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The XFS_SB_FEAT_INCOMPAT_LOG_XATTRS feature bit protects a filesystem
from old kernels that do not know how to recover extended attribute log
intent items. Make this check mandatory instead of a debugging assert.
Fixes: fd920008784ea ("xfs: Set up infrastructure for log attribute replay")
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Reviewed-by: Christoph Hellwig <hch@lst.de>
Christoph noticed that the xfs_attr_is_leaf in xfs_attr_get_ilocked can
access the incore extent tree of the attr fork, but nothing in the
xfs_attr_get path guarantees that the incore tree is actually loaded.
Most of the time it is, but seeing as xfs_attr_is_leaf ignores the
return value of xfs_iext_get_extent I guess we've been making choices
based on random stack contents and nobody's complained?
Reported-by: Christoph Hellwig <hch@lst.de>
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Reviewed-by: Christoph Hellwig <hch@lst.de>
A few notes about struct xfs_da_args:
The XFS_ATTR_* flags only go up as far as XFS_ATTR_INCOMPLETE, which
means that attr_filter could be a u8 field.
I've reduced the number of XFS_DA_OP_* flags down to the point where
op_flags would also fit into a u8.
filetype has 7 bytes of slack after it, which is wasteful.
namelen will never be greater than MAXNAMELEN, which is 256. This field
could be reduced to a short.
Rearrange the fields in xfs_da_args to waste less space. This reduces
the structure size from 136 bytes to 128. Later when we add extra
fields to support parent pointer replacement, this will only bloat the
structure to 144 bytes, instead of 168.
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Reviewed-by: Christoph Hellwig <hch@lst.de>
Parent pointers match attrs on name+value, unlike everything else which
matches on only the name. Therefore, we cannot keep using the heuristic
that !value means remove. Make this an explicit operation code.
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Reviewed-by: Christoph Hellwig <hch@lst.de>
This field only ever contains XATTR_{CREATE,REPLACE}, and it only goes
as deep as xfs_attr_set. Remove the field from the structure and
replace it with an enum specifying exactly what kind of change we want
to make to the xattr structure. Upsert is the name that we'll give to
the flags==0 operation, because we're either updating an existing value
or inserting it, and the caller doesn't care.
Note: The "UPSERTR" name created here is to make userspace porting
easier. It will be removed in the next patch.
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Reviewed-by: Christoph Hellwig <hch@lst.de>
The only user of this flag sets it prior to an xfs_attr_get_ilocked
call, which doesn't update anything. Get rid of the flag.
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Reviewed-by: Christoph Hellwig <hch@lst.de>
Commit aff3a9edb708 ("xfs: Use preallocation for inodes with extsz
hints") disabled delayed allocation for all inodes with extent size
hints due a data exposure problem. It turns out we fixed this data
exposure problem since by always creating unwritten extents for
delalloc conversions due to more data exposure problems, but the
writeback path doesn't actually support extent size hints when
converting delalloc these days, which probably isn't a problem given
that people using the hints know what they get.
However due to the way how xfs_get_extsz_hint is implemented, it
always claims an extent size hint for RT inodes even if the RT
extent size is a single FSB. Due to that the above commit effectively
disabled delalloc support for RT inodes.
Switch xfs_get_extsz_hint to return 0 for this case and work around
that in a few places to reinstate delalloc support for RT inodes on
file systems with an sb_rextsize of 1.
Signed-off-by: Christoph Hellwig <hch@lst.de>
Reviewed-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: "Darrick J. Wong" <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
When xfs_bmap_del_extent_delay has to split an indirect block it tries
to steal blocks from the the part that gets unmapped to increase the
indirect block reservation that now needs to cover for two extents
instead of one.
This works perfectly fine on the data device, where the data and
indirect blocks come from the same pool. It has no chance of working
when the inode sits on the RT device. To support re-enabling delalloc
for inodes on the RT device, make this behavior conditional on not
being for rt extents.
Note that split of delalloc extents should only happen on writeback
failure, as for other kinds of hole punching we first write back all
data and thus convert the delalloc reservations covering the hole to
a real allocation.
Signed-off-by: Christoph Hellwig <hch@lst.de>
Reviewed-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: "Darrick J. Wong" <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
Move the check if we have enough indirect blocks and the stealing of
the deleted extent blocks out of xfs_bmap_split_indlen and into the
caller to prepare for handling delayed allocation of RT extents that
can't easily be stolen.
Signed-off-by: Christoph Hellwig <hch@lst.de>
Reviewed-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: "Darrick J. Wong" <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
Add a check for files on the RT subvolume and use m_frextents instead
of m_fdblocks to adjust the preallocation size.
Signed-off-by: Christoph Hellwig <hch@lst.de>
Reviewed-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: "Darrick J. Wong" <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
To prepare for re-enabling delalloc on RT devices, track the data blocks
(which use the RT device when the inode sits on it) and the indirect
blocks (which don't) separately to xfs_mod_delalloc, and add a new
percpu counter to also track the RT delalloc blocks.
Signed-off-by: Christoph Hellwig <hch@lst.de>
Reviewed-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: "Darrick J. Wong" <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
The code to account fdblocks and frextents in xfs_bmap_del_extent_delay
is a bit weird in that it accounts frextents before the iext tree
manipulations and fdblocks after it. Given that the iext tree
manipulations cannot fail currently that's not really a problem, but
still odd. Move the frextent manipulation to the end, and use a
fdblocks variable to account of the unconditional indirect blocks and
the data blocks only freed for !RT. This prepares for following
updates in the area and already makes the code more readable.
Also remove the !isrt assert given that this code clearly handles
rt extents correctly, and we'll soon reinstate delalloc support for
RT inodes.
Signed-off-by: Christoph Hellwig <hch@lst.de>
Reviewed-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: "Darrick J. Wong" <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
Allocate data blocks for RT inodes using xfs_dec_frextents. While at
it optimize the data device case by doing only a single xfs_dec_fdblocks
call for the extent itself and the indirect blocks.
Signed-off-by: Christoph Hellwig <hch@lst.de>
Reviewed-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: "Darrick J. Wong" <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
xfs_mod_freecounter has two entirely separate code paths for adding or
subtracting from the free counters. Only the subtract case looks at the
rsvd flag and can return an error.
Split xfs_mod_freecounter into separate helpers for subtracting or
adding the freecounter, and remove all the impossible to reach error
handling for the addition case.
Signed-off-by: Christoph Hellwig <hch@lst.de>
Reviewed-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: "Darrick J. Wong" <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
And to make that more clear, rearrange the code a bit and add asserts
and a comment.
Signed-off-by: Christoph Hellwig <hch@lst.de>
Reviewed-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: "Darrick J. Wong" <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
__xfs_bunmapi is a bit of an odd place to lock the rtbitmap and rtsummary
inodes given that it is very high level code. While this only looks ugly
right now, it will become a problem when supporting delayed allocations
for RT inodes as __xfs_bunmapi might end up deleting only delalloc extents
and thus never unlock the rt inodes.
Move the locking into xfs_bmap_del_extent_real just before the call to
xfs_rtfree_blocks instead and use a new flag in the transaction to ensure
that the locking happens only once.
Signed-off-by: Christoph Hellwig <hch@lst.de>
Reviewed-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: "Darrick J. Wong" <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
Currently xfs_bmap_del_extent_real frees RT extents before updating
the bmap btree, while it frees regular blocks after performing the bmap
btree update for convoluted historic reasons. Switch to free the RT
blocks in the same place as the regular data blocks instead to simply
the code and fix a very theoretical bug.
