| CVE |
Vendors |
Products |
Updated |
CVSS v3.1 |
| In the Linux kernel, the following vulnerability has been resolved:
netfs: Fix readahead synchronisation issues by loading all folios upfront
There are some synchronisation issues that derive from the app thread
adding more folios to the rolling buffer whilst the collector thread is
looking at them or trying to clear them, such as determining the setting of
front_folio_order when the next folio hasn't been added yet,
The reason for the rolling buffer approach is that loading the buffer
upfront and then dropping all the refs just acquired is quite a slow
operation, and loading progressively allows some of the cost to be deferred
until after at least some of the I/O is started.
Instead, a better way is to load all the folios into the rolling buffer
upfront - and then drop the refs later, once the I/O is in progress. (Even
better would be for the refs not to be there at all.)
Fix this by changing the rolling buffer loader to load all the folios
selected by the VM for readahead upfront into the folio queue. The folio
queue is allocated a batch worth at a time as we don't know how many folios
are involved (the readahead_control struct, alas, has a page count, not a
folio count).
The folio refs acquired from readahead are then dropped in bulk once the
first subrequest is dispatched as it's quite a slow operation. The
collector waits for NETFS_RREQ_NEED_PUT_RA_REFS to be cleared so that it
doesn't unlock folios before the xarray has been scanned for them.
This simplifies the buffer handling later and isn't noticeably slower as
the xarray doesn't need to be modified and the folios are all already
pre-locked. |
| In the Linux kernel, the following vulnerability has been resolved:
sctp: fix soft lockup from unpadded ASCONF-ACK parameter iteration
sctp_verify_asconf() walks ASCONF-ACK parameters with
sctp_walk_params(), which advances by SCTP_PAD4(length), while the
consumer sctp_get_asconf_response() iterates the same parameters
advancing by the raw length, without padding. A single odd-length
parameter desynchronises the two walks and makes the consumer
interpret attacker-controlled bytes at a misaligned offset.
When those bytes yield a length of zero, the while loop over
asconf_ack_len makes no progress, spinning forever in softirq
context, and the watchdog reports a soft lockup. All reads stay
within the received skb, so the lockup is a pure remote denial of
service. A remote peer can trigger it with a crafted ASCONF-ACK on
an ADD-IP enabled association with an outstanding ASCONF (RFC 5061
section 4.1.2 requires the chunk to be authenticated, but the
predefined empty key id 0 allows the peer to compute the same
association HMAC from publicly exchanged parameters, so the gate
does not help).
The SCTP_PARAM_ERR_CAUSE case of sctp_verify_asconf() also performs
no length check, letting a parameter without a complete error
header reach the consumer, which reads errhdr.cause past the end of
the parameter, an out-of-bounds read.
Reject SCTP_PARAM_ERR_CAUSE parameters shorter than
sizeof(struct sctp_addip_param) + sizeof(struct sctp_errhdr) at the
verifier, and advance the consumer iterator with the same padding
rule as the verifier to keep the two walks in lockstep. The verifier
change guarantees a complete error header in every ERR_CAUSE
parameter the consumer can see, so the consumer's asconf_ack_len
check is dropped and it returns err_param->cause directly. The
consumer padding fix is still required because odd lengths remain
valid for SCTP_PARAM_ERR_CAUSE per RFC 5061.
The issue was found by ZeroHive, a vulnerability hunting agent at
Tencent Yunding Lab. |
| In the Linux kernel, the following vulnerability has been resolved:
smb/client: invalidate fscache for fallocate range operations
smb3_zero_range(), smb3_punch_hole(), smb3_insert_range(), and
smb3_collapse_range() modify file contents through server-side range
operations. These operations discard the affected page cache, but leave
the FS-Cache cookie valid, so a later read may return data cached before
the range operation.
Fix this by invalidating FS-Cache after outstanding I/O has completed
and before modifying the file on the server.
Run the following as root on a CIFS mount with fsc enabled and an active
CacheFiles backend:
bash -c '
MNT=/mnt/cifs
FILE="$MNT/repro"
# Generate four 1 MiB random blocks: [A][B][C][D].
dd if=/dev/urandom of=/tmp/src bs=1M count=4 status=none
# Expected contents after zeroing B: [A][zero][C][D].
cp /tmp/src /tmp/expected
dd if=/dev/zero of=/tmp/expected bs=1M seek=1 count=1 \
conv=notrunc status=none
cp /tmp/src "$FILE"
# Populate FS-Cache, then discard the page cache.
sync
echo 1 > /proc/sys/vm/drop_caches
cat "$FILE" > /dev/null
sync
echo 1 > /proc/sys/vm/drop_caches
fallocate --zero-range -o 1M -l 1M "$FILE"
if cmp -s /tmp/expected "$FILE"; then
echo "readback: OK"
else
echo "readback: STALE DATA"
fi
'
Before this change, the readback differs from /tmp/expected:
readback: STALE DATA
After this change, it matches:
readback: OK |
| In the Linux kernel, the following vulnerability has been resolved:
smb/client: fix stale page cache in insert/collapse range
smb3_insert_range() and smb3_collapse_range() use
truncate_pagecache_range() to invalidate the affected page cache.
