_item_relse(
struct xfs_buf *bp)
{
struct xfs_buf_log_item *bip = bp->b_log_item;
xfs: event tracing support Convert the old xfs tracing support that could only be used with the out of tree kdb and xfsidbg patches to use the generic event tracer. To use it make sure CONFIG_EVENT_TRACING is enabled and then enable all xfs trace channels by: echo 1 > /sys/kernel/debug/tracing/events/xfs/enable or alternatively enable single events by just doing the same in one event subdirectory, e.g. echo 1 > /sys/kernel/debug/tracing/events/xfs/xfs_ihold/enable or set more complex filters, etc. In Documentation/trace/events.txt all this is desctribed in more detail. To reads the events do a cat /sys/kernel/debug/tracing/trace Compared to the last posting this patch converts the tracing mostly to the one tracepoint per callsite model that other users of the new tracing facility also employ. This allows a very fine-grained control of the tracing, a cleaner output of the traces and also enables the perf tool to use each tracepoint as a virtual performance counter, allowing us to e.g. count how often certain workloads git various spots in XFS. Take a look at http://lwn.net/Articles/346470/ for some examples. Also the btree tracing isn't included at all yet, as it will require additional core tracing features not in mainline yet, I plan to deliver it later. And the really nice thing about this patch is that it actually removes many lines of code while adding this nice functionality: fs/xfs/Makefile | 8 fs/xfs/linux-2.6/xfs_acl.c | 1 fs/xfs/linux-2.6/xfs_aops.c | 52 - fs/xfs/linux-2.6/xfs_aops.h | 2 fs/xfs/linux-2.6/xfs_buf.c | 117 +-- fs/xfs/linux-2.6/xfs_buf.h | 33 fs/xfs/linux-2.6/xfs_fs_subr.c | 3 fs/xfs/linux-2.6/xfs_ioctl.c | 1 fs/xfs/linux-2.6/xfs_ioctl32.c | 1 fs/xfs/linux-2.6/xfs_iops.c | 1 fs/xfs/linux-2.6/xfs_linux.h | 1 fs/xfs/linux-2.6/xfs_lrw.c | 87 -- fs/xfs/linux-2.6/xfs_lrw.h | 45 - fs/xfs/linux-2.6/xfs_super.c | 104 --- fs/xfs/linux-2.6/xfs_super.h | 7 fs/xfs/linux-2.6/xfs_sync.c | 1 fs/xfs/linux-2.6/xfs_trace.c | 75 ++ fs/xfs/linux-2.6/xfs_trace.h | 1369 +++++++++++++++++++++++++++++++++++++++++ fs/xfs/linux-2.6/xfs_vnode.h | 4 fs/xfs/quota/xfs_dquot.c | 110 --- fs/xfs/quota/xfs_dquot.h | 21 fs/xfs/quota/xfs_qm.c | 40 - fs/xfs/quota/xfs_qm_syscalls.c | 4 fs/xfs/support/ktrace.c | 323 --------- fs/xfs/support/ktrace.h | 85 -- fs/xfs/xfs.h | 16 fs/xfs/xfs_ag.h | 14 fs/xfs/xfs_alloc.c | 230 +----- fs/xfs/xfs_alloc.h | 27 fs/xfs/xfs_alloc_btree.c | 1 fs/xfs/xfs_attr.c | 107 --- fs/xfs/xfs_attr.h | 10 fs/xfs/xfs_attr_leaf.c | 14 fs/xfs/xfs_attr_sf.h | 40 - fs/xfs/xfs_bmap.c | 507 +++------------ fs/xfs/xfs_bmap.h | 49 - fs/xfs/xfs_bmap_btree.c | 6 fs/xfs/xfs_btree.c | 5 fs/xfs/xfs_btree_trace.h | 17 