A short history of this code researched by Dave Chiner below:
The truncate for data device extents was originally a two-phase
operation. First it removed the bmapbt record, but because this can
free BMBT extents, it can use up all the free space tree reservation
space. So the transaction gets rolled to commit the BMBT change and
the xfs_bmap_finish() call that frees the data extent runs with a
new transaction reservation that allows different free space btrees
to be logged without overrun.
However, on crash, this could lose the free space because there was
nothing to tell recovery about the extents removed from the BMBT,
hence EFIs were introduced. They tie the extent free operation to the
bmapbt record removal commit for recovery of the second phase of the
extent removal process.
Then RT extents came along. RT extent freeing does not require a
free space btree reservation because the free space metadata is
static and transaction size is bound. Hence we don't need to care if
the BMBT record removal modifies the per-ag free space trees and we
don't need a two-phase extent remove transaction. The only thing we
have to care about is not losing space on crash.
Hence instead of recording the extent for freeing in the bmap list
for xfs_bmap_finish() to process in a new transaction, it simply
freed the rtextent directly. So the original code (from 1994) simply
replaced the "free AG extent later" queueing with a direct free.
This code was originally at the start of xfs_dmap_del_extent(), but
the xfs_bmap_add_free() got moved to the end of the function via the
"do_fx" flag (the current code logic) in 1997 (commit c4fac74eaa58
in the historic xfs-import tree) because there was a shutdown occurring
because of a case where splitting the extent record failed because the
BMBT split and the filesystem didn't have enough space for the split to
be done. (FWIW, I'm not sure this can happen anymore.)
The commit backed out the BMBT change on ENOSPC error, and in doing
so I think this actually breaks RT free space tracking. However, it
then returns an ENOSPC error, and we have a dirty transaction in the
RT case so this will shut down the filesysetm when the transaction
is cancelled. Hence the corrupted "bmbt now points at freed rt dev
space" condition never make it to disk, but it's still the wrong way
to handle the issue.
IOWs, this proposed change fixes that "shutdown at ENOSPC on rt
devices" situation that was introduced by the above commit back in
1997.
Signed-off-by: Christoph Hellwig <hch@lst.de>
Reviewed-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: "Darrick J. Wong" <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
Create helper functions to deal with locking realtime metadata inodes.
This enables us to maintain correct locking order once we start adding
the realtime rmap and refcount btree inodes.
Signed-off-by: "Darrick J. Wong" <djwong@kernel.org>
Signed-off-by: Christoph Hellwig <hch@lst.de>
Reviewed-by: Dave Chinner <dchinner@redhat.com>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
Commit bb7b1c9c5dd3 ("xfs: tag transactions that contain intent done
items") switched the XFS_TRANS_ definitions to be bit based, and using
comments above the definitions. As XFS_TRANS_LOWMODE was last and has
a big fat comment it was missed. Switch it to the same style.
Signed-off-by: Christoph Hellwig <hch@lst.de>
Reviewed-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: "Darrick J. Wong" <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
Add a few strategic IS_ENABLED statements to let the compiler eliminate
unused code when CONFIG_XFS_SUPPORT_V4 is disabled.
This saves multiple kilobytes of .text in my .config:
$ size xfs.o.*
text data bss dec hex filename
1363633 294836 592 1659061 1950b5 xfs.o.new
1371453 294868 592 1666913 196f61 xfs.o.old
Signed-off-by: Christoph Hellwig <hch@lst.de>
Reviewed-by: "Darrick J. Wong" <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
Signed-off-by: Christoph Hellwig <hch@lst.de>
Reviewed-by: "Darrick J. Wong" <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
The current structure of xfs_extent_busy_clear that locks the first busy
extent in each AG and unlocks when switching to a new AG makes sparse
unhappy as the lock critical section tracking can't cope with taking the
lock conditionally and inside a loop.
Rewrite xfs_extent_busy_clear so that it has an outer loop only advancing
when moving to a new AG, and an inner loop that consumes busy extents for
the given AG to make life easier for sparse and to also make this logic
more obvious to humans.
Signed-off-by: Christoph Hellwig <hch@lst.de>
Reviewed-by: "Darrick J. Wong" <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
Move the handling of discarded entries into xfs_extent_busy_clear_one
to reuse the length check and tidy up the logic in the caller.
Signed-off-by: Christoph Hellwig <hch@lst.de>
Reviewed-by: "Darrick J. Wong" <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
The function are defined in the rmap_repair.c file, but not called
elsewhere, so delete the unused function.
fs/xfs/scrub/rmap_repair.c:436:1: warning: unused function 'is_rt_data_fork'.
Reported-by: Abaci Robot <abaci@linux.alibaba.com>
Closes: https://bugzilla.openanolis.cn/show_bug.cgi?id=8425
Signed-off-by: Jiapeng Chong <jiapeng.chong@linux.alibaba.com>
Reviewed-by: "Darrick J. Wong" <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
The "mp" pointer is the same as "sc->mp" so this change doesn't affect
runtime at all. However, it's nicer to use same name for both the lock
and the unlock.
Signed-off-by: Dan Carpenter <dan.carpenter@linaro.org>
Reviewed-by: Christoph Hellwig <hch@lst.de>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
Sparse throws warnings about the interval tree functions that are
defined and then not used in the scrub bitmap code:
fs/xfs/scrub/bitmap.c:57:1: warning: unused function 'xbitmap64_tree_iter_next' [-Wunused-function]
INTERVAL_TREE_DEFINE(struct xbitmap64_node, bn_rbnode, uint64_t,
^
./include/linux/interval_tree_generic.h:151:33: note: expanded from macro 'INTERVAL_TREE_DEFINE'
ITSTATIC ITSTRUCT * \
^
<scratch space>:3:1: note: expanded from here
xbitmap64_tree_iter_next
^
fs/xfs/scrub/bitmap.c:331:1: warning: unused function 'xbitmap32_tree_iter_next' [-Wunused-function]
INTERVAL_TREE_DEFINE(struct xbitmap32_node, bn_rbnode, uint32_t,
^
./include/linux/interval_tree_generic.h:151:33: note: expanded from macro 'INTERVAL_TREE_DEFINE'
ITSTATIC ITSTRUCT * \
^
<scratch space>:59:1: note: expanded from here
xbitmap32_tree_iter_next
Fix these by marking the functions created by the interval tree
creation macro as __maybe_unused to suppress this warning.
Signed-off-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: "Darrick J. Wong" <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
Scrub checks the superblock version number against the known good
feature bits that can be set in the version mask. It calculates
the version mask to compare like so:
vernum_mask = cpu_to_be16(~XFS_SB_VERSION_OKBITS |
XFS_SB_VERSION_NUMBITS |
XFS_SB_VERSION_ALIGNBIT |
XFS_SB_VERSION_DALIGNBIT |
XFS_SB_VERSION_SHAREDBIT |
XFS_SB_VERSION_LOGV2BIT |
XFS_SB_VERSION_SECTORBIT |
XFS_SB_VERSION_EXTFLGBIT |
XFS_SB_VERSION_DIRV2BIT);
This generates a sparse warning:
fs/xfs/scrub/agheader.c:168:23: warning: cast truncates bits from constant value (ffff3f8f becomes 3f8f)
This is because '~XFS_SB_VERSION_OKBITS' is considered a 32 bit
constant, even though it's value is always under 16 bits.
This is a kinda silly thing to do, because:
/*
* Supported feature bit list is just all bits in the versionnum field because
* we've used them all up and understand them all. Except, of course, for the
* shared superblock bit, which nobody knows what it does and so is unsupported.
