2007-08-27 20:49:44 +00:00
|
|
|
#ifndef __EXTENTMAP__
|
|
|
|
|
#define __EXTENTMAP__
|
|
|
|
|
|
|
|
|
|
#include <linux/rbtree.h>
|
2017-03-03 08:55:12 +00:00
|
|
|
#include <linux/refcount.h>
|
2007-08-27 20:49:44 +00:00
|
|
|
|
2013-10-31 05:01:13 +00:00
|
|
|
#define EXTENT_MAP_LAST_BYTE ((u64)-4)
|
|
|
|
|
#define EXTENT_MAP_HOLE ((u64)-3)
|
|
|
|
|
#define EXTENT_MAP_INLINE ((u64)-2)
|
|
|
|
|
#define EXTENT_MAP_DELALLOC ((u64)-1)
|
2007-08-27 20:49:44 +00:00
|
|
|
|
2008-07-18 16:01:11 +00:00
|
|
|
/* bits for the flags field */
|
|
|
|
|
#define EXTENT_FLAG_PINNED 0 /* this entry not yet on disk, don't free it */
|
Btrfs: Add zlib compression support
This is a large change for adding compression on reading and writing,
both for inline and regular extents. It does some fairly large
surgery to the writeback paths.
Compression is off by default and enabled by mount -o compress. Even
when the -o compress mount option is not used, it is possible to read
compressed extents off the disk.
If compression for a given set of pages fails to make them smaller, the
file is flagged to avoid future compression attempts later.
* While finding delalloc extents, the pages are locked before being sent down
to the delalloc handler. This allows the delalloc handler to do complex things
such as cleaning the pages, marking them writeback and starting IO on their
behalf.
* Inline extents are inserted at delalloc time now. This allows us to compress
the data before inserting the inline extent, and it allows us to insert
an inline extent that spans multiple pages.
* All of the in-memory extent representations (extent_map.c, ordered-data.c etc)
are changed to record both an in-memory size and an on disk size, as well
as a flag for compression.
From a disk format point of view, the extent pointers in the file are changed
to record the on disk size of a given extent and some encoding flags.
Space in the disk format is allocated for compression encoding, as well
as encryption and a generic 'other' field. Neither the encryption or the
'other' field are currently used.
In order to limit the amount of data read for a single random read in the
file, the size of a compressed extent is limited to 128k. This is a
software only limit, the disk format supports u64 sized compressed extents.
In order to limit the ram consumed while processing extents, the uncompressed
size of a compressed extent is limited to 256k. This is a software only limit
and will be subject to tuning later.
Checksumming is still done on compressed extents, and it is done on the
uncompressed version of the data. This way additional encodings can be
layered on without having to figure out which encoding to checksum.
Compression happens at delalloc time, which is basically singled threaded because
it is usually done by a single pdflush thread. This makes it tricky to
spread the compression load across all the cpus on the box. We'll have to
look at parallel pdflush walks of dirty inodes at a later time.
Decompression is hooked into readpages and it does spread across CPUs nicely.
Signed-off-by: Chris Mason <chris.mason@oracle.com>
2008-10-29 18:49:59 +00:00
|
|
|
#define EXTENT_FLAG_COMPRESSED 1
|
2008-10-30 18:19:41 +00:00
|
|
|
#define EXTENT_FLAG_VACANCY 2 /* no file extent item found */
|
2008-10-30 18:25:28 +00:00
|
|
|
#define EXTENT_FLAG_PREALLOC 3 /* pre-allocated extent */
|
2012-09-14 16:59:20 +00:00
|
|
|
#define EXTENT_FLAG_LOGGING 4 /* Logging this extent */
|
2012-12-03 15:58:15 +00:00
|
|
|
#define EXTENT_FLAG_FILLING 5 /* Filling in a preallocated extent */
|
2014-06-19 02:42:52 +00:00
|
|
|
#define EXTENT_FLAG_FS_MAPPING 6 /* filesystem extent mapping type */
|
2008-07-18 16:01:11 +00:00
|
|
|
|
2007-08-27 20:49:44 +00:00
|
|
|
struct extent_map {
|
|
|
|
|
struct rb_node rb_node;
|
2008-01-24 21:13:08 +00:00
|
|
|
|
|
|
|
|
/* all of these are in bytes */
|
|
|
|
|
u64 start;
|
|
|
|
|
u64 len;
|
2012-08-27 16:52:20 +00:00
|
|
|
u64 mod_start;
|
|
|
|
|
u64 mod_len;
|
2008-11-10 12:34:43 +00:00
|
|
|
u64 orig_start;
|
2012-12-03 15:31:19 +00:00
|
|
|
u64 orig_block_len;
|
2013-04-04 18:31:27 +00:00
|
|
|
u64 ram_bytes;
|
2007-08-27 20:49:44 +00:00
|
|
|
u64 block_start;
|
Btrfs: Add zlib compression support
This is a large change for adding compression on reading and writing,
both for inline and regular extents. It does some fairly large
surgery to the writeback paths.