However, if off or old_eof is not page-aligned, the boundary pages are
only partially zeroed and remain uptodate. As a result, the client may
return stale data after a successful insert/collapse range operation.
For example, with 4K pages:
page 0 page 1 page 2
0------4K 4K------8K 8K------12K
^ ^
off=2K old_eof=10K
Page 1 is removed from the page cache, while the boundary pages are
only partially zeroed. After COPYCHUNK moves the data on the server,
these cached pages may still return stale data.
This can be reproduced on a CIFS mount:
bash -c '
FILE=/mnt/scratch/repro
# Use a 6 KiB file so EOF is not page-aligned.
dd if=/dev/urandom of=/tmp/src bs=1K count=6 status=none
# Expected: a 4 KiB hole followed by the original data.
rm -f /tmp/expected
truncate -s 4K /tmp/expected
cat /tmp/src >> /tmp/expected
cp /tmp/src "$FILE"
# Prime the page cache before moving data on the server.
cat "$FILE" > /dev/null
fallocate --insert-range -o 0 -l 4K "$FILE"
if cmp -s /tmp/expected "$FILE"; then
echo "readback: OK"
else
echo "readback: STALE DATA"
fi
'
Fix this by writing back dirty data and discarding the page cache from
the start of the page containing off to EOF before moving data on the
server. |
| In the Linux kernel, the following vulnerability has been resolved:
smb/client: validate new EOF for zero range
When FALLOC_FL_ZERO_RANGE is used without FALLOC_FL_KEEP_SIZE,
smb3_zero_range() may extend EOF without checking RLIMIT_FSIZE, allowing
the file to grow beyond the caller's file-size limit.
Fix this by calling inode_newsize_ok() before sending the zero-range
request when the operation would extend EOF.
Reproducer, using a file on a CIFS mount:
bash -c '
FILE=/mnt/cifs/repro
trap "" SIGXFSZ
ulimit -f 3072
truncate -s 2M "$FILE"
fallocate --zero-range -o 0 -l 4M "$FILE"
echo "fallocate rc=$?"
stat -c "file size=%s" "$FILE"
'
Before this change, the operation succeeds despite the 3 MiB limit:
fallocate rc=0
file size=4194304
After this change, fallocate fails and leaves the file at 2 MiB. |
| In the Linux kernel, the following vulnerability has been resolved:
smb/client: validate new EOF for insert range
smb3_insert_range() does not check if the new file size
(i_size + len) is valid. This allows FALLOC_FL_INSERT_RANGE to bypass
RLIMIT_FSIZE, exceed s_maxbytes, or produce a size outside the loff_t
range.
Use check_add_overflow() to calculate the new EOF. Validate it with
inode_newsize_ok() before modifying the file.
Reproducer, using a file on a CIFS mount:
bash -c '
FILE=/mnt/cifs/repro
trap "" SIGXFSZ
ulimit -f 3072 # RLIMIT_FSIZE = 3 MiB
# A regular write is stopped at 3 MiB.
dd if=/dev/zero of="$FILE" bs=1M count=4 status=none
stat -c "size after write: %s" "$FILE"
# Insert 2 MiB into a 2 MiB file.
truncate -s 2M "$FILE"
fallocate -i -o 0 -l 2M "$FILE"
stat -c "size after insert: %s" "$FILE"
'
Before this change, the regular write stops at the 3 MiB limit, but
insert range grows the file to 4 MiB:
dd: error writing '/mnt/cifs/repro': File too large
size after write: 3145728
size after insert: 4194304
After this change, insert range also fails at the limit and leaves the
2 MiB file unchanged:
dd: error writing '/mnt/cifs/repro': File too large
size after write: 3145728
fallocate: fallocate failed: File too large
size after insert: 2097152 |
| In the Linux kernel, the following vulnerability has been resolved:
ntfs: leave HasEA flag untouched on setxattr failure
In ntfs_set_ea(), the exit path unconditionally updates the HasEA
flag based on ea_info_qsize. When an error occurs before
ea_info_qsize is updated, NInoClearHasEA() hides existing on-disk
EAs until the inode is evicted.