*/
#define XFS_SB_VERSION_OKBITS \
((XFS_SB_VERSION_NUMBITS | XFS_SB_VERSION_ALLFBITS) & \
~XFS_SB_VERSION_SHAREDBIT)
#define XFS_SB_VERSION_NUMBITS 0x000f
#define XFS_SB_VERSION_ALLFBITS 0xfff0
#define XFS_SB_VERSION_SHAREDBIT 0x0200
XFS_SB_VERSION_OKBITS has a value of 0xfdff, and so
~XFS_SB_VERSION_OKBITS == XFS_SB_VERSION_SHAREDBIT. The calculated
mask already sets XFS_SB_VERSION_SHAREDBIT, so starting with
~XFS_SB_VERSION_OKBITS is completely redundant....
Signed-off-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: Christoph Hellwig <hch@lst.de>
Reviewed-by: "Darrick J. Wong" <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
Sparse reports:
fs/xfs/xfs_log_cil.c:1127:1: warning: context imbalance in 'xlog_cil_push_work' - different lock contexts for basic block
fs/xfs/xfs_log_cil.c:1380:1: warning: context imbalance in 'xlog_cil_push_background' - wrong count at exit
fs/xfs/xfs_log_cil.c:1623:9: warning: context imbalance in 'xlog_cil_commit' - unexpected unlock
xlog_cil_push_background() has a locking annotations for an rw_sem.
Sparse does not track lock contexts for rw_sems, so the
annotation generates false warnings. Remove the annotation.
xlog_wait_on_iclog() drops the log->l_ic_loglock. The function has a
sparse annotation, but the prototype in xfs_log_priv.h does not.
Hence the warning from xlog_cil_push_work() which calls
xlog_wait_on_iclog(). Add the missing annotation.
Signed-off-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: Christoph Hellwig <hch@lst.de>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
This series changes the directory update code to retain the ILOCK on all
files involved in a rename until the end of the operation. The upcoming
parent pointers patchset applies parent pointers in a separate chained
update from the actual directory update, which is why it is now
necessary to keep the ILOCK instead of dropping it after the first
transaction in the chain.
As a side effect, we no longer need to hold the IOLOCK during an rmapbt
scan of inodes to serialize the scan with ongoing directory updates.
This has been running on the djcloud for months with no problems. Enjoy!
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
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Merge tag 'retain-ilock-during-dir-ops-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux into xfs-6.10-mergeA
xfs: retain ILOCK during directory updates
This series changes the directory update code to retain the ILOCK on all
files involved in a rename until the end of the operation. The upcoming
parent pointers patchset applies parent pointers in a separate chained
update from the actual directory update, which is why it is now
necessary to keep the ILOCK instead of dropping it after the first
transaction in the chain.
As a side effect, we no longer need to hold the IOLOCK during an rmapbt
scan of inodes to serialize the scan with ongoing directory updates.
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
* tag 'retain-ilock-during-dir-ops-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux:
xfs: unlock new repair tempfiles after creation
xfs: don't pick up IOLOCK during rmapbt repair scan
xfs: Hold inode locks in xfs_rename
xfs: Hold inode locks in xfs_trans_alloc_dir
xfs: Hold inode locks in xfs_ialloc
xfs: Increase XFS_QM_TRANS_MAXDQS to 5
xfs: Increase XFS_DEFER_OPS_NR_INODES to 5
This series updates the design documentation for online fsck to reflect
the final design of the parent pointers feature as well as the
implementation of online fsck for the new metadata.
This has been running on the djcloud for months with no problems. Enjoy!
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
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Merge tag 'online-fsck-design-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux into xfs-6.10-mergeA
xfs: design documentation for online fsck, part 2
This series updates the design documentation for online fsck to reflect
the final design of the parent pointers feature as well as the
implementation of online fsck for the new metadata.
This has been running on the djcloud for months with no problems. Enjoy!
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
* tag 'online-fsck-design-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux:
docs: describe xfs directory tree online fsck
docs: update offline parent pointer repair strategy
docs: update online directory and parent pointer repair sections
docs: update the parent pointers documentation to the final version
Congratulations! You have made it to the final patchset of the main
online fsck feature! This patchset fixes some stalling behavior that I
observed when running FITRIM against large flash-based filesystems with
very heavily fragmented free space data. In summary -- the current
fstrim implementation optimizes for trimming the largest free extents
first, and holds the AGF lock for the duration of the operation. This
is great if fstrim is being run as a foreground process by a sysadmin.
For xfs_scrub, however, this isn't so good -- we don't really want to
block on one huge kernel call while reporting no progress information.
We don't want to hold the AGF so long that background processes stall.
These problems are easily fixable by issuing smaller FITRIM calls, but
there's still the problem of walking the entire cntbt. To solve that
second problem, we introduce a new sub-AG FITRIM implementation. To
solve the first problem, make it relax the AGF periodically.
This has been running on the djcloud for months with no problems. Enjoy!
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
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Merge tag 'discard-relax-locks-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux into xfs-6.10-mergeA
xfs: less heavy locks during fstrim
Congratulations! You have made it to the final patchset of the main
online fsck feature! This patchset fixes some stalling behavior that I
observed when running FITRIM against large flash-based filesystems with
very heavily fragmented free space data. In summary -- the current
fstrim implementation optimizes for trimming the largest free extents
first, and holds the AGF lock for the duration of the operation. This
is great if fstrim is being run as a foreground process by a sysadmin.
For xfs_scrub, however, this isn't so good -- we don't really want to
block on one huge kernel call while reporting no progress information.
We don't want to hold the AGF so long that background processes stall.
These problems are easily fixable by issuing smaller FITRIM calls, but
there's still the problem of walking the entire cntbt. To solve that
second problem, we introduce a new sub-AG FITRIM implementation. To
solve the first problem, make it relax the AGF periodically.
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
* tag 'discard-relax-locks-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux:
xfs: fix performance problems when fstrimming a subset of a fragmented AG
While doing QA of the online fsck code, I made a few observations:
First, nobody was checking that the di_onlink field is actually zero;
Second, that allocating a temporary file for repairs can fail (and
thus bring down the entire fs) if the inode cluster is corrupt; and
Third, that file link counts do not pin at ~0U to prevent integer
overflows. Fourth, the x{chk,rep}_metadata_inode_fork functions
should be subclassing the main scrub context, not modifying the
parent's setup willy-nilly.
This scattered patchset fixes those three problems.
This has been running on the djcloud for months with no problems. Enjoy!
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
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Merge tag 'inode-repair-improvements-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux into xfs-6.10-mergeA
xfs: inode-related repair fixes
While doing QA of the online fsck code, I made a few observations:
First, nobody was checking that the di_onlink field is actually zero;
Second, that allocating a temporary file for repairs can fail (and
thus bring down the entire fs) if the inode cluster is corrupt; and
Third, that file link counts do not pin at ~0U to prevent integer
overflows. Fourth, the x{chk,rep}_metadata_inode_fork functions
should be subclassing the main scrub context, not modifying the
parent's setup willy-nilly.
This scattered patchset fixes those three problems.
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
* tag 'inode-repair-improvements-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux:
xfs: create subordinate scrub contexts for xchk_metadata_inode_subtype
xfs: pin inodes that would otherwise overflow link count
xfs: try to avoid allocating from sick inode clusters
xfs: check unused nlink fields in the ondisk inode
This series enhances the AGI scrub code to check the unlinked inode
bucket lists for errors, and fixes them if necessary. Now that iunlink
pointer updates are virtual log items, we can batch updates pretty
efficiently in the logging code.