fs/xfs/xfs_buf_item.c | 87 -- fs/xfs/xfs_buf_item.h | 20 fs/xfs/xfs_da_btree.c | 3 fs/xfs/xfs_da_btree.h | 7 fs/xfs/xfs_dfrag.c | 2 fs/xfs/xfs_dir2.c | 8 fs/xfs/xfs_dir2_block.c | 20 fs/xfs/xfs_dir2_leaf.c | 21 fs/xfs/xfs_dir2_node.c | 27 fs/xfs/xfs_dir2_sf.c | 26 fs/xfs/xfs_dir2_trace.c | 216 ------ fs/xfs/xfs_dir2_trace.h | 72 -- fs/xfs/xfs_filestream.c | 8 fs/xfs/xfs_fsops.c | 2 fs/xfs/xfs_iget.c | 111 --- fs/xfs/xfs_inode.c | 67 -- fs/xfs/xfs_inode.h | 76 -- fs/xfs/xfs_inode_item.c | 5 fs/xfs/xfs_iomap.c | 85 -- fs/xfs/xfs_iomap.h | 8 fs/xfs/xfs_log.c | 181 +---- fs/xfs/xfs_log_priv.h | 20 fs/xfs/xfs_log_recover.c | 1 fs/xfs/xfs_mount.c | 2 fs/xfs/xfs_quota.h | 8 fs/xfs/xfs_rename.c | 1 fs/xfs/xfs_rtalloc.c | 1 fs/xfs/xfs_rw.c | 3 fs/xfs/xfs_trans.h | 47 + fs/xfs/xfs_trans_buf.c | 62 - fs/xfs/xfs_vnodeops.c | 8 70 files changed, 2151 insertions(+), 2592 deletions(-) Signed-off-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Alex Elder <aelder@sgi.com>
2009-12-15 07:14:59 +08:00
trace_xfs_buf_item_relse(bp, _RET_IP_);
ASSERT(!test_bit(XFS_LI_IN_AIL, &bip->bli_item.li_flags));
xfs: event tracing support Convert the old xfs tracing support that could only be used with the out of tree kdb and xfsidbg patches to use the generic event tracer. To use it make sure CONFIG_EVENT_TRACING is enabled and then enable all xfs trace channels by: echo 1 > /sys/kernel/debug/tracing/events/xfs/enable or alternatively enable single events by just doing the same in one event subdirectory, e.g. echo 1 > /sys/kernel/debug/tracing/events/xfs/xfs_ihold/enable or set more complex filters, etc. In Documentation/trace/events.txt all this is desctribed in more detail. To reads the events do a cat /sys/kernel/debug/tracing/trace Compared to the last posting this patch converts the tracing mostly to the one tracepoint per callsite model that other users of the new tracing facility also employ. This allows a very fine-grained control of the tracing, a cleaner output of the traces and also enables the perf tool to use each tracepoint as a virtual performance counter, allowing us to e.g. count how often certain workloads git various spots in XFS. Take a look at http://lwn.net/Articles/346470/ for some examples. Also the btree tracing isn't included at all yet, as it will require additional core tracing features not in mainline yet, I plan to deliver it later. And the really nice thing about this patch is that it actually removes many lines of code while adding this nice functionality: fs/xfs/Makefile | 8 fs/xfs/linux-2.6/xfs_acl.c | 1 fs/xfs/linux-2.6/xfs_aops.c | 52 - fs/xfs/linux-2.6/xfs_aops.h | 2 fs/xfs/linux-2.6/xfs_buf.c | 117 +-- fs/xfs/linux-2.6/xfs_buf.h | 33 fs/xfs/linux-2.6/xfs_fs_subr.c | 3 fs/xfs/linux-2.6/xfs_ioctl.c | 1 fs/xfs/linux-2.6/xfs_ioctl32.c | 1 fs/xfs/linux-2.6/xfs_iops.c | 1 fs/xfs/linux-2.6/xfs_linux.h | 1 fs/xfs/linux-2.6/xfs_lrw.c | 87 -- fs/xfs/linux-2.6/xfs_lrw.h | 45 - fs/xfs/linux-2.6/xfs_super.c | 104 --- fs/xfs/linux-2.6/xfs_super.h | 7 fs/xfs/linux-2.6/xfs_sync.c | 1 fs/xfs/linux-2.6/xfs_trace.c | 75 ++ fs/xfs/linux-2.6/xfs_trace.h | 1369 +++++++++++++++++++++++++++++++++++++++++ fs/xfs/linux-2.6/xfs_vnode.h | 4 fs/xfs/quota/xfs_dquot.c | 110 --- fs/xfs/quota/xfs_dquot.h | 21 fs/xfs/quota/xfs_qm.c | 40 - fs/xfs/quota/xfs_qm_syscalls.c | 4 fs/xfs/support/ktrace.c | 323 --------- fs/xfs/support/ktrace.h | 85 -- fs/xfs/xfs.h | 16 fs/xfs/xfs_ag.h | 14 fs/xfs/xfs_alloc.c | 230 +----- fs/xfs/xfs_alloc.h | 27 fs/xfs/xfs_alloc_btree.c | 1 fs/xfs/xfs_attr.c | 107 --- fs/xfs/xfs_attr.h | 10 fs/xfs/xfs_attr_leaf.c | 14 fs/xfs/xfs_attr_sf.h | 40 - fs/xfs/xfs_bmap.c | 507 +++------------ fs/xfs/xfs_bmap.h | 49 - fs/xfs/xfs_bmap_btree.c | 6 fs/xfs/xfs_btree.c | 5 fs/xfs/xfs_btree_trace.h | 17 fs/xfs/xfs_buf_item.c | 87 -- fs/xfs/xfs_buf_item.h | 20 fs/xfs/xfs_da_btree.c | 3 fs/xfs/xfs_da_btree.h | 7 fs/xfs/xfs_dfrag.c | 2 fs/xfs/xfs_dir2.c | 8 fs/xfs/xfs_dir2_block.c | 20 fs/xfs/xfs_dir2_leaf.c | 21 fs/xfs/xfs_dir2_node.c | 27 fs/xfs/xfs_dir2_sf.c | 26 fs/xfs/xfs_dir2_trace.c | 216 ------ fs/xfs/xfs_dir2_trace.h | 72 -- fs/xfs/xfs_filestream.c | 8 fs/xfs/xfs_fsops.c | 2 fs/xfs/xfs_iget.c | 111 --- fs/xfs/xfs_inode.c | 67 -- fs/xfs/xfs_inode.h | 76 -- fs/xfs/xfs_inode_item.c | 5 fs/xfs/xfs_iomap.c | 85 -- fs/xfs/xfs_iomap.h | 8 fs/xfs/xfs_log.c | 181 +---- fs/xfs/xfs_log_priv.h | 20 fs/xfs/xfs_log_recover.c | 1 fs/xfs/xfs_mount.c | 2 fs/xfs/xfs_quota.h | 8 fs/xfs/xfs_rename.c | 1 fs/xfs/xfs_rtalloc.c | 1 fs/xfs/xfs_rw.c | 3 fs/xfs/xfs_trans.h | 47 + fs/xfs/xfs_trans_buf.c | 62 - fs/xfs/xfs_vnodeops.c | 8 70 files changed, 2151 insertions(+), 2592 deletions(-) Signed-off-by: Christoph Hellwig <hch@lst.de> Signed-off-by: Alex Elder <aelder@sgi.com>
2009-12-15 07:14:59 +08:00
bp->b_log_item = NULL;
xfs_buf_rele(bp);
xfs_buf_item_free(bip);
}
void
xfs_buf_item_done(
struct xfs_buf *bp)
{
/*
* If we are forcibly shutting down, this may well be off the AIL
* already. That's because we simulate the log-committed callbacks to
* unpin these buffers. Or we may never have put this item on AIL
* because of the transaction was aborted forcibly.
* xfs_trans_ail_delete() takes care of these.
*
* Either way, AIL is useless if we're forcing a shutdown.
*
* Note that log recovery writes might have buffer items that are not on
* the AIL even when the file system is not shut down.
*/
xfs_trans_ail_delete(&bp->b_log_item->bli_item,
(bp->b_flags & _XBF_LOGRECOVERY) ? 0 :
SHUTDOWN_CORRUPT_INCORE);
xfs_buf_item_relse(bp);
}