- 12 11月, 2009 1 次提交
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由 Josef Bacik 提交于
This patch fixes a problem where max_size can be set to 0 even though we filled the cluster properly. We set max_size to 0 if we restart the cluster window, but if the new start entry is big enough to be our new cluster then we could return with a max_size set to 0, which will mean the next time we try to allocate from this cluster it will fail. So set max_extent to the entry's size. Tested this on my box and now we actually allocate from the cluster after we fill it. Thanks, Signed-off-by: NJosef Bacik <josef@redhat.com> Signed-off-by: NChris Mason <chris.mason@oracle.com>
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- 22 9月, 2009 2 次提交
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由 Josef Bacik 提交于
There is a slight problem with the extent entry threshold calculation for the free space cache. We only adjust the threshold down as we add bitmaps, but never actually adjust the threshold up as we add bitmaps. This means we could fragment the free space so badly that we end up using all bitmaps to describe the free space, use all the free space which would result in the bitmaps being freed, but then go to add free space again as we delete things and immediately add bitmaps since the extent threshold would still be 0. Now as we free bitmaps the extent threshold will be ratcheted up to allow more extent entries to be added. Signed-off-by: NJosef Bacik <jbacik@redhat.com> Signed-off-by: NChris Mason <chris.mason@oracle.com>
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由 Josef Bacik 提交于
When we first go to add free space, we allocate a new info and set the offset and bytes to the space we are adding. This is fine, except we actually set the size of a bitmap as we set the bits in it, so if we add space to a bitmap, we'd end up counting the same space twice. This isn't a huge deal, it just makes the allocator behave weirdly since it will think that a bitmap entry has more space than it ends up actually having. I used a BUG_ON() to catch when this problem happened, and with this patch I no longer get the BUG_ON(). Signed-off-by: NJosef Bacik <jbacik@redhat.com> Signed-off-by: NChris Mason <chris.mason@oracle.com>
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- 31 7月, 2009 1 次提交
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由 Josef Bacik 提交于
Yan Zheng hit a problem where we tried to remove some free space but failed because we couldn't find the free space entry. This is because the free space was held within a bitmap that had a starting offset well before the actual offset of the free space, and there were free space extents that were in the same range as that offset, so tree_search_offset returned with NULL because we couldn't find a free space extent that had that offset. This is fixed by making sure that if we fail to find the entry, we re-search again with bitmap_only set to 1 and do an offset_to_bitmap so we can get the appropriate bitmap. A similar problem happens in btrfs_alloc_from_bitmap for the clustering code, but that is not as bad since we will just go and redo our cluster allocation. Also this adds some debugging checks to make sure that the free space we are trying to remove from the bitmap is in fact there. This can probably go away after a while, but since this code is only used by the tree-logging stuff it would be nice to run with it for a while to make sure there are no problems. Signed-off-by: NJosef Bacik <jbacik@redhat.com> Signed-off-by: NChris Mason <chris.mason@oracle.com>
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- 24 7月, 2009 2 次提交
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由 Josef Bacik 提交于
This patch moves the caching of the block group off to a kthread in order to allow people to allocate sooner. Instead of blocking up behind the caching mutex, we instead kick of the caching kthread, and then attempt to make an allocation. If we cannot, we wait on the block groups caching waitqueue, which the caching kthread will wake the waiting threads up everytime it finds 2 meg worth of space, and then again when its finished caching. This is how I tested the speedup from this mkfs the disk mount the disk fill the disk up with fs_mark unmount the disk mount the disk time touch /mnt/foo Without my changes this took 11 seconds on my box, with these changes it now takes 1 second. Another change thats been put in place is we lock the super mirror's in the pinned extent map in order to keep us from adding that stuff as free space when caching the block group. This doesn't really change anything else as far as the pinned extent map is concerned, since for actual pinned extents we use EXTENT_DIRTY, but it does mean that when we unmount we have to go in and unlock those extents to keep from leaking memory. I've also added a check where when we are reading block groups from disk, if the amount of space used == the size of the block group, we go ahead and mark the block group as cached. This drastically reduces the amount of time it takes to cache the block groups. Using the same test as above, except doing a dd to a file and then unmounting, it used to take 33 seconds to umount, now it takes 3 seconds. This version uses the commit_root in the caching kthread, and then keeps track of how many async caching threads are running at any given time so if one of the async threads is still running as we cross transactions we can wait until its finished before handling the pinned extents. Thank you, Signed-off-by: NJosef Bacik <jbacik@redhat.com> Signed-off-by: NChris Mason <chris.mason@oracle.com>