This has been running on the djcloud for months with no problems. Enjoy!
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
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Merge tag 'repair-iunlink-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux into xfs-6.10-mergeA
xfs: online fsck of iunlink buckets
This series enhances the AGI scrub code to check the unlinked inode
bucket lists for errors, and fixes them if necessary. Now that iunlink
pointer updates are virtual log items, we can batch updates pretty
efficiently in the logging code.
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
* tag 'repair-iunlink-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux:
xfs: repair AGI unlinked inode bucket lists
xfs: hoist AGI repair context to a heap object
xfs: check AGI unlinked inode buckets
The patches in this set adds the ability to repair the target buffer of
a symbolic link, using the same salvage, rebuild, and swap strategy used
everywhere else.
This has been running on the djcloud for months with no problems. Enjoy!
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
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Merge tag 'repair-symlink-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux into xfs-6.10-mergeA
xfs: online repair of symbolic links
The patches in this set adds the ability to repair the target buffer of
a symbolic link, using the same salvage, rebuild, and swap strategy used
everywhere else.
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
* tag 'repair-symlink-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux:
xfs: online repair of symbolic links
xfs: pass the owner to xfs_symlink_write_target
xfs: expose xfs_bmap_local_to_extents for online repair
Orphaned files are defined to be files with nonzero ondisk link count
but no observable parent directory. This series enables online repair
to reparent orphaned files into the filesystem directory tree, and wires
up this reparenting ability into the directory, file link count, and
parent pointer repair functions. This is how we fix files with positive
link count that are not reachable through the directory tree.
This patch will also create the orphanage directory (lost+found) if it
is not present. In contrast to xfs_repair, we follow e2fsck in creating
the lost+found without group or other-owner access to avoid accidental
disclosure of files that were previously hidden by an 0700 directory.
That's silly security, but people have been known to do it.
This has been running on the djcloud for months with no problems. Enjoy!
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
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Merge tag 'repair-orphanage-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux into xfs-6.10-mergeA
xfs: move orphan files to lost and found
Orphaned files are defined to be files with nonzero ondisk link count
but no observable parent directory. This series enables online repair
to reparent orphaned files into the filesystem directory tree, and wires
up this reparenting ability into the directory, file link count, and
parent pointer repair functions. This is how we fix files with positive
link count that are not reachable through the directory tree.
This patch will also create the orphanage directory (lost+found) if it
is not present. In contrast to xfs_repair, we follow e2fsck in creating
the lost+found without group or other-owner access to avoid accidental
disclosure of files that were previously hidden by an 0700 directory.
That's silly security, but people have been known to do it.
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
* tag 'repair-orphanage-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux:
xfs: ensure dentry consistency when the orphanage adopts a file
xfs: move files to orphanage instead of letting nlinks drop to zero
xfs: move orphan files to the orphanage
This series employs atomic extent swapping to enable safe reconstruction
of directory data. For now, XFS does not support reverse directory
links (aka parent pointers), so we can only salvage the dirents of a
directory and construct a new structure.
Directory repair therefore consists of five main parts:
First, we walk the existing directory to salvage as many entries as we
can, by adding them as new directory entries to the repair temp dir.
Second, we validate the parent pointer found in the directory. If one
was not found, we scan the entire filesystem looking for a potential
parent.
Third, we use atomic extent swaps to exchange the entire data fork
between the two directories.
Fourth, we reap the old directory blocks as carefully as we can.
To wrap up the directory repair code, we need to add to the regular
filesystem the ability to free all the data fork blocks in a directory.
This does not change anything with normal directories, since they must
still unlink and shrink one entry at a time. However, this will
facilitate freeing of partially-inactivated temporary directories during
log recovery.
The second half of this patchset implements repairs for the dotdot
entries of directories. For now there is only rudimentary support for
this, because there are no directory parent pointers, so the best we can
do is scanning the filesystem and the VFS dcache for answers.
This has been running on the djcloud for months with no problems. Enjoy!
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
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Merge tag 'repair-dirs-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux into xfs-6.10-mergeA
xfs: online repair of directories
This series employs atomic extent swapping to enable safe reconstruction
of directory data. For now, XFS does not support reverse directory
links (aka parent pointers), so we can only salvage the dirents of a
directory and construct a new structure.
Directory repair therefore consists of five main parts:
First, we walk the existing directory to salvage as many entries as we
can, by adding them as new directory entries to the repair temp dir.
Second, we validate the parent pointer found in the directory. If one
was not found, we scan the entire filesystem looking for a potential
parent.
Third, we use atomic extent swaps to exchange the entire data fork
between the two directories.
Fourth, we reap the old directory blocks as carefully as we can.
To wrap up the directory repair code, we need to add to the regular
filesystem the ability to free all the data fork blocks in a directory.
This does not change anything with normal directories, since they must
still unlink and shrink one entry at a time. However, this will
facilitate freeing of partially-inactivated temporary directories during
log recovery.
The second half of this patchset implements repairs for the dotdot
entries of directories. For now there is only rudimentary support for
this, because there are no directory parent pointers, so the best we can
do is scanning the filesystem and the VFS dcache for answers.
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
* tag 'repair-dirs-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux:
xfs: ask the dentry cache if it knows the parent of a directory
xfs: online repair of parent pointers
xfs: scan the filesystem to repair a directory dotdot entry
xfs: online repair of directories
xfs: inactivate directory data blocks
This series adds some logic to the inode scrubbers so that they can
detect and deal with consistency errors between the link count and the
per-inode unlinked list state. The helpers needed to do this are
presented here because they are a prequisite for rebuildng directories,
since we need to get a rebuilt non-empty directory off the unlinked
list.
Note that this patchset does not provide comprehensive reconstruction of
the AGI unlinked list; that is coming in a subsequent patchset.
This has been running on the djcloud for months with no problems. Enjoy!
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
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Merge tag 'repair-unlinked-inode-state-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux into xfs-6.10-mergeA
xfs: online repair of inode unlinked state
This series adds some logic to the inode scrubbers so that they can
detect and deal with consistency errors between the link count and the
per-inode unlinked list state. The helpers needed to do this are
presented here because they are a prequisite for rebuildng directories,
since we need to get a rebuilt non-empty directory off the unlinked
list.
Note that this patchset does not provide comprehensive reconstruction of
the AGI unlinked list; that is coming in a subsequent patchset.
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
* tag 'repair-unlinked-inode-state-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux:
xfs: update the unlinked list when repairing link counts
xfs: ensure unlinked list state is consistent with nlink during scrub
This series employs atomic extent swapping to enable safe reconstruction
of extended attribute data attached to a file. Because xattrs do not
have any redundant information to draw off of, we can at best salvage
as much data as we can and build a new structure.
Rebuilding an extended attribute structure consists of these three
steps:
First, we walk the existing attributes to salvage as many of them as we
can, by adding them as new attributes attached to the repair tempfile.
We need to add a new xfile-based data structure to hold blobs of
arbitrary length to stage the xattr names and values.
Second, we write the salvaged attributes to a temporary file, and use
atomic extent swaps to exchange the entire attribute fork between the
two files.
Finally, we reap the old xattr blocks (which are now in the temporary
file) as carefully as we can.
This has been running on the djcloud for months with no problems. Enjoy!
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
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Merge tag 'repair-xattrs-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux into xfs-6.10-mergeA
xfs: online repair of extended attributes
This series employs atomic extent swapping to enable safe reconstruction
of extended attribute data attached to a file. Because xattrs do not
have any redundant information to draw off of, we can at best salvage
as much data as we can and build a new structure.
