Note: Lab 4 is not required all students. Students who are interested in understanding the internals of file systems in depth can optionally complete this lab and receive extra credits (a max of 20% of the project grade).
In the previous two assignments, you made extensive use of a
file system without actually worrying about how it was implemented
underneath. For this last assignment, you will improve the
implementation of the file system. You will be working primarily in
the filesys
directory.
You may build project 4 on top of project 2 or project 3. In either
case, all of the functionality needed for project 2 must work in your
filesys submission. If you build on project 3, then all of the project
3 functionality must work also, and you will need to edit
filesys/Make.vars
to enable VM functionality. You can receive up
to 10% extra credit if you do enable VM.
We ask that you hand in your code for this lab in a branch called lab4-handin.
Depending on which project you plan to build on, create this branch with
git checkout -b lab4-handin lab2-handin or
git checkout -b lab4-handin lab3-handin.
Here are some files that are probably new to you. These are in the
filesys
directory except where indicated:
fsutil.c
filesys.h
filesys.c
directory.h
directory.c
inode.h
inode.c
file.h
file.c
lib/kernel/bitmap.h
lib/kernel/bitmap.c
Our file system has a Unix-like interface, so you may also wish to
read the Unix man pages for creat, open, close,
read, write, lseek, and unlink. Our file
system has calls that are similar, but not identical, to these. The
file system translates these calls into disk operations.
All the basic functionality is there in the code above, so that the file system is usable from the start, as you've seen in the previous two projects. However, it has severe limitations which you will remove.
While most of your work will be in filesys
, you should be
prepared for interactions with all previous parts.
By now, you should be familiar with the basic process of running the Pintos tests. See section 1.2.1 Testing, for review, if necessary.
Until now, each test invoked Pintos just once. However, an important purpose of a file system is to ensure that data remains accessible from one boot to another. Thus, the tests that are part of the file system project invoke Pintos a second time. The second run combines all the files and directories in the file system into a single file, then copies that file out of the Pintos file system into the host (Unix) file system.
The grading scripts check the file system's correctness based on the
contents of the file copied out in the second run. This means that your
project will not pass any of the extended file system tests until the
file system is implemented well enough to support tar, the
Pintos user program that produces the file that is copied out. The
tar program is fairly demanding (it requires both extensible
file and subdirectory support), so this will take some work. Until
then, you can ignore errors from make check regarding the
extracted file system.
Incidentally, as you may have surmised, the file format used for copying
out the file system contents is the standard Unix "tar" format. You
can use the Unix tar program to examine them. The tar file
for test t is named t.tar
.
To make your job easier, we suggest implementing the parts of this project in the following order:
You can implement extensible files and subdirectories in parallel if you temporarily make the number of entries in new directories fixed.
You should think about synchronization throughout.
Before you turn in your project, you must copy the
project 4 design document template into your source tree under the name
pintos/src/filesys/DESIGNDOC
and fill it in. We recommend that
you read the design document template before you start working on the
project. See section D. Project Documentation, for a sample design document
that goes along with a fictitious project.
The basic file system allocates files as a single extent, making it vulnerable to external fragmentation, that is, it is possible that an n-block file cannot be allocated even though n blocks are free. Eliminate this problem by modifying the on-disk inode structure. In practice, this probably means using an index structure with direct, indirect, and doubly indirect blocks. You are welcome to choose a different scheme as long as you explain the rationale for it in your design documentation, and as long as it does not suffer from external fragmentation (as does the extent-based file system we provide).
You can assume that the file system partition will not be larger than 8 MB. You must support files as large as the partition (minus metadata). Each inode is stored in one disk sector, limiting the number of block pointers that it can contain. Supporting 8 MB files will require you to implement doubly-indirect blocks.
An extent-based file can only grow if it is followed by empty space, but indexed inodes make file growth possible whenever free space is available. Implement file growth. In the basic file system, the file size is specified when the file is created. In most modern file systems, a file is initially created with size 0 and is then expanded every time a write is made off the end of the file. Your file system must allow this.
There should be no predetermined limit on the size of a file, except that a file cannot exceed the size of the file system (minus metadata). This also applies to the root directory file, which should now be allowed to expand beyond its initial limit of 16 files.
User programs are allowed to seek beyond the current end-of-file (EOF). The seek itself does not extend the file. Writing at a position past EOF extends the file to the position being written, and any gap between the previous EOF and the start of the write must be filled with zeros. A read starting from a position past EOF returns no bytes.
Writing far beyond EOF can cause many blocks to be entirely zero. Some file systems allocate and write real data blocks for these implicitly zeroed blocks. Other file systems do not allocate these blocks at all until they are explicitly written. The latter file systems are said to support "sparse files." You may adopt either allocation strategy in your file system.
Implement a hierarchical name space. In the basic file system, all files live in a single directory. Modify this to allow directory entries to point to files or to other directories.
