- 25 Jul, 2022 40 commits
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Qu Wenruo authored
[BUG] If we have a btrfs image with dirty log, along with an unsupported RO compatible flag: log_root 30474240 ... compat_flags 0x0 compat_ro_flags 0x40000003 ( FREE_SPACE_TREE | FREE_SPACE_TREE_VALID | unknown flag: 0x40000000 ) Then even if we can only mount it RO, we will still cause metadata update for log replay: BTRFS info (device dm-1): flagging fs with big metadata feature BTRFS info (device dm-1): using free space tree BTRFS info (device dm-1): has skinny extents BTRFS info (device dm-1): start tree-log replay This is definitely against RO compact flag requirement. [CAUSE] RO compact flag only forces us to do RO mount, but we will still do log replay for plain RO mount. Thus this will result us to do log replay and update metadata. This can be very problematic for new RO compat flag, for example older kernel can not understand v2 cache, and if we allow metadata update on RO mount and invalidate/corrupt v2 cache. [FIX] Just reject the mount unless rescue=nologreplay is provided: BTRFS error (device dm-1): cannot replay dirty log with unsupport optional features (0x40000000), try rescue=nologreplay instead We don't want to set rescue=nologreply directly, as this would make the end user to read the old data, and cause confusion. Since the such case is really rare, we're mostly fine to just reject the mount with an error message, which also includes the proper workaround. CC: stable@vger.kernel.org #4.9+ Signed-off-by:
Qu Wenruo <wqu@suse.com> Reviewed-by:
David Sterba <dsterba@suse.com> Signed-off-by:
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Qu Wenruo authored
When using "btrfs inspect-internal dump-super" to inspect an fs with dirty log, it always shows the log_root_transid as 0: log_root 30474240 log_root_transid 0 <<< log_root_level 0 It turns out that, btrfs_super_block::log_root_transid is never really utilized (even no read for it). This can date back to the introduction of btrfs into upstream kernel. In fact, when reading log tree root, we always use btrfs_super_block::generation + 1 as the expected generation. So here we're completely safe to mark this member deprecated. In theory we can easily reuse this member for other purposes, but to be extra safe, here we follow the leafsize way, by adding "__unused_" for log_root_transid. And we can safely remove the accessors, since there is no such callers from the very beginning. Reviewed-by:
Filipe Manana <fdmanana@suse.com> Signed-off-by:
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Christoph Hellwig authored
submit_one_bio always works on the bio and compression flags from a btrfs_bio_ctrl structure. Pass the explicitly and clean up the calling conventions by handling a NULL bio in submit_one_bio, and using the btrfs_bio_ctrl to pass the mirror number as well. Reviewed-by:
Christoph Hellwig <hch@lst.de> Reviewed-by:
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Christoph Hellwig authored
Merge end_write_bio and flush_write_bio into a single submit_write_bio helper, that either submits the bio or ends it if a negative errno was passed in. This consolidates a lot of duplicated checks in the callers. Reviewed-by:
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Christoph Hellwig authored
submit_one_bio is only used for page cache I/O, so the inode can be trivially derived from the first page in the bio. Reviewed-by:
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David Sterba authored
There are two separate checks in the bounds checker, the first one being a special case of the second. As this function is performance critical due to checking access to any eb member, reducing the size can slightly improve performance. On a release build on x86_64 the helper is completely inlined so the function call overhead is also gone. There was a report of 5% performance drop on metadata heavy workload, that disappeared after disabling asserts. The most significant part of that is the bounds checker. https://lore.kernel.org/linux-btrfs/20200724164147.39925-1-josef@toxicpanda.com/ After the analysis, the optimized code removes the worst overhead which is the function call and the performance was restored. https://lore.kernel.org/linux-btrfs/20200730110943.GE3703@twin.jikos.cz/ 1. baseline, asserts on, setget check on run time: 46s run time with perf: 48s 2. asserts on, comment out setget check run time: 44s run time with perf: 47s So this is confirms the 5% difference 3. asserts on, optimized seget check run time: 44s run time with perf: 47s The optimizations are reducing the number of ifs to 1 and inlining the hot path. Low-level stuff, gets the performance back. Patch below. 4. asserts off, no setget check run time: 44s run time with perf: 45s This verifies that asserts other than the setget check have negligible impact on performance and it's not harmful to keep them on. Analysis where the performance is lost: * check_setget_bounds is short function, but it's still a function call, changing the flow of instructions and given how many times it's called the overhead adds up * there are two conditions, one to check if the range is completely outside (member_offset > eb->len) or partially inside (member_offset + size > eb->len) Reviewed-by:
Johannes Thumshirn <johannes.thumshirn@wdc.com> Signed-off-by:
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Fabio M. De Francesco authored
The use of kmap() is being deprecated in favor of kmap_local_page() where it is feasible. With kmap_local_page(), the mapping is per thread, CPU local and not globally visible. Therefore, use kmap_local_page() / kunmap_local() in lzo.c wherever the mappings are per thread and not globally visible. Tested on QEMU + KVM 32 bits VM with 4GB of RAM and HIGHMEM64G enabled. Suggested-by:
Ira Weiny <ira.weiny@intel.com> Reviewed-by:
Fabio M. De Francesco <fmdefrancesco@gmail.com> Reviewed-by:
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Fabio M. De Francesco authored
The use of kmap() is being deprecated in favor of kmap_local_page() where it is feasible. With kmap_local_page(), the mapping is per thread, CPU local and not globally visible. Therefore, use kmap_local_page() / kunmap_local() in inode.c wherever the mappings are per thread and not globally visible. Tested on QEMU + KVM 32 bits VM with 4GB of RAM and HIGHMEM64G enabled. Suggested-by:
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Christoph Hellwig authored
The bios submitted from btrfs_map_bio don't really interact with the rest of btrfs and the only btrfs_bio member actually used in the low-level bios is the pointer to the btrfs_io_context used for endio handler. Use a union in struct btrfs_io_stripe that allows the endio handler to find the btrfs_io_context and remove the spurious ->device assignment so that a plain fs_bio_set bio can be used for the low-level bios allocated inside btrfs_map_bio. Reviewed-by:
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Christoph Hellwig authored
Move all per-stripe handling into submit_stripe_bio and use a label to cleanup instead of duplicating the logic. Reviewed-by:
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Christoph Hellwig authored
All reads bio that go through btrfs_map_bio need to be completed in user context. And read I/Os are the most common and timing critical in almost any file system workloads. Embed a work_struct into struct btrfs_bio and use it to complete all read bios submitted through btrfs_map, using the REQ_META flag to decide which workqueue they are placed on. This removes the need for a separate 128 byte allocation (typically rounded up to 192 bytes by slab) for all reads with a size increase of 24 bytes for struct btrfs_bio. Future patches will reorganize struct btrfs_bio to make use of this extra space for writes as well. (All sizes are based a on typical 64-bit non-debug build) Reviewed-by:
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Christoph Hellwig authored
Set REQ_META in btrfs_submit_metadata_bio instead of the various callers. We'll start relying on this flag inside of btrfs in a bit, and this ensures it is always set correctly. Reviewed-by:
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Christoph Hellwig authored
Compressed write bio completion is the only user of btrfs_bio_wq_end_io for writes, and the use of btrfs_bio_wq_end_io is a little suboptimal here as we only real need user context for the final completion of a compressed_bio structure, and not every single bio completion. Add a work_struct to struct compressed_bio instead and use that to call finish_compressed_bio_write. This allows to remove all handling of write bios in the btrfs_bio_wq_end_io infrastructure. Signed-off-by:
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Christoph Hellwig authored
The bio completion handler of the bio used for the compressed data is already run in a workqueue using btrfs_bio_wq_end_io, so don't schedule the completion of the original bio to the same workqueue again but just execute it directly. Signed-off-by:
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Christoph Hellwig authored
Instead of attaching an extra allocation an indirect call to each low-level bio issued by the RAID code, add a work_struct to struct btrfs_raid_bio and only defer the per-rbio completion action. The per-bio action for all the I/Os are trivial and can be safely done from interrupt context. As a nice side effect this also allows sharing the boilerplate code for the per-bio completions Signed-off-by:
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Christoph Hellwig authored
Split btrfs_submit_data_bio into one helper for reads and one for writes. Signed-off-by:
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Christoph Hellwig authored
There is no exit block and cleanup and the function is reasonably short so we can use inline return and not the goto. This makes the function more straight forward. Reviewed-by:
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Christoph Hellwig authored
Assign ->mirror_num and ->bi_status in btrfs_end_bioc instead of duplicating the logic in the callers. Also remove the bio argument as it always must be bioc->orig_bio and the now pointless bioc_error that did nothing but assign bi_sector to the same value just sampled in the caller. Reviewed-by:
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Omar Sandoval authored
Now that the new support is implemented, allow the ioctl to accept v2 and the compressed flag, and update the version in sysfs. Signed-off-by:
Omar Sandoval <osandov@fb.com> Signed-off-by:
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Omar Sandoval authored
Now that all of the pieces are in place, we can use the ENCODED_WRITE command to send compressed extents when appropriate. Signed-off-by:
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Omar Sandoval authored
For encoded writes in send v2, we will get the encoded data with btrfs_encoded_read_regular_fill_pages(), which expects a list of raw pages. To avoid extra buffers and copies, we should read directly into the send buffer. Therefore, we need the raw pages for the send buffer. We currently allocate the send buffer with kvmalloc(), which may return a kmalloc'd buffer or a vmalloc'd buffer. For vmalloc, we can get the pages with vmalloc_to_page(). For kmalloc, we could use virt_to_page(). However, the buffer size we use (144K) is not a power of two, which in theory is not guaranteed to return a page-aligned buffer, and in practice would waste a lot of memory due to rounding up to the next power of two. 144K is large enough that it usually gets allocated with vmalloc(), anyways. So, for send v2, replace kvmalloc() with vmalloc() and save the pages in an array. Signed-off-by:
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Omar Sandoval authored
The length field of the send stream TLV header is 16 bits. This means that the maximum amount of data that can be sent for one write is 64K minus one. However, encoded writes must be able to send the maximum compressed extent (128K) in one command, or more. To support this, send stream version 2 encodes the DATA attribute differently: it has no length field, and the length is implicitly up to the end of containing command (which has a 32bit length field). Although this is necessary for encoded writes, normal writes can benefit from it, too. Also add a check to enforce that the DATA attribute is last. It is only strictly necessary for v2, but we might as well make v1 consistent with it. For v2, let's bump up the send buffer to the maximum compressed extent size plus 16K for the other metadata (144K total). Since this will most likely be vmalloc'd (and always will be after the next commit), we round it up to the next page since we might as well use the rest of the page on systems with >16K pages. Reviewed-by:
Nikolay Borisov <nborisov@suse.com> Signed-off-by:
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Omar Sandoval authored
This adds the definitions of the new commands for send stream version 2 and their respective attributes: fallocate, FS_IOC_SETFLAGS (a.k.a. chattr), and encoded writes. It also documents two changes to the send stream format in v2: the receiver shouldn't assume a maximum command size, and the DATA attribute is encoded differently to allow for writes larger than 64k. These will be implemented in subsequent changes, and then the ioctl will accept the new version and flag. Reviewed-by:
Josef Bacik <josef@toxicpanda.com> Signed-off-by:
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Omar Sandoval authored
Commit e77fbf99 ("btrfs: send: prepare for v2 protocol") added _BTRFS_SEND_C_MAX_V* macros equal to the maximum command number for the version plus 1, but as written this creates gaps in the number space. The maximum command number is currently 22, and __BTRFS_SEND_C_MAX_V1 is accordingly 23. But then __BTRFS_SEND_C_MAX_V2 is 24, suggesting that v2 has a command numbered 23, and __BTRFS_SEND_C_MAX is 25, suggesting that 23 and 24 are valid commands. Instead, let's explicitly number all of the commands, attributes, and sentinel MAX constants. Signed-off-by:
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Omar Sandoval authored