Rebuilding an extended attribute structure consists of these three
steps:
First, we walk the existing attributes to salvage as many of them as we
can, by adding them as new attributes attached to the repair tempfile.
We need to add a new xfile-based data structure to hold blobs of
arbitrary length to stage the xattr names and values.
Second, we write the salvaged attributes to a temporary file, and use
atomic extent swaps to exchange the entire attribute fork between the
two files.
Finally, we reap the old xattr blocks (which are now in the temporary
file) as carefully as we can.
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
* tag 'repair-xattrs-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux:
xfs: create an xattr iteration function for scrub
xfs: flag empty xattr leaf blocks for optimization
xfs: scrub should set preen if attr leaf has holes
xfs: repair extended attributes
xfs: use atomic extent swapping to fix user file fork data
xfs: create a blob array data structure
xfs: enable discarding of folios backing an xfile
There are a couple of significant changes that need to be made to the
directory and xattr code before we can support online repairs of those
data structures.
The first change is because online repair is designed to use libxfs to
create a replacement dir/xattr structure in a temporary file, and use
atomic extent swapping to commit the corrected structure. To avoid the
performance hit of walking every block of the new structure to rewrite
the owner number before the swap, we instead change libxfs to allow
callers of the dir and xattr code the ability to set an explicit owner
number to be written into the header fields of any new blocks that are
created. For regular operation this will be the directory inode number.
The second change is to update the dir/xattr code to actually *check*
the owner number in each block that is read off the disk, since we don't
currently do that.
This has been running on the djcloud for months with no problems. Enjoy!
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
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Merge tag 'dirattr-validate-owners-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux into xfs-6.10-mergeA
xfs: set and validate dir/attr block owners
There are a couple of significant changes that need to be made to the
directory and xattr code before we can support online repairs of those
data structures.
The first change is because online repair is designed to use libxfs to
create a replacement dir/xattr structure in a temporary file, and use
atomic extent swapping to commit the corrected structure. To avoid the
performance hit of walking every block of the new structure to rewrite
the owner number before the swap, we instead change libxfs to allow
callers of the dir and xattr code the ability to set an explicit owner
number to be written into the header fields of any new blocks that are
created. For regular operation this will be the directory inode number.
The second change is to update the dir/xattr code to actually *check*
the owner number in each block that is read off the disk, since we don't
currently do that.
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
* tag 'dirattr-validate-owners-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux:
xfs: validate explicit directory free block owners
xfs: validate explicit directory block buffer owners
xfs: validate explicit directory data buffer owners
xfs: validate directory leaf buffer owners
xfs: validate dabtree node buffer owners
xfs: validate attr remote value buffer owners
xfs: validate attr leaf buffer owners
xfs: reduce indenting in xfs_attr_node_list
xfs: use the xfs_da_args owner field to set new dir/attr block owner
xfs: add an explicit owner field to xfs_da_args
We now have all the infrastructure we need to repair file metadata.
We'll begin with the realtime summary file, because it is the least
complex data structure. To support this we need to add three more
pieces to the temporary file code from the previous patchset --
preallocating space in the temp file, formatting metadata into that
space and writing the blocks to disk, and swapping the fork mappings
atomically.
After that, the actual reconstruction of the realtime summary
information is pretty simple, since we can simply write the incore
copy computed by the rtsummary scrubber to the temporary file, swap the
contents, and reap the old blocks.
This has been running on the djcloud for months with no problems. Enjoy!
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
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Merge tag 'repair-rtsummary-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux into xfs-6.10-mergeA
xfs: online repair of realtime summaries
We now have all the infrastructure we need to repair file metadata.
We'll begin with the realtime summary file, because it is the least
complex data structure. To support this we need to add three more
pieces to the temporary file code from the previous patchset --
preallocating space in the temp file, formatting metadata into that
space and writing the blocks to disk, and swapping the fork mappings
atomically.
After that, the actual reconstruction of the realtime summary
information is pretty simple, since we can simply write the incore
copy computed by the rtsummary scrubber to the temporary file, swap the
contents, and reap the old blocks.
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
* tag 'repair-rtsummary-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux:
xfs: online repair of realtime summaries
xfs: teach the tempfile to set up atomic file content exchanges
xfs: support preallocating and copying content into temporary files
As mentioned earlier, the repair strategy for file-based metadata is to
build a new copy in a temporary file and swap the file fork mappings
with the metadata inode. We've built the atomic extent swap facility,
so now we need to build a facility for handling private temporary files.
The first step is to teach the filesystem to ignore the temporary files.
We'll mark them as PRIVATE in the VFS so that the kernel security
modules will leave it alone. The second step is to add the online
repair code the ability to create a temporary file and reap extents from
the temporary file after the extent swap.
This has been running on the djcloud for months with no problems. Enjoy!
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
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Merge tag 'repair-tempfiles-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux into xfs-6.10-mergeA
xfs: create temporary files for online repair
As mentioned earlier, the repair strategy for file-based metadata is to
build a new copy in a temporary file and swap the file fork mappings
with the metadata inode. We've built the atomic extent swap facility,
so now we need to build a facility for handling private temporary files.
The first step is to teach the filesystem to ignore the temporary files.
We'll mark them as PRIVATE in the VFS so that the kernel security
modules will leave it alone. The second step is to add the online
repair code the ability to create a temporary file and reap extents from
the temporary file after the extent swap.
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
* tag 'repair-tempfiles-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux:
xfs: add the ability to reap entire inode forks
xfs: refactor live buffer invalidation for repairs
xfs: create temporary files and directories for online repair
xfs: hide private inodes from bulkstat and handle functions
This series creates a new XFS_IOC_EXCHANGE_RANGE ioctl to exchange
ranges of bytes between two files atomically.
This new functionality enables data storage programs to stage and commit
file updates such that reader programs will see either the old contents
or the new contents in their entirety, with no chance of torn writes. A
successful call completion guarantees that the new contents will be seen
even if the system fails.
The ability to exchange file fork mappings between files in this manner
is critical to supporting online filesystem repair, which is built upon
the strategy of constructing a clean copy of a damaged structure and
committing the new structure into the metadata file atomically. The
ioctls exist to facilitate testing of the new functionality and to
enable future application program designs.
User programs will be able to update files atomically by opening an
O_TMPFILE, reflinking the source file to it, making whatever updates
they want to make, and exchange the relevant ranges of the temp file
with the original file. If the updates are aligned with the file block
size, a new (since v2) flag provides for exchanging only the written
areas. Note that application software must quiesce writes to the file
while it stages an atomic update. This will be addressed by a
subsequent series.
This mechanism solves the clunkiness of two existing atomic file update
mechanisms: for O_TRUNC + rewrite, this eliminates the brief period
where other programs can see an empty file. For create tempfile +
rename, the need to copy file attributes and extended attributes for
each file update is eliminated.
However, this method introduces its own awkwardness -- any program
initiating an exchange now needs to have a way to signal to other
programs that the file contents have changed. For file access mediated
via read and write, fanotify or inotify are probably sufficient. For
mmaped files, that may not be fast enough.