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由 Josef Bacik 提交于
Currently btrfs has a problem where it can use a ridiculous amount of RAM simply tracking free space. As free space gets fragmented, we end up with thousands of entries on an rb-tree per block group, which usually spans 1 gig of area. Since we currently don't ever flush free space cache back to disk this gets to be a bit unweildly on large fs's with lots of fragmentation. This patch solves this problem by using PAGE_SIZE bitmaps for parts of the free space cache. Initially we calculate a threshold of extent entries we can handle, which is however many extent entries we can cram into 16k of ram. The maximum amount of RAM that should ever be used to track 1 gigabyte of diskspace will be 32k of RAM, which scales much better than we did before. Once we pass the extent threshold, we start adding bitmaps and using those instead for tracking the free space. This patch also makes it so that any free space thats less than 4 * sectorsize we go ahead and put into a bitmap. This is nice since we try and allocate out of the front of a block group, so if the front of a block group is heavily fragmented and then has a huge chunk of free space at the end, we go ahead and add the fragmented areas to bitmaps and use a normal extent entry to track the big chunk at the back of the block group. I've also taken the opportunity to revamp how we search for free space. Previously we indexed free space via an offset indexed rb tree and a bytes indexed rb tree. I've dropped the bytes indexed rb tree and use only the offset indexed rb tree. This cuts the number of tree operations we were doing previously down by half, and gives us a little bit of a better allocation pattern since we will always start from a specific offset and search forward from there, instead of searching for the size we need and try and get it as close as possible to the offset we want. I've given this a healthy amount of testing pre-new format stuff, as well as post-new format stuff. I've booted up my fedora box which is installed on btrfs with this patch and ran with it for a few days without issues. I've not seen any performance regressions in any of my tests. Since the last patch Yan Zheng fixed a problem where we could have overlapping entries, so updating their offset inline would cause problems. Thanks, Signed-off-by: NJosef Bacik <jbacik@redhat.com> Signed-off-by: NChris Mason <chris.mason@oracle.com>
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- 10 6月, 2009 3 次提交
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由 Chris Mason 提交于
Some SSDs perform best when reusing block numbers often, while others perform much better when clustering strictly allocates big chunks of unused space. The default mount -o ssd will find rough groupings of blocks where there are a bunch of free blocks that might have some allocated blocks mixed in. mount -o ssd_spread will make sure there are no allocated blocks mixed in. It should perform better on lower end SSDs. Signed-off-by: NChris Mason <chris.mason@oracle.com>
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由 Chris Mason 提交于
In SSD mode for data, and all the time for metadata the allocator will try to find a cluster of nearby blocks for allocations. This commit adds extra checks to make sure that each free block in the cluster is close to the last one. Signed-off-by: NChris Mason <chris.mason@oracle.com>
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由 Chris Mason 提交于
The block allocator in SSD mode will try to find groups of free blocks that are close together. This commit makes it loop less on a given group size before bumping it. The end result is that we are less likely to fill small holes in the available free space, but we don't waste as much CPU building the large cluster used by ssd mode. Signed-off-by: NChris Mason <chris.mason@oracle.com>
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- 27 4月, 2009 1 次提交
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由 Joel Becker 提交于
Just happened to notice a bunch of %llu vs u64 warnings. Here's a patch to cast them all. Signed-off-by: NJoel Becker <joel.becker@oracle.com> Signed-off-by: NChris Mason <chris.mason@oracle.com>