Make sure that directories can expand beyond their original size just as any other file can.
The basic file system has a 14-character limit on file names. You may retain this limit for individual file name components, or may extend it, at your option. You must allow full path names to be much longer than 14 characters.
Maintain a separate current directory for each process. At
startup, set the root as the initial process's current directory.
When one process starts another with the exec system call, the
child process inherits its parent's current directory. After that, the
two processes' current directories are independent, so that either
changing its own current directory has no effect on the other.
(This is why, under Unix, the cd command is a shell built-in,
not an external program.)
Update the existing system calls so that, anywhere a file name is
provided by the caller, an absolute or relative path name may used.
The directory separator character is forward slash (/
).
You must also support special file names .
and ..
, which
have the same meanings as they do in Unix.
Update the open system call so that it can also open directories.
Of the existing system calls, only close needs to accept a file
descriptor for a directory.
Update the remove system call so that it can delete empty
directories (other than the root) in addition to regular files.
Directories may only be deleted if they do not contain any files or
subdirectories (other than .
and ..
). You may decide
whether to allow deletion of a directory that is open by a process or in
use as a process's current working directory. If it is allowed, then
attempts to open files (including .
and ..
) or create new
files in a deleted directory must be disallowed.
mkdir("/a/b/c") succeeds only if /a/balready exists and
/a/b/cdoes not.
READDIR_MAX_LEN + 1
bytes, and returns true. If no entries are left in the directory,
returns false.
.
and ..
should not be returned by readdir.
If the directory changes while it is open, then it is acceptable for some entries not to be read at all or to be read multiple times. Otherwise, each directory entry should be read once, in any order.
READDIR_MAX_LEN is defined in lib/user/syscall.h
. If your
file system supports longer file names than the basic file system, you
should increase this value from the default of 14.
An inode number persistently identifies a file or directory. It is unique during the file's existence. In Pintos, the sector number of the inode is suitable for use as an inode number.
We have provided ls and mkdir user programs, which
are straightforward once the above syscalls are implemented.
We have also provided pwd, which is not so straightforward.
The shell program implements cd internally.
The pintos extract
and append
commands should now
accept full path names, assuming that the directories used in the
paths have already been created. This should not require any significant
extra effort on your part.
Modify the file system to keep a cache of file blocks. When a request is made to read or write a block, check to see if it is in the cache, and if so, use the cached data without going to disk. Otherwise, fetch the block from disk into the cache, evicting an older entry if necessary. You are limited to a cache no greater than 64 sectors in size.
You must implement a cache replacement algorithm that is at least as good as the "clock" algorithm. We encourage you to account for the generally greater value of metadata compared to data. Experiment to see what combination of accessed, dirty, and other information results in the best performance, as measured by the number of disk accesses.
You can keep a cached copy of the free map permanently in memory if you like. It doesn't have to count against the cache size.
The provided inode code uses a "bounce buffer" allocated with
malloc() to translate the disk's sector-by-sector interface into
the system call interface's byte-by-byte interface. You should get rid
of these bounce buffers. Instead, copy data into and out of sectors in
the buffer cache directly.
Your cache should be write-behind, that is,
keep dirty blocks in the cache, instead of immediately writing modified
data to disk. Write dirty blocks to disk whenever they are evicted.
Because write-behind makes your file system more fragile in the face of
crashes, in addition you should periodically write all dirty, cached
blocks back to disk. The cache should also be written back to disk in
filesys_done(), so that halting Pintos flushes the cache.
If you have timer_sleep() from the first project working, write-behind is
an excellent application. Otherwise, you may implement a less general
facility, but make sure that it does not exhibit busy-waiting.
You should also implement read-ahead, that is, automatically fetch the next block of a file into the cache when one block of a file is read, in case that block is about to be read. Read-ahead is only really useful when done asynchronously. That means, if a process requests disk block 1 from the file, it should block until disk block 1 is read in, but once that read is complete, control should return to the process immediately. The read-ahead request for disk block 2 should be handled asynchronously, in the background.
The provided file system requires external synchronization, that is, callers must ensure that only one thread can be running in the file system code at once. Your submission must adopt a finer-grained synchronization strategy that does not require external synchronization. To the extent possible, operations on independent entities should be independent, so that they do not need to wait on each other.
Operations on different cache blocks must be independent. In particular, when I/O is required on a particular block, operations on other blocks that do not require I/O should proceed without having to wait for the I/O to complete.
Multiple processes must be able to access a single file at once.
Multiple reads of a single file must be able to complete without
waiting for one another. When writing to a file does not extend the
file, multiple processes should also be able to write a single file at
once. A read of a file by one process when the file is being written by
another process is allowed to show that none, all, or part of the write
has completed. (However, after the write system call returns to
its caller, all subsequent readers must see the change.) Similarly,
when two processes simultaneously write to the same part of a file,
their data may be interleaved.