We collect these statistics but have never exposed them in any way. I also didn't find any patches that ever attempted to make use of them. Signed-off-by:
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Stefan Roesch authored
Adds write-only trigger to force new chunk allocation for a given block group type. It is at /sys/fs/btrfs/<uuid>/allocation/<type>/force_chunk_alloc Note: this is now only for debugging and testing and is enabled with the CONFIG_BTRFS_DEBUG configuration option. The transaction is started from sysfs context and can be problematic in some cases. Signed-off-by:Stefan Roesch <shr@fb.com> Reviewed-by:
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Stefan Roesch authored
Add new sysfs knob /sys/fs/btrfs/<uuid>/allocation/<type>/chunk_size. This allows to query the chunk size and also set the chunk size. Constraints: - can be changed by root only - system chunk size can't be set - maximum chunk size is 10% of the filesystem size - final value is rounded down to a multiple of 256M - cannot be set on zoned filesystem Note, that rounding and the 10% clamp will result to a different value on filesystems smaller than 10G, typically 768M. Signed-off-by:
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Stefan Roesch authored
The chunk size is stored in the btrfs_space_info structure. It is initialized at the start and is then used. A new API is added to update the current chunk size. This API is used to be able to expose the chunk_size as a sysfs setting. Signed-off-by:
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Josef Bacik authored
While running generic/475 in a loop I got the following error BTRFS critical (device dm-11): corrupt leaf: root=5 block=31096832 slot=69, bad key order, prev (263 96 531) current (263 96 524) <snip> item 65 key (263 96 517) itemoff 14132 itemsize 33 item 66 key (263 96 523) itemoff 14099 itemsize 33 item 67 key (263 96 525) itemoff 14066 itemsize 33 item 68 key (263 96 531) itemoff 14033 itemsize 33 item 69 key (263 96 524) itemoff 14000 itemsize 33 As you can see here we have 3 dir index keys with the dir index value of 523, 524, and 525 inserted between 517 and 524. This occurs because our dir index insertion code will bulk insert all dir index items on the node regardless of their actual key value. This makes sense on a normally running system, because if there's a gap in between the items there was a deletion before the item was inserted, so there's not going to be an overlap of the dir index items that need to be inserted and what exists on disk. However during log replay this isn't necessarily true, we could have any number of dir indexes in the tree already. Fix this by seeing if we're replaying the log, and if we are simply skip batching if there's a gap in the key space. This file system was left broken from the fstest, I tested this patch against the broken fs to make sure it replayed the log properly, and then btrfs checked the file system after the log replay to verify everything was ok. Reviewed-by:
Sweet Tea Dorminy <sweettea-kernel@dorminy.me> Signed-off-by:
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Filipe Manana authored
Whenever we want to create a new dir index item (when creating an inode, create a hard link, rename a file) we reserve 1 unit of metadata space for it in a transaction (that's 256K for a node/leaf size of 16K), and then create a delayed insertion item for it to be added later to the subvolume's tree. That unit of metadata is kept until the delayed item is inserted into the subvolume tree, which may take a while to happen (in the worst case, it's done only when the transaction commits). If we have multiple dir index items to insert for the same directory, say N index items, and they all fit in a single leaf of metadata, then we are holding N units of reserved metadata space when all we need is 1 unit. This change addresses that, whenever a new delayed dir index item is added, we release the unit of metadata the caller has reserved when it started the transaction if adding that new dir index item does not result in touching one more metadata leaf, otherwise the reservation is kept by transferring it from the transaction block reserve to the delayed items block reserve, just like before. Given that with a leaf size of 16K we can have a few hundred dir index items in a single leaf (the exact value depends on file name lengths), this reduces pressure on metadata reservation by releasing unnecessary space much sooner. The following fs_mark test showed some improvement when creating many files in parallel on machine running a non debug kernel (debian's default kernel config) with 12 cores: $ cat test.sh #!