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- 03 4月, 2009 4 次提交
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由 Stoyan Gaydarov 提交于
Signed-off-by: NChris Mason <chris.mason@oracle.com>
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由 Chris Mason 提交于
Because btrfs is copy-on-write, we end up picking new locations for blocks very often. This makes it fairly difficult to maintain perfect read patterns over time, but we can at least do some optimizations for writes. This is done today by remembering the last place we allocated and trying to find a free space hole big enough to hold more than just one allocation. The end result is that we tend to write sequentially to the drive. This happens all the time for metadata and it happens for data when mounted -o ssd. But, the way we record it is fairly racey and it tends to fragment the free space over time because we are trying to allocate fairly large areas at once. This commit gets rid of the races by adding a free space cluster object with dedicated locking to make sure that only one process at a time is out replacing the cluster. The free space fragmentation is somewhat solved by allowing a cluster to be comprised of smaller free space extents. This part definitely adds some CPU time to the cluster allocations, but it allows the allocator to consume the small holes left behind by cow. Signed-off-by: NChris Mason <chris.mason@oracle.com>
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由 Josef Bacik 提交于
This patch removes the block group alloc mutex used to protect the free space tree for allocations and replaces it with a spin lock which is used only to protect the free space rb tree. This means we only take the lock when we are directly manipulating the tree, which makes us a touch faster with multi-threaded workloads. This patch also gets rid of btrfs_find_free_space and replaces it with btrfs_find_space_for_alloc, which takes the number of bytes you want to allocate, and empty_size, which is used to indicate how much free space should be at the end of the allocation. It will return an offset for the allocator to use. If we don't end up using it we _must_ call btrfs_add_free_space to put it back. This is the tradeoff to kill the alloc_mutex, since we need to make sure nobody else comes along and takes our space. Signed-off-by: NJosef Bacik <jbacik@redhat.com>
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由 Josef Bacik 提交于
This patch cleans up the free space cache code a bit. It better documents the idiosyncrasies of tree_search_offset and makes the code make a bit more sense. I took out the info allocation at the start of __btrfs_add_free_space and put it where it makes more sense. This was left over cruft from when alloc_mutex existed. Also all of the re-searches we do to make sure we inserted properly. Signed-off-by: NJosef Bacik <jbacik@redhat.com>
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- 06 1月, 2009 1 次提交
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由 Chris Mason 提交于
There were many, most are fixed now. struct-funcs.c generates some warnings but these are bogus. Signed-off-by: NChris Mason <chris.mason@oracle.com>
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- 09 12月, 2008 1 次提交
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由 Yan Zheng 提交于
This patch implements superblock duplication. Superblocks are stored at offset 16K, 64M and 256G on every devices. Spaces used by superblocks are preserved by the allocator, which uses a reverse mapping function to find the logical addresses that correspond to superblocks. Thank you, Signed-off-by: NYan Zheng <zheng.yan@oracle.com>
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- 02 12月, 2008 1 次提交
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由 Christoph Hellwig 提交于
Shut up various sparse warnings about symbols that should be either static or have their declarations in scope. Signed-off-by: NChristoph Hellwig <hch@lst.de>
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- 30 10月, 2008 1 次提交
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由 Josef Bacik 提交于
This patch removes the giant fs_info->alloc_mutex and replaces it with a bunch of little locks. There is now a pinned_mutex, which is used when messing with the pinned_extents extent io tree, and the extent_ins_mutex which is used with the pending_del and extent_ins extent io trees. The locking for the extent tree stuff was inspired by a patch that Yan Zheng wrote to fix a race condition, I cleaned it up some and changed the locking around a little bit, but the idea remains the same. Basically instead of holding the extent_ins_mutex throughout the processing of an extent on the extent_ins or pending_del trees, we just hold it while we're searching and when we clear the bits on those trees, and lock the extent for the duration of the operations on the extent. Also to keep from getting hung up waiting to lock an extent, I've added a try_lock_extent so if we cannot lock the extent, move on to the next one in the tree and we'll come back to that one. I have tested this heavily and it does not appear to break anything. This has to be applied on top of my find_free_extent redo patch. I tested this patch on top of Yan's space reblancing code and it worked fine. The only thing that has changed since the last version is I pulled out all my debugging stuff, apparently I forgot to run guilt refresh before I sent the last patch out. Thank you, Signed-off-by: NJosef Bacik <jbacik@redhat.com>
