| CVE |
Vendors |
Products |
Updated |
CVSS v3.1 |
| In the Linux kernel, the following vulnerability has been resolved:
ksmbd: fix heap out-of-bounds write in krb5_authenticate()
In krb5_authenticate(), out_len is calculated to determine available
headroom in response_buf for the incoming Kerberos AP-REP token. However,
when SMB2_SESSION_SETUP is processed as a non-first element of a compounded
SMB2 request, the calculation omits work->next_smb2_rsp_hdr_off.
This causes out_len to overstate remaining buffer headroom by
the cumulative size of prior responses in the compound chain. Consequently,
the length check in ksmbd_krb5_authenticate()
(*out_len <= resp->spnego_blob_len) passes erroneously, allowing memcpy()
to write the AP-REP blob past the end of response_buf into adjacent kernel
heap memory.
Fix this by subtracting work->next_smb2_rsp_hdr_off when computing out_len,
ensuring it accurately reflects physical remaining buffer space. |
| In the Linux kernel, the following vulnerability has been resolved:
ext4: don't enable large folios on encrypted inodes
Commit 709f0f1f1bf5 ("ext4: add checks for large folio
incompatibilities when BS > PS") disables large folios at mount time
if the "encrypt" feature is set. However, enabling that feature on a
mounted filesystem circumvents that check, and writing encrypted data
results in a crash:
BUG: kernel NULL pointer dereference, address: 0000000000000028
Workqueue: ext4-rsv-conversion ext4_end_io_rsv_work
RIP: 0010:ext4_finish_bio+0xf7/0x3e0
Call Trace:
ext4_release_io_end+0x51/0x110
ext4_end_io_end+0x4c/0xe0
ext4_end_io_rsv_work+0xb3/0x100
Fix this by disabling large folios on encrypted inodes, as is
already done for inodes that use data journaling.
This affects all kernels between v6.19 and v7.2, but it is not needed
in v7.3, where the code was significantly refactored. |
| In the Linux kernel, the following vulnerability has been resolved:
sched_ext: Build the cid tables privately and publish them with RCU
The cid tables are visible to the cid kfuncs while being modified: the
first enable publishes the global pointers before filling them,
ops.init_cids() overrides rewrite them in place, and re-enables rebuild
them in place. A racing TRACING or SYSCALL program can read unfilled
entries, including uninitialized memory in the kmalloc'd tables, or torn
topo updates.
Tie the tables' lifetimes to the root sched instead: each root enable
builds a fresh set privately and publishes the per-table __rcu globals once
the layout is final, and root disable unpublishes and RCU-frees the set. A
non-NULL global is now always a fully built table which stays valid for the
reader's RCU read section, and lookups stay two loads. Kfuncs treat NULL as
no-mapping, also after the scheduler exits instead of reporting the stale
last mapping.
The cid kfuncs are available whether the root scheduler is cid-form or
cpu-form, the latter to allow gradual migration to cids. Every root
therefore builds and publishes a default mapping.
Every reader must either be gated on scheduler liveness or NULL-check
inside an RCU read section. Fix the two kfuncs that were neither:
scx_bpf_this_cid() read the table with no RCU or preemption protection and
scx_bpf_task_cid() relied on KF_RCU, which doesn't put a sleepable program
in an RCU read section. The hotplug callbacks are instead serialized by
retiring the tables inside the cpus_read_lock() section that clears
scx_root.
v2: Document why every root builds the tables (desc + cid.c comment). |
| In the Linux kernel, the following vulnerability has been resolved:
mlxsw: spectrum_flower: Fix port range register leak in tmplt_create()
mlxsw_sp_flower_tmplt_create() parses a flow_cls_offload template
into a stack-local struct mlxsw_sp_acl_rule_info purely to compute
rulei.values.elusage. Parsing can acquire port range registers via
mlxsw_sp_flower_parse_ports_range(), but since this rulei never goes
through mlxsw_sp_acl_rulei_destroy(), those registers were never
released, including through chain template deletion.
Factor out of mlxsw_sp_acl_rulei_destroy() the code to actually
release the necessary resources and call from
mlxsw_sp_flower_tmplt_create() to plug the leak.
