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When copying-up files from a lower fs to an upper, we also copy the extended
attributes on the file. If there is a (nested) overlay inside the lower, some
of these extended attributes configure the lower overlay, and should not be
copied-up to the upper.
In particular, whiteout attributes in the lower fs overlay should not be
copied-up, since the upper fs may actually contain the file.
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The current revalidation logic is very simple and does not do much
introspection of the dirent being revalidated (other than looking at the type
of file).
Fancier revalidation logic is coming soon, and we need to be able to look at
the cached and uncached attributes of a given dirent, and we need a context to
perform some of these operations.
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In the general case with an overlay, all mmap calls must go through the
overlay, because in the event of a copy-up, the overlay needs to invalidate any
previously-created mappings.
If there if no lower file, however, there will never be a copy-up, so the
overlay can delegate directly to the upper file in that case.
This also allows us to correctly mmap /dev/zero when it is in an overlay. This
file has special semantics which the overlay does not know about. In
particular, it does not implement Mappable(), which (in the general case) the
overlay uses to detect if a file is mappable or not.
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With musl libc when these entries are missing from the aux vector
it's forcing libc.secure (effectively AT_SECURE). This mode prevents
RPATH and LD_LIBRARY_PATH from working.
https://git.musl-libc.org/cgit/musl/tree/ldso/dynlink.c#n1488
As the first entry is a mask of all the aux fields set:
https://git.musl-libc.org/cgit/musl/tree/ldso/dynlink.c#n187
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Dirent.FullName takes the global renameMu, but can be called during Create,
which itself takes dirent.mu and dirent.dirMu, which is a lock-order violation:
Dirent.Create
d.dirMu.Lock
d.mu.Lock
Inode.Create
gofer.inodeOperations.Create
gofer.NewFile
Dirent.FullName
d.renameMu.RLock
We only use the FullName here for logging, and in this case we can get by with
logging only the BaseName.
A `BaseName` method was added to Dirent, which simply returns the name, taking
d.parent.mu as required.
In the Create pathway, we can't call d.BaseName() because taking d.parent.mu
after d.mu violates the lock order. But we already know the base name of the
file we just created, so that's OK.
In the Open/GetFile pathway, we are free to call d.BaseName() because the other
dirent locks are not held.
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Per the doc, usage must be kept maximally merged. Beyond that, it is simply a
good idea to keep fragmentation in usage to a minimum.
The glibc malloc allocator allocates one page at a time, potentially causing
lots of fragmentation. However, those pages are likely to have the same number
of references, often making it possible to merge ranges.
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If usageSet is heavily fragmented, findUnallocatedRange and findReclaimable
can spend excessive cycles linearly scanning the set for unallocated/free
pages.
Improve common cases by beginning the scan only at the first page that could
possibly contain an unallocated/free page. This metadata only guarantees that
there is no lower unallocated/free page, but a scan may still be required
(especially for multi-page allocations).
That said, this heuristic can still provide significant performance
improvements for certain applications.
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This method allows an eventfd inside the Sentry to be registered with with
the host kernel.
Update comment about memory mapping host fds via CachingInodeOperations.
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We're failing to set eventFile in the outer scope.
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Otherwise required and optional can be empty or have negative length.
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Multiple whitespace characters are allowed. This fixes Ubuntu's
/usr/sbin/invoke-rc.d, which has trailing whitespace after the
interpreter which we were treating as an arg.
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80bdf8a4068de3ac4a73b6b61a0cdcfe3e3571af accidentally moved vdso into an
inner scope, never assigning the vdso variable passed to the Kernel and
thus skipping VDSO mappings.
Fix this and remove the ability for loadVDSO to skip VDSO mappings,
since tests that do so are gone.
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The path in execve(2), interpreter script, and ELF interpreter may all
be no more than a NUL-byte. Handle each of those cases.
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Updated how restoring occurs through boot.go with a separate Restore function.
This prevents a new process and new mounts from being created.
Added tests to ensure the container is restored.
Registered checkpoint and restore commands so they can be used.
Docker support for these commands is still limited.
Working on #80.
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CheckIORange is analagous to Linux's access_ok() method, which is checked when
copying in IOVecs in both lib/iov_iter.c:import_single_range() and
lib/iov_iter.c:import_iovec() => fs/read_write.c:rw_copy_check_uvector().
gVisor copies in IOVecs via Task.SingleIOSequence() and Task.CopyInIovecs().
We were checking the address range bounds, but not whether the address is
valid. To conform with linux, we should also check that the address is valid.
For usual preadv/pwritev syscalls, the effect of this change is not noticeable,
since we find out that the address is invalid before the syscall completes.
For vectorized async-IO operations, however, this change is necessary because
Linux returns EFAULT when the operation is submitted, but before it executes.
Thus, we must validate the iovecs when copying them in.
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If the child stubs are killed by any unmaskable signal (e.g. SIGKILL), then
the parent process will similarly be killed, resulting in the death of all
other stubs.
The effect of this is that if the OOM killer selects and kills a stub, the
effect is the same as though the OOM killer selected and killed the sentry.
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The arguments are backwards from the message.
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IsChrooted still has the opportunity to race with another thread
entering the FSContext into a chroot, but that is unchanged (and
fine, AFAIK).
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The interfaces and their addresses are already available via
the stack Intefaces and InterfaceAddrs.
Also add some tests as we had no tests around SIOCGIFCONF. I also added the socket_netgofer lifecycle for IOCTL tests.
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