Compression is off by default and enabled by mount -o compress. Even
when the -o compress mount option is not used, it is possible to read
compressed extents off the disk.
If compression for a given set of pages fails to make them smaller, the
file is flagged to avoid future compression attempts later.
* While finding delalloc extents, the pages are locked before being sent down
to the delalloc handler. This allows the delalloc handler to do complex things
such as cleaning the pages, marking them writeback and starting IO on their
behalf.
* Inline extents are inserted at delalloc time now. This allows us to compress
the data before inserting the inline extent, and it allows us to insert
an inline extent that spans multiple pages.
* All of the in-memory extent representations (extent_map.c, ordered-data.c etc)
are changed to record both an in-memory size and an on disk size, as well
as a flag for compression.
From a disk format point of view, the extent pointers in the file are changed
to record the on disk size of a given extent and some encoding flags.
Space in the disk format is allocated for compression encoding, as well
as encryption and a generic 'other' field. Neither the encryption or the
'other' field are currently used.
In order to limit the amount of data read for a single random read in the
file, the size of a compressed extent is limited to 128k. This is a
software only limit, the disk format supports u64 sized compressed extents.
In order to limit the ram consumed while processing extents, the uncompressed
size of a compressed extent is limited to 256k. This is a software only limit
and will be subject to tuning later.
Checksumming is still done on compressed extents, and it is done on the
uncompressed version of the data. This way additional encodings can be
layered on without having to figure out which encoding to checksum.
Compression happens at delalloc time, which is basically singled threaded because
it is usually done by a single pdflush thread. This makes it tricky to
spread the compression load across all the cpus on the box. We'll have to
look at parallel pdflush walks of dirty inodes at a later time.
Decompression is hooked into readpages and it does spread across CPUs nicely.
Signed-off-by: Chris Mason <chris.mason@oracle.com>
2008-10-29 18:49:59 +00:00
|
|
|
u64 block_len;
|
Btrfs: turbo charge fsync
At least for the vm workload. Currently on fsync we will
1) Truncate all items in the log tree for the given inode if they exist
and
2) Copy all items for a given inode into the log
The problem with this is that for things like VMs you can have lots of
extents from the fragmented writing behavior, and worst yet you may have
only modified a few extents, not the entire thing. This patch fixes this
problem by tracking which transid modified our extent, and then when we do
the tree logging we find all of the extents we've modified in our current
transaction, sort them and commit them. We also only truncate up to the
xattrs of the inode and copy that stuff in normally, and then just drop any
extents in the range we have that exist in the log already. Here are some
numbers of a 50 meg fio job that does random writes and fsync()s after every
write
Original Patched
SATA drive 82KB/s 140KB/s
Fusion drive 431KB/s 2532KB/s
So around 2-6 times faster depending on your hardware. There are a few
corner cases, for example if you truncate at all we have to do it the old
way since there is no way to be sure what is in the log is ok. This
probably could be done smarter, but if you write-fsync-truncate-write-fsync
you deserve what you get. All this work is in RAM of course so if your
inode gets evicted from cache and you read it in and fsync it we'll do it
the slow way if we are still in the same transaction that we last modified
the inode in.
The biggest cool part of this is that it requires no changes to the recovery
code, so if you fsync with this patch and crash and load an old kernel, it
will run the recovery and be a-ok. I have tested this pretty thoroughly
with an fsync tester and everything comes back fine, as well as xfstests.