The issue was found during a review of Wentao Liang's patch referenced
below. |
| In the Linux kernel, the following vulnerability has been resolved:
riscv: ptrace: Zero-initialize regset buffers before copyin
user_regset_copyin() only copies `count` bytes, so a PTRACE_SETREGSET
request with a short iov_len leaves the rest of the stack buffer
uninitialized. In riscv_vr_set() that garbage is validated and copied
into the target's vstate, and in riscv_cfi_set() it can be stored as
the target's shadow stack pointer. Zero both buffers, as the get path
already does. |
| In the Linux kernel, the following vulnerability has been resolved:
dm-integrity: fix NULL pointer dereference when the 'R' flag is used
If the dm-integrity device has the SB_FLAG_DIRTY_BITMAP flag set and the
user activates the device in the 'R' mode, a crash in dm_integrity_resume
happens because the function attempts to read the journal containing the
bitmap.
This patch makes dm-integrity skip any writes to the device in
dm_integrity_resume if the device is activated in the 'R' mode. |
| In the Linux kernel, the following vulnerability has been resolved:
crypto: ccp - Fix possible deadlock in SEV init failure path
__sev_platform_init_handle_init_ex_path() calls
rmp_mark_pages_firmware() with locked=false while the parent
function of init_ex_path already acquired the sev_cmd_mutex.
In the case of an RMPUPDATE failure for any page after the first, the cleanup
path would invoke reclaim pages which would result in a deadlock in
sev_do_cmd.
Pass locked=true to honor the lock status of the parent function. |
| In the Linux kernel, the following vulnerability has been resolved:
freevxfs: don't BUG() on unknown typed-extent type
vxfs_bmap_typed() handles four typed-extent types and calls BUG() in
its default case, so an on-disk typed extent with any other type value
crashes the kernel. It is reachable from ioctl(FIBMAP) on a regular
file:
kernel BUG at fs/freevxfs/vxfs_bmap.c:230!
RIP: vxfs_bmap_typed fs/freevxfs/vxfs_bmap.c:230 [inline]
vxfs_bmap1+0x128a/0x12d0 fs/freevxfs/vxfs_bmap.c:257
Replace the BUG() with WARN_ON_ONCE() and return 0 -- the value
vxfs_bmap_typed() already returns on failure (and from the DEV4 case
above); vxfs_getblk() maps 0 to -EIO, so the ioctl fails cleanly. |
| In the Linux kernel, the following vulnerability has been resolved:
drm/amdgpu: cap ATOM command table nesting depth
Cap nesting at 32 levels with execute_depth and
return -ELOOP when exceeded. |
| In the Linux kernel, the following vulnerability has been resolved:
memstick: rtsx_usb_ms: complete requests after eject instead of dropping them
memstick_check() can pass its host->removing check just before
rtsx_usb_ms_drv_remove() sets eject/removing. Its next request is then
silently dropped: rtsx_usb_ms_request() skips schedule_work() once eject
is set, and drv_remove's cancel_work_sync() can also cancel a queued
handle_req before it picks the request up. Nobody completes
card->mrq_complete.
Once memstick core waits for requests without a timeout ("memstick: core:
wait for request completion before freeing card"), this hangs removal:
memstick_check() never returns and memstick_remove_host() blocks in
flush_workqueue():
INFO: task kworker/u10:3:65 blocked for more than 20 seconds.
Workqueue: kmemstick memstick_check
__wait_for_common
memstick_check
INFO: task kworker/1:1:33 blocked for more than 20 seconds.
Workqueue: usb_hub_wq hub_event
__flush_workqueue
memstick_remove_host
rtsx_usb_ms_drv_remove
Never drop a request. rtsx_usb_ms_request() always schedules handle_req,
and handle_req fails requests with -ENOMEDIUM once eject is set, without
touching the device. drv_remove flushes handle_req instead of cancelling
it, and cancels it only after memstick_remove_host(), when no new
request can arrive, so it cannot run on a freed host.