Only update the flag on success. |
| virtualenv is a tool for creating isolated virtual python environments. Prior to 21.7.11, PyEnvCfg.write() writes prompt values verbatim to the line-oriented pyvenv.cfg format while PyEnvCfg._read_values() parses the file with str.splitlines() and accepts the last value for duplicate keys. An attacker who influences --prompt, VIRTUALENV_PROMPT, or configuration input can insert a recognized line boundary and additional keys, including home, causing consumers to use an attacker-selected base interpreter or corrupted environment metadata. The security impact requires prompt input from outside the operator's trust boundary; directly supplied prompt content primarily corrupts the operator's own environment. This issue is fixed in version 21.7.11. |
| virtualenv is a tool for creating isolated virtual python environments. Prior to 21.7.12, BatchActivator.quote() returns prompt text unchanged before activate.bat inserts it into a cmd.exe set "VAR=value" statement. An attacker who influences --prompt, VIRTUALENV_PROMPT, or the corresponding configuration value can include a double quote that closes the assignment and leaves following cmd.exe operators as executable syntax. When a user activates the generated Windows environment, the injected commands run with that user's privileges. This issue is fixed in version 21.7.12. |
| Unverified ownership in Barman snapshot backup deletion allows a principal who can write the backup catalog to cause Barman to delete unrelated cloud snapshots. When a snapshot backup is deleted, either explicitly or by retention policy enforcement, Barman reads the snapshot identifiers from the backup.info file and passes them to the cloud provider's delete API using Barman's own credentials, without verifying that the snapshots belong to that backup. An attacker who can overwrite backup.info but lacks snapshot delete permissions can substitute the identifiers of other snapshots, causing Barman to delete any snapshot its cloud identity can reach on AWS, Microsoft Azure, or Google Cloud. Exploitation requires a deployment where the principal that writes the backup catalog is separate from the identity Barman uses to delete snapshots. Barman versions from 3.4.0 (Google Cloud), 3.6.0 (Azure), and 3.7.0 (AWS) up to and including 3.20.0 are affected. The issue is fixed in Barman 3.20.1. |
| MongoDB SQL Schema Builder CLI records its startup configuration to standard output and, when file logging is enabled, to a log file on disk. Certain connection settings were written without redaction, so authentication material supplied by the operator could appear in plaintext in that diagnostic output. A local user with read access to the terminal session or the log directory, or anyone with access to a location where those logs are subsequently collected, could obtain those values. |
| virtualenv is a tool for creating isolated virtual python environments. Prior to 21.7.12, download_wheel() accepts pip and setuptools seed wheels fetched for periodic updates or the --download option without checking their bytes against an authoritative digest equivalent to the embedded wheels' BUNDLE_SHA256 verification. A compromised index, stale mirror, or intercepted TLS connection can substitute a different wheel under the requested distribution, version, and filename, after which virtualenv caches and seeds the attacker-controlled wheel into subsequently created environments. The verification applies to the default PyPI path and is intentionally skipped when PIP_INDEX_URL, PIP_EXTRA_INDEX_URL, or PIP_INDEX configures a custom index that may legitimately publish rebuilt wheels. This issue is fixed in version 21.7.12. |
| virtualenv is a tool for creating isolated virtual python environments. Prior to 21.7.13, the generated activate (bash and zsh) and activate.fish scripts place values already escaped by shlex.quote inside an additional quoted context. In the bash and zsh script, a crafted virtual environment path reaches __VIRTUAL_ENV__ when a relocated environment's recorded directory is absent; in the fish script, crafted Tcl or Tk library paths reach __TCL_LIBRARY__ or __TK_LIBRARY__. The surplus quotes can terminate the data-only quoted run and leave shell metacharacters parsed as commands when a user sources the activation script, allowing code execution with that user's privileges. This issue is fixed in version 21.7.13. |
| An authenticated user with edit permission on one folder can move a library panel into another folder where they only have view permission, through the library elements API or the equivalent App Platform resource. The update path did not check library panel create permission on the destination folder (incorrect authorization). No data from the destination folder is disclosed, and existing content there cannot be changed. |
| JupyterLab is an extensible environment for interactive and reproducible computing, based on the Jupyter Notebook Architecture. From JupyterLab 4.0.0 until 4.5.11 and 4.6.4, the PyPI Extension Manager uninstall request reaches ExtensionHandler.post, which validates extension names for installation but passes uninstall names to PyPIExtensionManager.uninstall and python -m pip uninstall without rejecting option-like values. The security impact requires that the PyPI Extension Manager is enabled, the account can call the extension API, and kernels and terminals are disabled or delegated to remote hosts; otherwise the user can already read files and make outbound requests directly. An authenticated user with extension API access can supply a pip requirements option to make the server read a local file or fetch an internal URL, and reflected parse errors can return the first unparsable line or response content. A pip log option can also create or corrupt a chosen path with pip-generated log text, but the requester cannot select an arbitrary disclosed line or arbitrary file content, and the injection does not add code execution or availability impact beyond ordinary package removal. This issue is fixed in JupyterLab 4.5.11 and 4.6.4. |
| In the Linux kernel, the following vulnerability has been resolved:
net: bcmasp: fix tx_spb_ring_full() checking same slot cnt times
The loop initialised next_index from intf->tx_spb_index on every
iteration, so incr_ring() always produced the same result and only
one slot was ever tested. Move the initialisation before the loop
so each iteration advances next_index and the function correctly
checks that cnt consecutive descriptor slots are available before
allowing a new transmission. |
| In the Linux kernel, the following vulnerability has been resolved:
net: bcmasp: clear txcb->last before writing each descriptor
bcmasp_xmit() only wrote txcb->last = true for the final fragment
of an SKB; non-final fragments left the field untouched. If a
descriptor slot was reused while it still held a stale true from
a previous SKB (possible when tx_spb_ring_full() underreported
fullness), bcmasp_tx_reclaim() would see last == true mid-SKB and
call dev_consume_skb_any() prematurely, freeing the sk_buff while
its remaining fragments were still in flight.