Thanks,
Signed-off-by: Josef Bacik <jbacik@fusionio.com>
2012-08-17 17:14:17 +00:00
|
|
|
u64 generation;
|
2008-01-24 21:13:08 +00:00
|
|
|
unsigned long flags;
|
2015-06-03 14:55:48 +00:00
|
|
|
union {
|
|
|
|
|
struct block_device *bdev;
|
|
|
|
|
|
|
|
|
|
/*
|
|
|
|
|
* used for chunk mappings
|
|
|
|
|
* flags & EXTENT_FLAG_FS_MAPPING must be set
|
|
|
|
|
*/
|
|
|
|
|
struct map_lookup *map_lookup;
|
|
|
|
|
};
|
2017-03-03 08:55:12 +00:00
|
|
|
refcount_t refs;
|
2012-01-26 20:01:12 +00:00
|
|
|
unsigned int compress_type;
|
Btrfs: turbo charge fsync
At least for the vm workload. Currently on fsync we will
1) Truncate all items in the log tree for the given inode if they exist
and
2) Copy all items for a given inode into the log
The problem with this is that for things like VMs you can have lots of
extents from the fragmented writing behavior, and worst yet you may have
only modified a few extents, not the entire thing. This patch fixes this
problem by tracking which transid modified our extent, and then when we do
the tree logging we find all of the extents we've modified in our current
transaction, sort them and commit them. We also only truncate up to the
xattrs of the inode and copy that stuff in normally, and then just drop any
extents in the range we have that exist in the log already. Here are some
numbers of a 50 meg fio job that does random writes and fsync()s after every
write
Original Patched
SATA drive 82KB/s 140KB/s
Fusion drive 431KB/s 2532KB/s
So around 2-6 times faster depending on your hardware. There are a few
corner cases, for example if you truncate at all we have to do it the old
way since there is no way to be sure what is in the log is ok. This
probably could be done smarter, but if you write-fsync-truncate-write-fsync
you deserve what you get. All this work is in RAM of course so if your
inode gets evicted from cache and you read it in and fsync it we'll do it
the slow way if we are still in the same transaction that we last modified
the inode in.
The biggest cool part of this is that it requires no changes to the recovery
code, so if you fsync with this patch and crash and load an old kernel, it
will run the recovery and be a-ok. I have tested this pretty thoroughly
with an fsync tester and everything comes back fine, as well as xfstests.
Thanks,
Signed-off-by: Josef Bacik <jbacik@fusionio.com>
2012-08-17 17:14:17 +00:00
|
|
|
struct list_head list;
|
2007-08-27 20:49:44 +00:00
|
|
|
};
|
|
|
|
|
|
2008-01-24 21:13:08 +00:00
|
|
|
struct extent_map_tree {
|
|
|
|
|
struct rb_root map;
|
Btrfs: turbo charge fsync
At least for the vm workload. Currently on fsync we will
1) Truncate all items in the log tree for the given inode if they exist
and
2) Copy all items for a given inode into the log
The problem with this is that for things like VMs you can have lots of
extents from the fragmented writing behavior, and worst yet you may have
only modified a few extents, not the entire thing. This patch fixes this
problem by tracking which transid modified our extent, and then when we do
the tree logging we find all of the extents we've modified in our current
transaction, sort them and commit them. We also only truncate up to the
xattrs of the inode and copy that stuff in normally, and then just drop any
extents in the range we have that exist in the log already. Here are some
numbers of a 50 meg fio job that does random writes and fsync()s after every
write
Original Patched
SATA drive 82KB/s 140KB/s
Fusion drive 431KB/s 2532KB/s
So around 2-6 times faster depending on your hardware. There are a few
corner cases, for example if you truncate at all we have to do it the old
way since there is no way to be sure what is in the log is ok. This
probably could be done smarter, but if you write-fsync-truncate-write-fsync
you deserve what you get. All this work is in RAM of course so if your
inode gets evicted from cache and you read it in and fsync it we'll do it
the slow way if we are still in the same transaction that we last modified
the inode in.
The biggest cool part of this is that it requires no changes to the recovery
code, so if you fsync with this patch and crash and load an old kernel, it
will run the recovery and be a-ok. I have tested this pretty thoroughly
with an fsync tester and everything comes back fine, as well as xfstests.