The host_mutex drain in drv_remove is removed: handle_req always leaves
host->req NULL when it finishes, so the drain never had anything to do,
and it would now race with handle_req. |
| In the Linux kernel, the following vulnerability has been resolved:
fsverity: RCU-delay the freeing of struct fsverity_info
__fsverity_get_info() calls rhashtable_lookup_fast(), which just uses
rcu_read_lock() and doesn't directly synchronize with
fsverity_remove_info().
For the same inode this isn't a problem: its fsverity_info is removed
only at inode eviction time or upon failure to enable verity, when the
inode no longer needs its fsverity_info and it will no longer be
accessed via that inode.
However, this is broken and can cause a use-after-free for concurrent
__fsverity_get_info() for *different* inodes. Those rely on following
fsverity_info::rhash_head in the rhashtable under rcu_read_lock() only.
They also use fsverity_info::inode to do the key comparison.
Fix this by RCU-delaying the freeing of 'struct fsverity_info' after
it's been removed from the rhashtable. |
| In the Linux kernel, the following vulnerability has been resolved:
selinux: preserve NATIVE_LABELS on already-initialized sb in set_mnt_opts
When an NFSv4 filesystem exported with security_label is mounted a
second time, sget_fc() returns the existing superblock and
nfs_get_root() calls security_sb_set_mnt_opts() again on it. Since the
superblock is already SB_INITIALIZED, selinux_set_mnt_opts() takes an
early exit without setting SECURITY_LSM_NATIVE_LABELS in
*set_kern_flags. nfs_get_root() then sees kflags without
SECURITY_LSM_NATIVE_LABELS set and clears NFS_CAP_SECURITY_LABEL on
the shared nfs_server, silently disabling per-file labeling for both
the new and the original mount.
Commit 3815a245b501 ("security/selinux: fix SECURITY_LSM_NATIVE_LABELS
on reused superblock") fixed the same problem in
selinux_sb_clone_mnt_opts(). The reused-superblock path for a plain
second mount now goes through sb_set_mnt_opts rather than
sb_clone_mnt_opts, so it needs the same treatment: on both
SE_SBINITIALIZED early exits, set SECURITY_LSM_NATIVE_LABELS in
*set_kern_flags when the superblock was already using
SECURITY_FS_USE_NATVE. |
| In the Linux kernel, the following vulnerability has been resolved:
drm/xe: harden adjust_idledly() against divide-by-zero and overflow
adjust_idledly() has several corner-case issues flagged during review:
1. If xe_gt_clock_init() failed to recognise the crystal clock,
gt->info.timestamp_base is 0, which makes idledly_units_ps also 0.
The subsequent DIV_ROUND_CLOSEST(..., idledly_units_ps) is then a
divide-by-zero and panics the kernel.
2. The tick-to-ns conversions are done in u32:
idledly * idledly_units_ps, (maxcnt - 1) * 1000
Both overflow u32 before DIV_ROUND_CLOSEST() sees them.
3. If IDLE_WAIT_TIME reads back as 0, maxcnt evaluates to 0 and
the maxcnt - 1 clamp wraps to 0xFFFFFFFF in u32.
4. The register only stores whole ticks, so the clamped ns value has
to be converted to ticks and back. DIV_ROUND_CLOSEST() can round
that conversion up past maxcnt:
maxcnt = 640 ns, one tick = 666664 ps
clamp: maxcnt - 1 = 639 ns
ns -> ticks: 639000 / 666664 = 0.958 -> rounds to 1 tick
tick -> ns: 1 * 666664 / 1000 = 667 ns
667 ns is programmed into RING_IDLEDLY, but 667 >= maxcnt (640),
so xe_gt_WARN_ON() fires again on every subsequent init.
Return early if timestamp_base is 0 (the unknown-crystal path).
Do the conversions in u64 via the *_ULL() helpers so they cannot wrap.
Clamp with a floor (DIV_ROUND_DOWN_ULL) so the programmed delay stays
strictly below maxcnt, and guard the maxcnt == 0 case with a zero delay
while still writing RING_IDLEDLY so INHIBIT_SWITCH_UNTIL_PREEMPTED is
cleared.
v2: Drop the redundant warn on the timestamp_base == 0 path;
xe_gt_clock_init() already warns on an unrecognised crystal clock.