Unconditionally clear txcb->last before the conditional set so every
descriptor slot starts from a known false state regardless of what a
prior transmission left behind. |
| In the Linux kernel, the following vulnerability has been resolved:
bpf: Mark signal tracepoint siginfo arguments as scalar
The signal_generate and signal_deliver tracepoints declare their info
argument as a struct kernel_siginfo pointer. btf_ctx_access() therefore
treats it as a trusted pointer for tp_btf programs.
Signal delivery also uses SEND_SIG_NOINFO and SEND_SIG_PRIV as special
values for this argument. Those values are zero and one respectively,
and are not pointers. A tp_btf program can currently dereference either
value and fault the kernel. In particular, signal_generate can run from
timer interrupt context, turning the fault into a kernel panic.
Record both tracepoints in raw_tp_null_args[] and mark argument one as
a non-pointer. This preserves scalar access to the cookie while rejecting
direct and helper-mediated pointer use. Merely marking it nullable would
not suffice because SEND_SIG_PRIV is nonzero. |
| In the Linux kernel, the following vulnerability has been resolved:
erofs: disable LZ4 rolling decompression for now
LZ4 rolling decompression [1] was introduced to reduce the memory
footprint of temporary pages:
For many cases, it is needed for users to read small data within
a compressed extent (pcluster), either due to random small read, or
since uptodate folios (typically order-0) cannot be reused for
decompression again since decompression algorithm refills
already-uptodate folios.
Rolling decompression works because LZ4 is LZ77-based and only refers
to the most recent 64 KiB of decompressed data, so in theory only a
bounded rolling window of temporary pages is needed when decompressing.
It can save a lot of temporary memory, e.g.
601,960-byte data can be compressed into a 256k LZ4 compressed extent,
which means it needs 146 extra pages per request in the worst case if
rolling decompression is disabled.
However, the upstream LZ4 implementation is not under EROFS' control:
For example, the literal copy memmove() may still **copy long literals
backward** on x86 based on the address comparison even when the source
and destination ranges do not overlap (IOWs, inline decompression
doesn't need to be considered here). That breaks the rolling assumption
and makes the optimization broken.
Disable it for now to make sure the data correctness first since EROFS
is used everywhere now: The rolling window approach can be revived once
we either ensure that the official LZ4 code always copies forward for
non-overlapping ranges or maintain our own LZ4 implementation in EROFS.
The main impact is a higher runtime memory footprint; However, recent
commit 0f6273ab4637 ("erofs: add a reserved buffer pool for lz4
decompression") helps mitigate this when enabled but it's still not
perfect.
[1] https://www.usenix.org/conference/atc19/presentation/gao
§ 3.3 Decompression |
| An unprivileged, memory-protected ThreadX module can have the kernel read and write memory at addresses of its choosing, in privileged mode, and can use that to clear the MPU enable bit and remove its own isolation boundary.
The Module Manager decided whether a privileged service could dereference an object address a module named by asking only whether that address fell outside the module. The manager's object pool is outside every module, so the test was satisfied by an address shifted into the interior of one of the module's own privileged allocations, which denotes no object at all. The bytes such an address presents as a control block are bytes the module put there through ordinary create and set services, so the control block ID at the front of them could be made to read as any type the module chose, and the `_txe_` layer's ID test then agreed. The reported chain uses that to reach a privileged `memset` across an attacker-chosen range. |