Here is the proposed manual page:
IOCTL-XFS-EXCHANGE-RANGE(2System Calls ManuIOCTL-XFS-EXCHANGE-RANGE(2)
NAME
ioctl_xfs_exchange_range - exchange the contents of parts of
two files
SYNOPSIS
#include <sys/ioctl.h>
#include <xfs/xfs_fs.h>
int ioctl(int file2_fd, XFS_IOC_EXCHANGE_RANGE, struct xfs_ex‐
change_range *arg);
DESCRIPTION
Given a range of bytes in a first file file1_fd and a second
range of bytes in a second file file2_fd, this ioctl(2) ex‐
changes the contents of the two ranges.
Exchanges are atomic with regards to concurrent file opera‐
tions. Implementations must guarantee that readers see either
the old contents or the new contents in their entirety, even if
the system fails.
The system call parameters are conveyed in structures of the
following form:
struct xfs_exchange_range {
__s32 file1_fd;
__u32 pad;
__u64 file1_offset;
__u64 file2_offset;
__u64 length;
__u64 flags;
};
The field pad must be zero.
The fields file1_fd, file1_offset, and length define the first
range of bytes to be exchanged.
The fields file2_fd, file2_offset, and length define the second
range of bytes to be exchanged.
Both files must be from the same filesystem mount. If the two
file descriptors represent the same file, the byte ranges must
not overlap. Most disk-based filesystems require that the
starts of both ranges must be aligned to the file block size.
If this is the case, the ends of the ranges must also be so
aligned unless the XFS_EXCHANGE_RANGE_TO_EOF flag is set.
The field flags control the behavior of the exchange operation.
XFS_EXCHANGE_RANGE_TO_EOF
Ignore the length parameter. All bytes in file1_fd
from file1_offset to EOF are moved to file2_fd, and
file2's size is set to (file2_offset+(file1_length-
file1_offset)). Meanwhile, all bytes in file2 from
file2_offset to EOF are moved to file1 and file1's
size is set to (file1_offset+(file2_length-
file2_offset)).
XFS_EXCHANGE_RANGE_DSYNC
Ensure that all modified in-core data in both file
ranges and all metadata updates pertaining to the
exchange operation are flushed to persistent storage
before the call returns. Opening either file de‐
scriptor with O_SYNC or O_DSYNC will have the same
effect.
XFS_EXCHANGE_RANGE_FILE1_WRITTEN
Only exchange sub-ranges of file1_fd that are known
to contain data written by application software.
Each sub-range may be expanded (both upwards and
downwards) to align with the file allocation unit.
For files on the data device, this is one filesystem
block. For files on the realtime device, this is
the realtime extent size. This facility can be used
to implement fast atomic scatter-gather writes of
any complexity for software-defined storage targets
if all writes are aligned to the file allocation
unit.
XFS_EXCHANGE_RANGE_DRY_RUN
Check the parameters and the feasibility of the op‐
eration, but do not change anything.
RETURN VALUE
On error, -1 is returned, and errno is set to indicate the er‐
ror.
ERRORS
Error codes can be one of, but are not limited to, the follow‐
ing:
EBADF file1_fd is not open for reading and writing or is open
for append-only writes; or file2_fd is not open for
reading and writing or is open for append-only writes.
EINVAL The parameters are not correct for these files. This
error can also appear if either file descriptor repre‐
sents a device, FIFO, or socket. Disk filesystems gen‐
erally require the offset and length arguments to be
aligned to the fundamental block sizes of both files.
EIO An I/O error occurred.
EISDIR One of the files is a directory.
ENOMEM The kernel was unable to allocate sufficient memory to
perform the operation.
ENOSPC There is not enough free space in the filesystem ex‐
change the contents safely.
EOPNOTSUPP
The filesystem does not support exchanging bytes between
the two files.
EPERM file1_fd or file2_fd are immutable.
ETXTBSY
One of the files is a swap file.
EUCLEAN
The filesystem is corrupt.
EXDEV file1_fd and file2_fd are not on the same mounted
filesystem.
CONFORMING TO
This API is XFS-specific.
USE CASES
Several use cases are imagined for this system call. In all
cases, application software must coordinate updates to the file
because the exchange is performed unconditionally.
The first is a data storage program that wants to commit non-
contiguous updates to a file atomically and coordinates write
access to that file. This can be done by creating a temporary
file, calling FICLONE(2) to share the contents, and staging the
updates into the temporary file. The FULL_FILES flag is recom‐
mended for this purpose. The temporary file can be deleted or
punched out afterwards.
An example program might look like this:
int fd = open("/some/file", O_RDWR);
int temp_fd = open("/some", O_TMPFILE | O_RDWR);
ioctl(temp_fd, FICLONE, fd);
/* append 1MB of records */
lseek(temp_fd, 0, SEEK_END);
write(temp_fd, data1, 1000000);
/* update record index */
pwrite(temp_fd, data1, 600, 98765);
pwrite(temp_fd, data2, 320, 54321);
pwrite(temp_fd, data2, 15, 0);
/* commit the entire update */
struct xfs_exchange_range args = {
.file1_fd = temp_fd,
.flags = XFS_EXCHANGE_RANGE_TO_EOF,
};
ioctl(fd, XFS_IOC_EXCHANGE_RANGE, &args);
The second is a software-defined storage host (e.g. a disk
jukebox) which implements an atomic scatter-gather write com‐
mand. Provided the exported disk's logical block size matches
the file's allocation unit size, this can be done by creating a
temporary file and writing the data at the appropriate offsets.
It is recommended that the temporary file be truncated to the
size of the regular file before any writes are staged to the
temporary file to avoid issues with zeroing during EOF exten‐
sion. Use this call with the FILE1_WRITTEN flag to exchange
only the file allocation units involved in the emulated de‐
vice's write command. The temporary file should be truncated
or punched out completely before being reused to stage another
write.
An example program might look like this:
int fd = open("/some/file", O_RDWR);
int temp_fd = open("/some", O_TMPFILE | O_RDWR);
struct stat sb;
int blksz;
fstat(fd, &sb);
blksz = sb.st_blksize;
/* land scatter gather writes between 100fsb and 500fsb */
pwrite(temp_fd, data1, blksz * 2, blksz * 100);
pwrite(temp_fd, data2, blksz * 20, blksz * 480);
pwrite(temp_fd, data3, blksz * 7, blksz * 257);
/* commit the entire update */
struct xfs_exchange_range args = {
.file1_fd = temp_fd,
.file1_offset = blksz * 100,
.file2_offset = blksz * 100,
.length = blksz * 400,
.flags = XFS_EXCHANGE_RANGE_FILE1_WRITTEN |
XFS_EXCHANGE_RANGE_FILE1_DSYNC,
};
ioctl(fd, XFS_IOC_EXCHANGE_RANGE, &args);
NOTES
Some filesystems may limit the amount of data or the number of
extents that can be exchanged in a single call.
SEE ALSO
ioctl(2)
XFS 2024-02-10 IOCTL-XFS-EXCHANGE-RANGE(2)
The reference implementation in XFS creates a new log incompat feature
and log intent items to track high level progress of swapping ranges of
two files and finish interrupted work if the system goes down. Sample
code can be found in the corresponding changes to xfs_io to exercise the
use case mentioned above.
Note that this function is /not/ the O_DIRECT atomic untorn file writes
concept that has also been floating around for years. It is also not
the RWF_ATOMIC patchset that has been shared. This RFC is constructed
entirely in software, which means that there are no limitations other
than the general filesystem limits.
As a side note, the original motivation behind the kernel functionality
is online repair of file-based metadata. The atomic file content
exchange is implemented as an atomic exchange of file fork mappings,
which means that we can implement online reconstruction of extended
attributes and directories by building a new one in another inode and
exchanging the contents.