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- 10 10月, 2008 1 次提交
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由 Josef Bacik 提交于
Sometimes we end up freeing a reserved extent because we don't need it, however this means that its possible for transaction->last_alloc to point to the middle of a free area. When we search for free space in find_free_space we do a tree_search_offset with contains set to 0, because we want it to find the next best free area if we do not have an offset starting on the given offset. Unfortunately that currently means that if the offset we were given as a hint points to the middle of a free area, we won't find anything. This is especially bad if we happened to last allocate from the big huge chunk of a newly formed block group, since we won't find anything and have to go back and search the long way around. This fixes this problem by making it so that we return the free space area regardless of the contains variable. This made cache missing happen _alot_ less, and speeds things up considerably. Signed-off-by: NJosef Bacik <jbacik@redhat.com>
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- 26 9月, 2008 1 次提交
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由 Chris Mason 提交于
After a crash, the tree log code uses btrfs_alloc_logged_extent to record allocations of data extents that it finds in the log tree. These come in basically random order, which does not fit how btrfs_remove_free_space() expects to be called. btrfs_remove_free_space was changed to support recording an extent allocation in the middle of a region of free space. Signed-off-by: NChris Mason <chris.mason@oracle.com>
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- 25 9月, 2008 1 次提交
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由 Josef Bacik 提交于
1) replace the per fs_info extent_io_tree that tracked free space with two rb-trees per block group to track free space areas via offset and size. The reason to do this is because most allocations come with a hint byte where to start, so we can usually find a chunk of free space at that hint byte to satisfy the allocation and get good space packing. If we cannot find free space at or after the given offset we fall back on looking for a chunk of the given size as close to that given offset as possible. When we fall back on the size search we also try to find a slot as close to the size we want as possible, to avoid breaking small chunks off of huge areas if possible. 2) remove the extent_io_tree that tracked the block group cache from fs_info and replaced it with an rb-tree thats tracks block group cache via offset. also added a per space_info list that tracks the block group cache for the particular space so we can lookup related block groups easily. 3) cleaned up the allocation code to make it a little easier to read and a little less complicated. Basically there are 3 steps, first look from our provided hint. If we couldn't find from that given hint, start back at our original search start and look for space from there. If that fails try to allocate space if we can and start looking again. If not we're screwed and need to start over again. 4) small fixes. there were some issues in volumes.c where we wouldn't allocate the rest of the disk. fixed cow_file_range to actually pass the alloc_hint, which has helped a good bit in making the fs_mark test I run have semi-normal results as we run out of space. Generally with data allocations we don't track where we last allocated from, so everytime we did a data allocation we'd search through every block group that we have looking for free space. Now searching a block group with no free space isn't terribly time consuming, it was causing a slight degradation as we got more data block groups. The alloc_hint has fixed this slight degredation and made things semi-normal. There is still one nagging problem I'm working on where we will get ENOSPC when there is definitely plenty of space. This only happens with metadata allocations, and only when we are almost full. So you generally hit the 85% mark first, but sometimes you'll hit the BUG before you hit the 85% wall. I'm still tracking it down, but until then this seems to be pretty stable and make a significant performance gain. Signed-off-by: NChris Mason <chris.mason@oracle.com>
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