On the other hand, extending a file and writing data into the new section must be atomic. Suppose processes A and B both have a given file open and both are positioned at end-of-file. If A reads and B writes the file at the same time, A may read all, part, or none of what B writes. However, A may not read data other than what B writes, e.g. if B's data is all nonzero bytes, A is not allowed to see any zeros.
Operations on different directories should take place concurrently. Operations on the same directory may wait for one another.
Keep in mind that only data shared by multiple threads needs to be
synchronized. In the base file system, struct file and struct dir
are accessed only by a single thread.
git push
to GitHub, especially in the last few minutes! We require that you submit your
code to a branch called lab4-handin. If you are developing in
a specific branch, in the end, don't forget to merge changes from that branch to the
lab4-handin branch. [Late Request]: $GitHub_Repo_Name$ (empty
content is fine) so we won't be collecting and grading your solution immediately.
When you finish (within the token limit), send another email to cs318-staff@cs.jhu.edu
with the subject [Late Finish]: $GitHub_Repo_Name$. Don't
forget to send the second late finish email to avoid leaking your late tokens.
Here's a summary of our reference solution, produced by the
diffstat program. The final row gives total lines inserted
and deleted; a changed line counts as both an insertion and a deletion.
This summary is relative to the Pintos base code, but the reference solution for project 4 is based on the reference solution to project 3. Thus, the reference solution runs with virtual memory enabled. See section 5.4 FAQ, for the summary of project 3.
The reference solution represents just one possible solution. Many other solutions are also possible and many of those differ greatly from the reference solution. Some excellent solutions may not modify all the files modified by the reference solution, and some may modify files not modified by the reference solution.
Makefile.build | 5 devices/timer.c | 42 ++ filesys/Make.vars | 6 filesys/cache.c | 473 +++++++++++++++++++++++++ filesys/cache.h | 23 + filesys/directory.c | 99 ++++- filesys/directory.h | 3 filesys/file.c | 4 filesys/filesys.c | 194 +++++++++- filesys/filesys.h | 5 filesys/free-map.c | 45 +- filesys/free-map.h | 4 filesys/fsutil.c | 8 filesys/inode.c | 444 ++++++++++++++++++----- filesys/inode.h | 11 threads/init.c | 5 threads/interrupt.c | 2 threads/thread.c | 32 + threads/thread.h | 38 +- userprog/exception.c | 12 userprog/pagedir.c | 10 userprog/process.c | 332 +++++++++++++---- userprog/syscall.c | 582 ++++++++++++++++++++++++++++++- userprog/syscall.h | 1 vm/frame.c | 161 ++++++++ vm/frame.h | 23 + vm/page.c | 297 +++++++++++++++ vm/page.h | 50 ++ vm/swap.c | 85 ++++ vm/swap.h | 11 30 files changed, 2721 insertions(+), 286 deletions(-) |
BLOCK_SECTOR_SIZE change?
No, BLOCK_SECTOR_SIZE is fixed at 512. For IDE disks, this
value is a fixed property of the hardware. Other disks do not
necessarily have a 512-byte sector, but for simplicity Pintos only
supports those that do.
The file system partition we create will be 8 MB or smaller. However, individual files will have to be smaller than the partition to accommodate the metadata. You'll need to consider this when deciding your inode organization.
a//bbe interpreted?
Multiple consecutive slashes are equivalent to a single slash, so this
file name is the same as a/b
.
/../x?
The root directory is its own parent, so it is equivalent to /x
.
/be treated?
Most Unix systems allow a slash at the end of the name for a directory, and reject other names that end in slashes. We will allow this behavior, as well as simply rejecting a name that ends in a slash.
struct inode_disk inside struct inode?
The goal of the 64-block limit is to bound the amount of cached file
system data. If you keep a block of disk data--whether file data or
metadata--anywhere in kernel memory then you have to count it against
the 64-block limit. The same rule applies to anything that's
"similar" to a block of disk data, such as a struct inode_disk
without the length or sector_cnt members.
That means you'll have to change the way the inode implementation
accesses its corresponding on-disk inode right now, since it currently
just embeds a struct inode_disk in struct inode and reads the
corresponding sector from disk when it's created. Keeping extra
copies of inodes would subvert the 64-block limitation that we place
on your cache.
You can store a pointer to inode data in struct inode, but if you do
so you should carefully make sure that this does not limit your OS to 64
simultaneously open files.
You can also store other information to help you find the inode when you
need it. Similarly, you may store some metadata along each of your 64
cache entries.
You can keep a cached copy of the free map permanently in memory if you like. It doesn't have to count against the cache size.
byte_to_sector() in filesys/inode.c
uses the
struct inode_disk directly, without first reading that sector from
wherever it was in the storage hierarchy. This will no longer work.
You will need to change inode_byte_to_sector() to obtain the
struct inode_disk from the cache before using it.