Subsequent patchsets adapt the online filesystem repair code to use
atomic file exchanges. This enables repair functions to construct a
clean copy of a directory, xattr information, symbolic links, realtime
bitmaps, and realtime summary information in a temporary inode. If this
completes successfully, the new contents can be committed atomically
into the inode being repaired. This is essential to avoid making
corruption problems worse if the system goes down in the middle of
running repair.
For userspace, this series also includes the userspace pieces needed to
test the new functionality, and a sample implementation of atomic file
updates.
This has been running on the djcloud for months with no problems. Enjoy!
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
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Merge tag 'atomic-file-updates-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux into xfs-6.10-mergeA
xfs: atomic file content exchanges
This series creates a new XFS_IOC_EXCHANGE_RANGE ioctl to exchange
ranges of bytes between two files atomically.
This new functionality enables data storage programs to stage and commit
file updates such that reader programs will see either the old contents
or the new contents in their entirety, with no chance of torn writes. A
successful call completion guarantees that the new contents will be seen
even if the system fails.
The ability to exchange file fork mappings between files in this manner
is critical to supporting online filesystem repair, which is built upon
the strategy of constructing a clean copy of a damaged structure and
committing the new structure into the metadata file atomically. The
ioctls exist to facilitate testing of the new functionality and to
enable future application program designs.
User programs will be able to update files atomically by opening an
O_TMPFILE, reflinking the source file to it, making whatever updates
they want to make, and exchange the relevant ranges of the temp file
with the original file. If the updates are aligned with the file block
size, a new (since v2) flag provides for exchanging only the written
areas. Note that application software must quiesce writes to the file
while it stages an atomic update. This will be addressed by a
subsequent series.
This mechanism solves the clunkiness of two existing atomic file update
mechanisms: for O_TRUNC + rewrite, this eliminates the brief period
where other programs can see an empty file. For create tempfile +
rename, the need to copy file attributes and extended attributes for
each file update is eliminated.
However, this method introduces its own awkwardness -- any program
initiating an exchange now needs to have a way to signal to other
programs that the file contents have changed. For file access mediated
via read and write, fanotify or inotify are probably sufficient. For
mmaped files, that may not be fast enough.
Here is the proposed manual page:
IOCTL-XFS-EXCHANGE-RANGE(2System Calls ManuIOCTL-XFS-EXCHANGE-RANGE(2)
NAME
ioctl_xfs_exchange_range - exchange the contents of parts of
two files
SYNOPSIS
#include <sys/ioctl.h>
#include <xfs/xfs_fs.h>
int ioctl(int file2_fd, XFS_IOC_EXCHANGE_RANGE, struct xfs_ex‐
change_range *arg);
DESCRIPTION
Given a range of bytes in a first file file1_fd and a second
range of bytes in a second file file2_fd, this ioctl(2) ex‐
changes the contents of the two ranges.
Exchanges are atomic with regards to concurrent file opera‐
tions. Implementations must guarantee that readers see either
the old contents or the new contents in their entirety, even if
the system fails.
The system call parameters are conveyed in structures of the
following form:
struct xfs_exchange_range {
__s32 file1_fd;
__u32 pad;
__u64 file1_offset;
__u64 file2_offset;
__u64 length;
__u64 flags;
};
The field pad must be zero.
The fields file1_fd, file1_offset, and length define the first
range of bytes to be exchanged.
The fields file2_fd, file2_offset, and length define the second
range of bytes to be exchanged.
Both files must be from the same filesystem mount. If the two
file descriptors represent the same file, the byte ranges must
not overlap. Most disk-based filesystems require that the
starts of both ranges must be aligned to the file block size.
If this is the case, the ends of the ranges must also be so
aligned unless the XFS_EXCHANGE_RANGE_TO_EOF flag is set.
The field flags control the behavior of the exchange operation.
XFS_EXCHANGE_RANGE_TO_EOF
Ignore the length parameter. All bytes in file1_fd
from file1_offset to EOF are moved to file2_fd, and
file2's size is set to (file2_offset+(file1_length-
file1_offset)). Meanwhile, all bytes in file2 from
file2_offset to EOF are moved to file1 and file1's
size is set to (file1_offset+(file2_length-
file2_offset)).
XFS_EXCHANGE_RANGE_DSYNC
Ensure that all modified in-core data in both file
ranges and all metadata updates pertaining to the
exchange operation are flushed to persistent storage
before the call returns. Opening either file de‐
scriptor with O_SYNC or O_DSYNC will have the same
effect.
XFS_EXCHANGE_RANGE_FILE1_WRITTEN
Only exchange sub-ranges of file1_fd that are known
to contain data written by application software.
Each sub-range may be expanded (both upwards and
downwards) to align with the file allocation unit.
For files on the data device, this is one filesystem
block. For files on the realtime device, this is
the realtime extent size. This facility can be used
to implement fast atomic scatter-gather writes of
any complexity for software-defined storage targets
if all writes are aligned to the file allocation
unit.
XFS_EXCHANGE_RANGE_DRY_RUN
Check the parameters and the feasibility of the op‐
eration, but do not change anything.
RETURN VALUE
On error, -1 is returned, and errno is set to indicate the er‐
ror.
ERRORS
Error codes can be one of, but are not limited to, the follow‐
ing:
EBADF file1_fd is not open for reading and writing or is open
for append-only writes; or file2_fd is not open for
reading and writing or is open for append-only writes.
EINVAL The parameters are not correct for these files. This
error can also appear if either file descriptor repre‐
sents a device, FIFO, or socket. Disk filesystems gen‐
erally require the offset and length arguments to be
aligned to the fundamental block sizes of both files.
EIO An I/O error occurred.
EISDIR One of the files is a directory.
ENOMEM The kernel was unable to allocate sufficient memory to
perform the operation.
ENOSPC There is not enough free space in the filesystem ex‐
change the contents safely.
EOPNOTSUPP
The filesystem does not support exchanging bytes between
the two files.
EPERM file1_fd or file2_fd are immutable.
ETXTBSY
One of the files is a swap file.
EUCLEAN
The filesystem is corrupt.
EXDEV file1_fd and file2_fd are not on the same mounted
filesystem.
CONFORMING TO
This API is XFS-specific.
USE CASES
Several use cases are imagined for this system call. In all
cases, application software must coordinate updates to the file
because the exchange is performed unconditionally.
The first is a data storage program that wants to commit non-
contiguous updates to a file atomically and coordinates write
access to that file. This can be done by creating a temporary
file, calling FICLONE(2) to share the contents, and staging the
updates into the temporary file. The FULL_FILES flag is recom‐
mended for this purpose. The temporary file can be deleted or
punched out afterwards.
An example program might look like this:
int fd = open("/some/file", O_RDWR);
int temp_fd = open("/some", O_TMPFILE | O_RDWR);
ioctl(temp_fd, FICLONE, fd);
/* append 1MB of records */
lseek(temp_fd, 0, SEEK_END);
write(temp_fd, data1, 1000000);
/* update record index */
pwrite(temp_fd, data1, 600, 98765);
pwrite(temp_fd, data2, 320, 54321);
pwrite(temp_fd, data2, 15, 0);
/* commit the entire update */
struct xfs_exchange_range args = {
.file1_fd = temp_fd,
.flags = XFS_EXCHANGE_RANGE_TO_EOF,
};
ioctl(fd, XFS_IOC_EXCHANGE_RANGE, &args);
The second is a software-defined storage host (e.g. a disk
jukebox) which implements an atomic scatter-gather write com‐
mand. Provided the exported disk's logical block size matches
the file's allocation unit size, this can be done by creating a
temporary file and writing the data at the appropriate offsets.