Keep the early return to avoid the divide-by-zero. - Vinay
v3: Field-mask the RING_IDLEDLY write with REG_FIELD_PREP(IDLE_DELAY, ...)
instead of writing the raw tick count, which could clobber
INHIBIT_SWITCH_UNTIL_PREEMPTED and reserved bits. Split the
inhibit-switch clear from the maxcnt clamp so a set inhibit bit no
longer forces a needless delay overwrite when the delay itself is
already valid. Use gt_to_xe(gt) instead of gt_to_xe(hwe->gt).
(cherry picked from commit d864065ea25e9d12897c175de9176ce46677e176) |
| In the Linux kernel, the following vulnerability has been resolved:
drm/amd/display: Remove sink usage from DPMS
[Why]
stream->sink is optional and can be null, so should always be checked
before dereference. Additionally, most of its usage in DPMS sequences
is for stream->sink->link, which can be replaced with stream->link,
as the two should always be the same.
[How]
* Replace stream->sink->link in DPMS on/off
* Add assert to USB4 BW allocation where sink is required
* Avoid inconsistencies in resource access, e.g. don't repeat
stream->link after it was already saved to a local variable
* Pull out effective VPG calculation to helper getter
* Formatting fixes |
| In the Linux kernel, the following vulnerability has been resolved:
KVM: arm64: nv: Fix life cycle of the nested_mmus array
The nested_mmus array holds the shadow page tables that are used when
a guest is running a nested context. These structures are allocated on
VCPU_INIT for whole guest, which implies that they may have to be
relocated as the array grows.
Should a VCPU_INIT occur whilst a vcpu is actively running an L2 and
that the allocation requires relocation, that vcpu will still be
running with a pointer to the previous structure, which will have been
freed.
Fix this by turning the array of structures to an array of pointers,
which is now allocated at VM creation, sized to the absolute maximum
that KVM can handle.
In turn, each VCPU_INIT contributes S2_MMU_PER_VCPU to the pool. No
reallocation is ever performed, and the life cycle of each object is
much clearer:
- the nested_mmus array is allocated in kvm_init_nested(), and freed
in kvm_arch_destroy_vm()
- s2_mmu structures are allocated in kvm_vcpu_init_nested(), and freed
on kvm_arch_flush_shadow_all()
Finally, the freeing of vcpu->arch.vncr_array is made consistent
rather than being done on some failure paths, but not others. |
| In the Linux kernel, the following vulnerability has been resolved:
KVM: arm64: Derive GUEST_HAS_SVE from the SVE feature bit at EL2
pkvm_init_features_from_host() takes KVM_ARCH_FLAG_GUEST_HAS_SVE and
KVM_ARM_VCPU_SVE from the host separately, but pkvm_vcpu_init_sve()
tests the bit while vcpu_has_sve() reads the flag. A host that sets the
flag without the bit gets a vCPU with a NULL sve_state that the world
switch loads the guest's SVE state from.
Derive the flag from the bit, and drop the protected path's copy of the
host's flag, which is dead code since protected VMs are not allowed SVE. |
| In the Linux kernel, the following vulnerability has been resolved:
namespace: look at the topmost mount for a mount namespace file
attach_recursive_mnt() preallocates a mountpoint for the root of the
topmost mount of the source so that a mount that already sits at the
destination can be put on top of the source or on top of one of its
propagated copies.
The copies are made without CL_COPY_MNT_NS_FILE so their chain of
overmounts is shorter than the source's. It ends below the first bind
mount of a mount namespace file. So while the loop walks up the chain of
the source it remembers the mountpoint of that mount in "shorter" and
the existing mount is put there for the copies.