/bin/bash DEV=/dev/nvme0n1 MNT=/mnt/nvme0n1 MOUNT_OPTIONS="-o ssd" FILES=100000 THREADS=$(nproc --all) echo "performance" | \ tee /sys/devices/system/cpu/cpu*/cpufreq/scaling_governor mkfs.btrfs -f $DEV mount $MOUNT_OPTIONS $DEV $MNT OPTS="-S 0 -L 10 -n $FILES -s 0 -t $THREADS -k" for ((i = 1; i <= $THREADS; i++)); do OPTS="$OPTS -d $MNT/d$i" done fs_mark $OPTS umount $MNT Before: FSUse% Count Size Files/sec App Overhead 2 1200000 0 225991.3 5465891 4 2400000 0 345728.1 5512106 4 3600000 0 346959.5 5557653 8 4800000 0 329643.0 5587548 8 6000000 0 312657.4 5606717 8 7200000 0 281707.5 5727985 12 8400000 0 88309.8 5020422 12 9600000 0 85835.9 5207496 16 10800000 0 81039.2 5404964 16 12000000 0 58548.6 5842468 After: FSUse% Count Size Files/sec App Overhead 2 1200000 0 230604.5 5778375 4 2400000 0 348908.3 5508072 4 3600000 0 357028.7 5484337 6 4800000 0 342898.3 5565703 6 6000000 0 314670.8 5751555 8 7200000 0 282548.2 5778177 12 8400000 0 90844.9 5306819 12 9600000 0 86963.1 5304689 16 10800000 0 89113.2 5455248 16 12000000 0 86693.5 5518933 The "after" results are after applying this patch and all the other patches in the same patchset, which is comprised of the following changes: btrfs: balance btree dirty pages and delayed items after a rename btrfs: free the path earlier when creating a new inode btrfs: balance btree dirty pages and delayed items after clone and dedupe btrfs: add assertions when deleting batches of delayed items btrfs: deal with deletion errors when deleting delayed items btrfs: refactor the delayed item deletion entry point btrfs: improve batch deletion of delayed dir index items btrfs: assert that delayed item is a dir index item when adding it btrfs: improve batch insertion of delayed dir index items btrfs: do not BUG_ON() on failure to reserve metadata for delayed item btrfs: set delayed item type when initializing it btrfs: reduce amount of reserved metadata for delayed item insertion Signed-off-by: -
Filipe Manana authored
Currently we set the type of a delayed item only after successfully inserting it into its respective rbtree. This is fine, as the type is not used anywhere before that point, but for the next patch in the series, there will be the need to check the type of a delayed item before inserting it into a rbtree. So set the type of a delayed item immediately after allocating it. This also makes the trivial wrappers for adding insertion and deletion useless, so it removes them as well. Reviewed-by:
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Filipe Manana authored
At btrfs_insert_delayed_dir_index(), we don't expect the metadata reservation for the delayed dir index item insertion to fail, because the caller is supposed to have reserved 1 unit of metadata space for that. All callers are able to deal with an error in case that happens, so there is no need for something so drastic as a BUG_ON() in case of failure. Instead just emit a warning, so that's easily noticed during development (fstests in particular), and return the error to the caller. Reviewed-by:
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Filipe Manana authored
Currently we group delayed dir index items for insertion as a single batch (a single btree operation) as long as their keys are sequential in the key space. For example we have delayed index items for the following index keys: 10, 11, 12, 15, 16, 20, 21 We end up building three batches: 1) First one for index keys 10, 11 and 12; 2) Second one for index keys 15 and 16; 3) Third one for index keys 20 and 21. However, since the dir index numbers come from a monotonically increasing counter and are never reused, we could group all these items into a single batch. The existence of holes in the sequence happens only when we had delayed dir index items for insertion that got deleted before they were flushed to the subvolume's tree. The delayed items are stored in a rbtree based on their key order, so we can just group items into a batch as long as they all fit in a leaf, and ignore if there's a gap (key offset, index number) between two consecutive items. This is more efficient and reduces the amount of time spent when running delayed items if there are gaps between dir index items. For example running the following test script: $ cat test.sh #!/bin/bash DEV=/dev/sdj MNT=/mnt/sdj mkfs.btrfs -f $DEV mount $DEV $MNT NUM_FILES=100 mkdir $MNT/testdir for ((i = 1; i <= $NUM_FILES; i++)); do echo -n > $MNT/testdir/file_$i done # Now delete every other file, to create gaps in the dir index keys. for ((i = 1; i <= $NUM_FILES; i += 2)); do rm -f $MNT/testdir/file_$i done start=$(date +%s%N) sync end=$(date +%s%N) dur=$(( (end - start) / 1000000 )) echo -e "\nsync took $dur milliseconds" umount $MNT While having the following bpftrace script running in another shell: $ cat bpf-delayed-items-inserts.sh #!/usr/bin/bpftrace /* Must add 'noinline' to btrfs_insert_delayed_items(). */ k:btrfs_insert_delayed_items { @start_insert_delayed_items[tid] = nsecs; } k:btrfs_insert_empty_items /@start_insert_delayed_items[tid]/ { @insert_batches = count(); } kr:btrfs_insert_delayed_items /@start_insert_delayed_items[tid]/ { $dur = (nsecs - @start_insert_delayed_items[tid]) / 1000; @btrfs_insert_delayed_items_total_time = sum($dur); delete(@start_insert_delayed_items[tid]); } Before this change: @btrfs_insert_delayed_items_total_time: 576 @insert_batches: 51 After this change: @btrfs_insert_delayed_items_total_time: 174 @insert_batches: 2 Reviewed-by: -