It is recommended that the temporary file be truncated to the
size of the regular file before any writes are staged to the
temporary file to avoid issues with zeroing during EOF exten‐
sion. Use this call with the FILE1_WRITTEN flag to exchange
only the file allocation units involved in the emulated de‐
vice's write command. The temporary file should be truncated
or punched out completely before being reused to stage another
write.
An example program might look like this:
int fd = open("/some/file", O_RDWR);
int temp_fd = open("/some", O_TMPFILE | O_RDWR);
struct stat sb;
int blksz;
fstat(fd, &sb);
blksz = sb.st_blksize;
/* land scatter gather writes between 100fsb and 500fsb */
pwrite(temp_fd, data1, blksz * 2, blksz * 100);
pwrite(temp_fd, data2, blksz * 20, blksz * 480);
pwrite(temp_fd, data3, blksz * 7, blksz * 257);
/* commit the entire update */
struct xfs_exchange_range args = {
.file1_fd = temp_fd,
.file1_offset = blksz * 100,
.file2_offset = blksz * 100,
.length = blksz * 400,
.flags = XFS_EXCHANGE_RANGE_FILE1_WRITTEN |
XFS_EXCHANGE_RANGE_FILE1_DSYNC,
};
ioctl(fd, XFS_IOC_EXCHANGE_RANGE, &args);
NOTES
Some filesystems may limit the amount of data or the number of
extents that can be exchanged in a single call.
SEE ALSO
ioctl(2)
XFS 2024-02-10 IOCTL-XFS-EXCHANGE-RANGE(2)
The reference implementation in XFS creates a new log incompat feature
and log intent items to track high level progress of swapping ranges of
two files and finish interrupted work if the system goes down. Sample
code can be found in the corresponding changes to xfs_io to exercise the
use case mentioned above.
Note that this function is /not/ the O_DIRECT atomic untorn file writes
concept that has also been floating around for years. It is also not
the RWF_ATOMIC patchset that has been shared. This RFC is constructed
entirely in software, which means that there are no limitations other
than the general filesystem limits.
As a side note, the original motivation behind the kernel functionality
is online repair of file-based metadata. The atomic file content
exchange is implemented as an atomic exchange of file fork mappings,
which means that we can implement online reconstruction of extended
attributes and directories by building a new one in another inode and
exchanging the contents.
Subsequent patchsets adapt the online filesystem repair code to use
atomic file exchanges. This enables repair functions to construct a
clean copy of a directory, xattr information, symbolic links, realtime
bitmaps, and realtime summary information in a temporary inode. If this
completes successfully, the new contents can be committed atomically
into the inode being repaired. This is essential to avoid making
corruption problems worse if the system goes down in the middle of
running repair.
For userspace, this series also includes the userspace pieces needed to
test the new functionality, and a sample implementation of atomic file
updates.
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
* tag 'atomic-file-updates-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux:
xfs: enable logged file mapping exchange feature
docs: update swapext -> exchmaps language
xfs: capture inode generation numbers in the ondisk exchmaps log item
xfs: support non-power-of-two rtextsize with exchange-range
xfs: make file range exchange support realtime files
xfs: condense symbolic links after a mapping exchange operation
xfs: condense directories after a mapping exchange operation
xfs: condense extended attributes after a mapping exchange operation
xfs: add error injection to test file mapping exchange recovery
xfs: bind together the front and back ends of the file range exchange code
xfs: create deferred log items for file mapping exchanges
xfs: introduce a file mapping exchange log intent item
xfs: create a incompat flag for atomic file mapping exchanges
xfs: introduce new file range exchange ioctl
vfs: export remap and write check helpers
This series applies various cleanups and refactorings to file IO
handling code ahead of the main series to implement atomic file content
exchanges.
This has been running on the djcloud for months with no problems. Enjoy!
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
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Merge tag 'file-exchange-refactorings-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux into xfs-6.10-mergeA
xfs: refactorings for atomic file content exchanges
This series applies various cleanups and refactorings to file IO
handling code ahead of the main series to implement atomic file content
exchanges.
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
* tag 'file-exchange-refactorings-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux:
xfs: constify xfs_bmap_is_written_extent
xfs: refactor non-power-of-two alignment checks
xfs: hoist multi-fsb allocation unit detection to a helper
xfs: create a new helper to return a file's allocation unit
xfs: declare xfs_file.c symbols in xfs_file.h
xfs: move xfs_iops.c declarations out of xfs_inode.h
xfs: move inode lease breaking functions to xfs_inode.c
This patchset improves the performance of log incompat feature bit
handling by making a few changes to how the filesystem handles them.
First, we now only clear the bits during a clean unmount to reduce calls
to the (expensive) upgrade function to once per bit per mount. Second,
we now only allow incompat feature upgrades for sysadmins or if the
sysadmin explicitly allows it via mount option. Currently the only log
incompat user is logged xattrs, which requires CONFIG_XFS_DEBUG=y, so
there should be no user visible impact to this change.
This has been running on the djcloud for months with no problems. Enjoy!
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
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Merge tag 'log-incompat-permissions-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux into xfs-6.10-mergeA
xfs: improve log incompat feature handling
This patchset improves the performance of log incompat feature bit
handling by making a few changes to how the filesystem handles them.
First, we now only clear the bits during a clean unmount to reduce calls
to the (expensive) upgrade function to once per bit per mount. Second,
we now only allow incompat feature upgrades for sysadmins or if the
sysadmin explicitly allows it via mount option. Currently the only log
incompat user is logged xattrs, which requires CONFIG_XFS_DEBUG=y, so
there should be no user visible impact to this change.
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Signed-off-by: Chandan Babu R <chandanbabu@kernel.org>
* tag 'log-incompat-permissions-6.10_2024-04-15' of https://git.kernel.org/pub/scm/linux/kernel/git/djwong/xfs-linux:
xfs: only clear log incompat flags at clean unmount
xfs: fix error bailout in xrep_abt_build_new_trees
xfs: fix potential AGI <-> ILOCK ABBA deadlock in xrep_dinode_findmode_walk_directory
xfs: fix an AGI lock acquisition ordering problem in xrep_dinode_findmode
xfs: pass xfs_buf lookup flags to xfs_*read_agi
After creation, drop the ILOCK on temporary files that have been created
to stage a repair.
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Reviewed-by: Christoph Hellwig <hch@lst.de>
Now that we've fixed the directory operations to hold the ILOCK until
they're finished with rmapbt updates for directory shape changes, we no
longer need to take this lock when scanning directories for rmapbt
records.
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Reviewed-by: Christoph Hellwig <hch@lst.de>
Modify xfs_rename to hold all inode locks across a rename operation
We will need this later when we add parent pointers
Signed-off-by: Allison Henderson <allison.henderson@oracle.com>
Reviewed-by: Darrick J. Wong <djwong@kernel.org>
Reviewed-by: Catherine Hoang <catherine.hoang@oracle.com>
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Reviewed-by: Christoph Hellwig <hch@lst.de>
Modify xfs_trans_alloc_dir to hold locks after return. Caller will be
responsible for manual unlock. We will need this later to hold locks
across parent pointer operations
Signed-off-by: Allison Henderson <allison.henderson@oracle.com>
Reviewed-by: Darrick J. Wong <djwong@kernel.org>
Reviewed-by: Catherine Hoang <catherine.hoang@oracle.com>
Signed-off-by: Darrick J. Wong <djwong@kernel.org>
Reviewed-by: Christoph Hellwig <hch@lst.de>