Thanks,
Signed-off-by: Josef Bacik <jbacik@fusionio.com>
2012-08-17 17:14:17 +00:00
|
|
|
struct list_head modified_extents;
|
2009-09-02 20:24:52 +00:00
|
|
|
rwlock_t lock;
|
2007-08-27 20:49:44 +00:00
|
|
|
};
|
|
|
|
|
|
2014-02-25 14:15:12 +00:00
|
|
|
static inline int extent_map_in_tree(const struct extent_map *em)
|
|
|
|
|
{
|
|
|
|
|
return !RB_EMPTY_NODE(&em->rb_node);
|
|
|
|
|
}
|
|
|
|
|
|
2008-01-24 21:13:08 +00:00
|
|
|
static inline u64 extent_map_end(struct extent_map *em)
|
|
|
|
|
{
|
|
|
|
|
if (em->start + em->len < em->start)
|
|
|
|
|
return (u64)-1;
|
|
|
|
|
return em->start + em->len;
|
|
|
|
|
}
|
|
|
|
|
|
|
|
|
|
static inline u64 extent_map_block_end(struct extent_map *em)
|
|
|
|
|
{
|
Btrfs: Add zlib compression support
This is a large change for adding compression on reading and writing,
both for inline and regular extents. It does some fairly large
surgery to the writeback paths.
Compression is off by default and enabled by mount -o compress. Even
when the -o compress mount option is not used, it is possible to read
compressed extents off the disk.
If compression for a given set of pages fails to make them smaller, the
file is flagged to avoid future compression attempts later.
* While finding delalloc extents, the pages are locked before being sent down
to the delalloc handler. This allows the delalloc handler to do complex things
such as cleaning the pages, marking them writeback and starting IO on their
behalf.
* Inline extents are inserted at delalloc time now. This allows us to compress
the data before inserting the inline extent, and it allows us to insert
an inline extent that spans multiple pages.
* All of the in-memory extent representations (extent_map.c, ordered-data.c etc)
are changed to record both an in-memory size and an on disk size, as well
as a flag for compression.
From a disk format point of view, the extent pointers in the file are changed
to record the on disk size of a given extent and some encoding flags.
Space in the disk format is allocated for compression encoding, as well
as encryption and a generic 'other' field. Neither the encryption or the
'other' field are currently used.
In order to limit the amount of data read for a single random read in the
file, the size of a compressed extent is limited to 128k. This is a
software only limit, the disk format supports u64 sized compressed extents.
In order to limit the ram consumed while processing extents, the uncompressed
size of a compressed extent is limited to 256k. This is a software only limit
and will be subject to tuning later.
Checksumming is still done on compressed extents, and it is done on the
uncompressed version of the data. This way additional encodings can be
layered on without having to figure out which encoding to checksum.
Compression happens at delalloc time, which is basically singled threaded because
it is usually done by a single pdflush thread. This makes it tricky to
spread the compression load across all the cpus on the box. We'll have to
look at parallel pdflush walks of dirty inodes at a later time.
Decompression is hooked into readpages and it does spread across CPUs nicely.
Signed-off-by: Chris Mason <chris.mason@oracle.com>
2008-10-29 18:49:59 +00:00
|
|
|
if (em->block_start + em->block_len < em->block_start)
|
2008-01-24 21:13:08 +00:00
|
|
|
return (u64)-1;
|
Btrfs: Add zlib compression support
This is a large change for adding compression on reading and writing,
both for inline and regular extents. It does some fairly large
surgery to the writeback paths.
Compression is off by default and enabled by mount -o compress. Even
when the -o compress mount option is not used, it is possible to read
compressed extents off the disk.
If compression for a given set of pages fails to make them smaller, the
file is flagged to avoid future compression attempts later.
* While finding delalloc extents, the pages are locked before being sent down
to the delalloc handler. This allows the delalloc handler to do complex things
such as cleaning the pages, marking them writeback and starting IO on their
behalf.
* Inline extents are inserted at delalloc time now. This allows us to compress
the data before inserting the inline extent, and it allows us to insert
an inline extent that spans multiple pages.
* All of the in-memory extent representations (extent_map.c, ordered-data.c etc)
are changed to record both an in-memory size and an on disk size, as well
as a flag for compression.
From a disk format point of view, the extent pointers in the file are changed
to record the on disk size of a given extent and some encoding flags.
Space in the disk format is allocated for compression encoding, as well
as encryption and a generic 'other' field. Neither the encryption or the
'other' field are currently used.
In order to limit the amount of data read for a single random read in the
file, the size of a compressed extent is limited to 128k. This is a
software only limit, the disk format supports u64 sized compressed extents.
In order to limit the ram consumed while processing extents, the uncompressed
size of a compressed extent is limited to 256k. This is a software only limit
and will be subject to tuning later.