Filipe Manana authored
All delayed items are for dir index items, we don't support any other item types at the moment. So simplify __btrfs_add_delayed_item() and add an assertion for checking the item's key type. This also allows the next change to be simpler and avoid to check key types. In case we add support for different item types in the future, then we'll hit the assertion during development and be able to adjust any code that is assuming delayed items are always associated to dir index items. Reviewed-by:
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Filipe Manana authored
Currently we group delayed dir index items for deletion in a single batch (single btree operation) as long as they all exist in the same leaf and as long as their keys are sequential in the key space. For example if we have a leaf that has dir index items with offsets: 2, 3, 4, 6, 7, 10 And we have delayed dir index items for deleting all these indexes, and no delayed items for any other index keys in between, then we end up deleting in 3 batches: 1) First batch for indexes 2, 3 and 4; 2) Second batch for indexes 6 and 7; 3) Third batch for index 10. This is a waste because we can delete all the index keys in a single batch. What matters is that each consecutive delayed index key matches each consecutive dir index key in a leaf. So update the logic at btrfs_batch_delete_items() to check only for a key match between delayed dir index items and dir index items in a leaf. Also avoid the useless first iteration on comparing the key of the first slot to delete with the key of the first delayed item, as it's silly since they always match, as the delayed item's key was used for the btree search that gave us the path we have. This is more efficient and reduces runtime of running delayed items, as well as lock contention on the subvolume's tree. For example, the following test script: $ cat test.sh #!/bin/bash DEV=/dev/sdj MNT=/mnt/sdj mkfs.btrfs -f $DEV mount $DEV $MNT NUM_FILES=1000 mkdir $MNT/testdir for ((i = 1; i <= $NUM_FILES; i++)); do echo -n > $MNT/testdir/file_$i done # Now delete every other file, to create gaps in the dir index keys. for ((i = 1; i <= $NUM_FILES; i += 2)); do rm -f $MNT/testdir/file_$i done # Sync to force any delayed items to be flushed to the tree. sync start=$(date +%s%N) rm -fr $MNT/testdir end=$(date +%s%N) dur=$(( (end - start) / 1000000 )) echo -e "\nrm -fr took $dur milliseconds" umount $MNT Running that test script while having the following bpftrace script running in another shell: $ cat bpf-measure.sh #!/usr/bin/bpftrace /* Add 'noinline' to btrfs_delete_delayed_items()'s definition. */ k:btrfs_delete_delayed_items { @start_delete_delayed_items[tid] = nsecs; } k:btrfs_del_items /@start_delete_delayed_items[tid]/ { @delete_batches = count(); } kr:btrfs_delete_delayed_items /@start_delete_delayed_items[tid]/ { $dur = (nsecs - @start_delete_delayed_items[tid]) / 1000; @btrfs_delete_delayed_items_total_time = sum($dur); delete(@start_delete_delayed_items[tid]); } Before this change: @btrfs_delete_delayed_items_total_time: 9563 @delete_batches: 1001 After this change: @btrfs_delete_delayed_items_total_time: 7328 @delete_batches: 509 Reviewed-by: -
Filipe Manana authored
The delayed item deletion entry point, btrfs_delete_delayed_items(), is a bit convoluted for a few reasons: 1) It's really a loop disguised with labels and goto statements; 2) There's a 'delete_fail' label which isn't only for error cases, we can jump to that label even if no error happened, if we simply don't have more delayed items to delete; 3) Unnecessarily keeps track of the current and previous items for no good reason, as after getting the next item and releasing the current one, it just jumps to the 'again' label just to look again for the first delayed item; 4) When a delayed item is not in the tree (because it was already deleted before), it releases the item while holding a path locked, which is not necessary and adds more contention to the tree, specially taking into account that the path came from a deletion search, meaning we have write locks for nodes at levels 2, 1 and 0. And releasing the item is not computationally trivial (rb tree deletion, a kfree() and some trivial things). So refactor it to use a while loop and add some comments to make it more obvious why we can have delayed items without a matching item in the tree as well as why not keep the delayed node locked all the time when running all its deletion items. This is also a preparation for some upcoming work involving delayed items. Reviewed-by:
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Filipe Manana authored
Currently, btrfs_delete_delayed_items() ignores any errors returned from btrfs_batch_delete_items(). This looks fishy but it's not a problem at the moment because: 1) Two of the errors returned from btrfs_batch_delete_items() are for impossible cases, cases where a delayed item does not match any item in the leaf the path points to - btrfs_delete_delayed_items() always calls btrfs_batch_delete_items() with a path that points to a leaf that contains an item matching a delayed item; 2) btrfs_batch_delete_items() may return an error from btrfs_del_items(), in which case it does not release the delayed items of the batch. At the moment this is harmless because btrfs_del_items() actually is always able to delete items, even if it returns an error - when it returns an error it's because it ended up with a leaf mostly empty (less than 1/3 full) and failed to migrate items from that leaf into its neighbour leaves - this is not critical, as all the items were deleted, we just left the tree a bit unbalanced, but it's still a valid tree and causes no harm, and future operations on the tree will eventually balance it. So even if we get an error from btrfs_del_items(), the delayed items will not be released but the next time we run delayed items we will find out, at btrfs_delete_delayed_items(), that they are not present in the tree anymore and then release them. This is all a bit subtle, and it's certainly prone to be a disaster in case btrfs_del_items() changes one day and may return errors before being able to delete all the requested items, in which case we could leave the filesystem in an inconsistent state as we would commit a transaction despite a failure from deleting items from the tree. So make btrfs_delete_delayed_items() check for any errors from the call to btrfs_batch_delete_items(). Reviewed-by:
Anand Jain <anand.jain@oracle.com> Reviewed-by:
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Filipe Manana authored
There are a few impossible cases that btrfs_batch_delete_items() tries to deal with: 1) Getting a path pointing to a NULL leaf; 2) The leaf slot is pointing beyond the last item in the leaf; 3) We can't find a single item to delete. The first case is impossible because the given path was returned by a successful call to btrfs_search_slot(). Replace the BUG_ON() with an ASSERT for this. The second case is impossible because we are always called when a delayed item matches an item in the given leaf. So add an ASSERT() for that and if that condition is not satisfied, trigger a warning and return an error. The third case is impossible exactly because of the same reason as the second case. The given delayed item matches one item in the leaf, so we know that our batch always has at least one item. Add an ASSERT to check that, trigger a warning if that expectation fails and return an error. Reviewed-by:
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Filipe Manana authored
When reflinking extents (clone and deduplication), we need to touch the btree of the destination inode's subvolume, as well as potentially create a delayed inode for the destination inode (if it was not created before). However we are neither balancing the btree dirty pages nor the delayed items after such operations, so if we have a task that is doing a long series of clone or deduplication operations, it can result in accumulation of too many btree dirty pages and delayed items. So just call btrfs_btree_balance_dirty() after clone and deduplication, just like we do for every other system call that results on modifying a btree and adding delayed items. Reviewed-by:
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Filipe Manana authored
When creating an inode, through btrfs_create_new_inode(), we release the path we allocated before once we don't need it anymore. But we keep it allocated until we return from that function, which is wasteful because after we release the path we do several things that can allocate yet another path: inheriting properties, setting the xattrs used by ACLs and secutiry modules, adding an orphan item (O_TMPFILE case) or adding a dir item (for the non-O_TMPFILE case). So instead of releasing the path once we don't need it anymore, free it instead. This way we avoid having two paths allocated until we return from btrfs_create_new_inode(). Reviewed-by:
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