But the loop ends at the topmost mount without ever looking at it. If
the topmost mount is the only mount namespace file in the chain
"shorter" stays NULL and mnt_change_mountpoint() attaches the existing
mount of the copy below the root of the mount namespace file. That's a
dentry of nsfs. No path walk in the copy's mount namespace ever gets
there. The mount is gone until its parent goes and the copy that took
its place can't be unmounted synchronously because it has a child:
S bind mount of a file
N bind mount of a mount namespace file on top of S
A shared mount, B a slave of A, Q mounted on B/file
move_mount(S, A/file)
cat B/file -> the content of S instead of Q
umount B/file -> EBUSY
Look at every mount of the chain including the topmost one. |
| In the Linux kernel, the following vulnerability has been resolved:
can: dev: init_can_skb(): restore skb header initialization
Commit 9f10374bb024 ("can: remove private CAN skb headroom infrastructure")
removed the skb_reset_mac_header()/skb_reset_network_header()/
skb_reset_transport_header() calls from init_can_skb(). As a result, RX
skbs from alloc_can_skb() and friends again carry mac_header = 0xFFFF.
When such an skb reaches packet_rcv_spkt() (SOCK_PACKET), the push length
calculation overflows and triggers skb_under_panic -> kernel BUG -> full
machine panic.
The same issue was originally reported in 2014 on linux-can and fixed by
commit 969439016d2c ("can: add missing initialisations in CAN related
skbuffs"). packet_rcv_spkt() itself has never been hardened: only
packet_rcv() and tpacket_rcv() gained dev_has_header() checks in
commit d549699048b4 ("net/packet: fix packet receive on L3 devices
without visible hard header"). |
| In the Linux kernel, the following vulnerability has been resolved:
Input: ati_remote2 - fix type confusion in device attribute handlers
Previously, the channel_mask and mode_mask attributes were registered on
the parent usb_device via sysfs_create_group(). When commit b20d6bf8014b
("Input: ati-remote2 - use driver core to instantiate device
attributes") converted the driver to let the driver core manage them via
dev_groups in struct usb_driver, the attributes moved to the bound
usb_interface devices, but the show and store callbacks were not updated
accordingly.
As a result, the callbacks still invoked to_usb_device() on a device
pointer belonging to a struct usb_interface, producing an invalid
usb_device pointer.
Use to_usb_interface() directly in the attribute handlers to obtain the
interface and its driver data. |
| In the Linux kernel, the following vulnerability has been resolved:
ipv4: udp: Create exceptions before socket matching
Currently, when ICMP Fragmentation Needed and Redirect Message packets
are locally delivered and quote a UDP packet, a FIB nexthop exception
(FNHE) is only created if the kernel can match the UDP packet to an
existing socket.
This behavior allows off-path attackers to conduct a side-channel attack
on the FNHE cache in order to discover the ephemeral port used by a
connected UDP socket.
Commit 6457378fe796 ("ipv4: use siphash instead of Jenkins in
fnhe_hashfun()") and commit 67d6d681e15b ("ipv4: make exception cache
less predictible") tried to mitigate such attacks by making it harder
for attackers to discover hash collisions in the FNHE cache and by
randomizing the number of exceptions a hash bucket can hold,
respectively. Unfortunately, both of the mitigations can be bypassed.
Instead, mitigate such attacks by always creating a FNHE, even before
trying to find a matching socket. Do that by calling ipv4_update_pmtu()
and ipv4_redirect(), the helpers used when the quoted packet did not
originate from a socket.
This means that guesses (right or wrong) from an off-path attacker will
always result in a FNHE being created or updated in the cache that the
attacker can observe.
Pass an oif of 0, in a similar fashion to icmp_err(). This is also the
oif used by the socket path for sockets that are not bound to a device.
Note that this does not allow attackers to create FNHEs that they could
not create before, as both helpers can already be reached with little to
no validation. For example, by sending an ICMP error that quotes an ICMP
Echo Reply or one that quotes a UDP source port that matches a wildcard
socket.
Also note that in the good case (matched socket) the above scheme comes
at the cost of an extra route lookup, as the no socket helpers perform
their own lookup before the one performed by ipv4_sk_update_pmtu() /
ipv4_sk_redirect(). When the two resolve to different nexthops, it also
results in two exceptions being created for the same destination IP. One
in the FNHE cache of the nexthop resolved by the no socket helpers and
another in the FNHE cache of the nexthop used by the socket. |