Checksumming is still done on compressed extents, and it is done on the
uncompressed version of the data. This way additional encodings can be
layered on without having to figure out which encoding to checksum.
Compression happens at delalloc time, which is basically singled threaded because
it is usually done by a single pdflush thread. This makes it tricky to
spread the compression load across all the cpus on the box. We'll have to
look at parallel pdflush walks of dirty inodes at a later time.
Decompression is hooked into readpages and it does spread across CPUs nicely.
Signed-off-by: Chris Mason <chris.mason@oracle.com>
2008-10-29 18:49:59 +00:00
|
|
|
return em->block_start + em->block_len;
|
2008-01-24 21:13:08 +00:00
|
|
|
}
|
2007-08-27 20:49:44 +00:00
|
|
|
|
2011-04-20 22:34:43 +00:00
|
|
|
void extent_map_tree_init(struct extent_map_tree *tree);
|
2007-08-27 20:49:44 +00:00
|
|
|
struct extent_map *lookup_extent_mapping(struct extent_map_tree *tree,
|
2008-01-24 21:13:08 +00:00
|
|
|
u64 start, u64 len);
|
2007-08-27 20:49:44 +00:00
|
|
|
int add_extent_mapping(struct extent_map_tree *tree,
|
2013-04-05 20:51:15 +00:00
|
|
|
struct extent_map *em, int modified);
|
2007-08-27 20:49:44 +00:00
|
|
|
int remove_extent_mapping(struct extent_map_tree *tree, struct extent_map *em);
|
2014-02-25 14:15:13 +00:00
|
|
|
void replace_extent_mapping(struct extent_map_tree *tree,
|
|
|
|
|
struct extent_map *cur,
|
|
|
|
|
struct extent_map *new,
|
|
|
|
|
int modified);
|
2008-01-24 21:13:08 +00:00
|
|
|
|
2011-04-20 22:48:27 +00:00
|
|
|
struct extent_map *alloc_extent_map(void);
|
2007-08-27 20:49:44 +00:00
|
|
|
void free_extent_map(struct extent_map *em);
|
2007-11-19 15:22:33 +00:00
|
|
|
int __init extent_map_init(void);
|
2007-12-11 14:25:06 +00:00
|
|
|
void extent_map_exit(void);
|
Btrfs: turbo charge fsync
At least for the vm workload. Currently on fsync we will
1) Truncate all items in the log tree for the given inode if they exist
and
2) Copy all items for a given inode into the log
The problem with this is that for things like VMs you can have lots of
extents from the fragmented writing behavior, and worst yet you may have
only modified a few extents, not the entire thing. This patch fixes this
problem by tracking which transid modified our extent, and then when we do
the tree logging we find all of the extents we've modified in our current
transaction, sort them and commit them. We also only truncate up to the
xattrs of the inode and copy that stuff in normally, and then just drop any
extents in the range we have that exist in the log already. Here are some
numbers of a 50 meg fio job that does random writes and fsync()s after every
write
Original Patched
SATA drive 82KB/s 140KB/s
Fusion drive 431KB/s 2532KB/s
So around 2-6 times faster depending on your hardware. There are a few
corner cases, for example if you truncate at all we have to do it the old
way since there is no way to be sure what is in the log is ok. This
probably could be done smarter, but if you write-fsync-truncate-write-fsync
you deserve what you get. All this work is in RAM of course so if your
inode gets evicted from cache and you read it in and fsync it we'll do it
the slow way if we are still in the same transaction that we last modified
the inode in.
The biggest cool part of this is that it requires no changes to the recovery
code, so if you fsync with this patch and crash and load an old kernel, it
will run the recovery and be a-ok. I have tested this pretty thoroughly
with an fsync tester and everything comes back fine, as well as xfstests.
Thanks,
Signed-off-by: Josef Bacik <jbacik@fusionio.com>
2012-08-17 17:14:17 +00:00
|
|
|
int unpin_extent_cache(struct extent_map_tree *tree, u64 start, u64 len, u64 gen);
|
2013-01-24 17:02:07 +00:00
|
|
|
void clear_em_logging(struct extent_map_tree *tree, struct extent_map *em);
|
2009-09-18 20:07:03 +00:00
|
|
|
struct extent_map *search_extent_mapping(struct extent_map_tree *tree,
|
|
|
|
|
u64 start, u64 len);
|
2007-08-27 20:49:44 +00:00
|
|
|
#endif
|
