| CVE |
Vendors |
Products |
Updated |
CVSS v3.1 |
| In the Linux kernel, the following vulnerability has been resolved:
bpf: Reject pkt arguments in mutating subprogs
The verifier tracks changes in how PTR_TO_PACKET registers'
bounds are modified across subprog boundaries. PTR_TO_PACKET
registers are actually passed as PTR_TO_MEM, which is assumed
valid for the entire call. This is not the case with packet memory,
where a pskb_* call may invalidate its memory region.
Reject BPF code that passes PTR_TO_PACKET pointers to subprogs that
may mutate a packet. We cannot pass the pointer as a true PTR_TO_PACKET
because we would also need to somehow pass the PTR_TO_PACKET_META
or PTR_TO_PACKET_END to the subprog. Since we cannot avoid representing
the pointer in the subprog as PTR_TO_MEM, only permit it if the
subprog is guaranteed not to mutate the packet. |
| The Web add-on's HTTP server dereferences and releases an uninitialized pointer when it detects a `Content-Length` underflow while processing a `PUT` request. The condition is reachable by an unauthenticated remote client with a single malformed request. |
| In the Linux kernel, the following vulnerability has been resolved:
net: bcmgenet: stop Tx NAPI before disabling the queues
bcmgenet_netif_stop() and the Wake-on-LAN branch of bcmgenet_suspend()
both disable the Tx queues first and stop Tx NAPI several steps later. A
completion in flight calls netif_tx_wake_queue() in between, and nothing
stops the queue again, so a transmit can reach the rings after they have
been freed.
Close is safe because dev_deactivate_many() stops the qdisc first.
bcmgenet_suspend() does not, so stop Tx NAPI before the queues on both
paths.
KASAN on a Raspberry Pi CM4, driven from an MTU change because suspend
freezes user space before the callback runs:
BUG: KASAN: use-after-free in bcmgenet_xmit+0x17f8/0x2258
Write of size 8 at addr ffffff8055844a68 by task ksoftirqd/0/14
bcmgenet_xmit+0x17f8/0x2258
dev_hard_start_xmit+0x13c/0x588
sch_direct_xmit+0x108/0x340
__dev_queue_xmit+0x1190/0x3848 |
| In the Linux kernel, the following vulnerability has been resolved:
nfc: llcp: Fix race condition in accept_queue lifecycle
In nfc_llcp_socket_release(), sockets and listener accept queues are
walked under the local sockets rwlock and bh_lock_sock(). However,
bh_lock_sock() does not synchronise against process-context lock_sock()
held by nfc_llcp_accept_dequeue() during accept(). Because
socket_release() does not check sock_owned_by_user(), both paths can
concurrently unlink and release the same child socket, resulting in
use-after-free or a NULL pointer dereference of child->parent in
nfc_llcp_accept_unlink().
Fix this synchronisation race by having nfc_llcp_socket_release() use
process-context lock_sock() instead of bh_lock_sock():
1. Pop sockets from the local sockets list under the write lock using
nfc_llcp_sock_list_pop() so lock_sock() can be acquired without
holding the rwlock.
2. Because lock_sock() can sleep, defer the final release of the
nfc_llcp_local structure to a workqueue (release_work). This avoids
a sleeping-in-atomic bug when the last local reference is dropped
from softirq context. Additionally, hold a single device reference
on local from registration until final destruction.
3. In nfc_llcp_local_get(), use kref_get_unless_zero() to prevent
resurrecting a local object whose teardown has been scheduled.
4. In llcp_sock_accept(), verify that the listener socket state is still
LLCP_LISTEN after waking from schedule_timeout() to prevent hangs if
the listener is closed concurrently.
5. When unlinking unaccepted child sockets during listener release,
unlink them from local->sockets, call sock_orphan(), and drop their
initial sk_alloc creation reference via sock_put().
6. Make nfc_llcp_accept_unlink() idempotent by guarding parent access with
a NULL check. |
| In the Linux kernel, the following vulnerability has been resolved:
net: spacemit: clear TX descriptor on fragment mapping failure
emac_tx_mem_map() writes TX_DESC_0_OWN into the ring descriptor for
every slot beyond old_head as soon as that slot's memset()'d local
copy is committed with "*tx_desc_addr = tx_desc", i.e. before the
buffers for that slot have necessarily all been mapped successfully.
If emac_tx_map_frag() then fails on a later fragment, the err_free_skb
path calls emac_free_tx_buf() to unmap and drop the skb, but leaves
the already-written descriptor memory untouched, and tx_ring->head is
never advanced past old_head (the "tx_ring->head = head" store is
skipped by the goto).
So a slot between old_head and the rolled-back head can be left with
TX_DESC_0_OWN set and buffer_addr_{1,2} pointing at DMA mappings that
emac_free_tx_buf() just tore down, while software considers that slot
free again. The next successful emac_tx_mem_map() call only rebuilds
old_head itself; if the DMA engine auto-advances into the following
descriptor once it finishes old_head's packet, it will fetch that
stale, already-unmapped address.
emac_tx_clean_desc() already treats emac_free_tx_buf() and clearing
the descriptor as a pair when reclaiming completed descriptors; do
the same in the mapping failure path. |
| Untrusted pointer dereference in Windows Network File System allows an authorized attacker to disclose information locally. |
| Untrusted pointer dereference in Windows NTFS allows an authorized attacker to elevate privileges locally. |
| when EAP runs with -secmgr, the openjdk-orb's JDKBridge honours attacker-supplied CDR codebase URLs during object unmarshalling on :3528, allowing an unauthenticated attacker to load and instantiate arbitrary classes from a remote URL in the server JVM before EJB security interceptors run. |
| In the Linux kernel, the following vulnerability has been resolved:
mm/hugetlb: do not dissolve gigantic pages without runtime support
dissolve_free_hugetlb_folio() doesn't check
hstate_is_gigantic_no_runtime(h) though remove_hugetlb_folio()/
update_and_free_hugetlb_folio() silently bail for such folios, so it frees
a still-listed folio and, on vmemmap restore failure, the
add_hugetlb_folio() rollback corrupts the free list. |
| In the Linux kernel, the following vulnerability has been resolved:
writeback: report a Tasks-RCU quiescent state per cgwb drain pass
cleanup_offline_cgwbs_workfn() drains a dying cgwb by calling
cleanup_offline_cgwb() until it returns false, with a cond_resched()
between passes. On a CONFIG_PREEMPTION kernel that cond_resched() does
nothing: _cond_resched() is a plain "return 0", and under PREEMPT_DYNAMIC
the full and lazy modes disable it. Since commit 7dadeaa6e851 ("sched:
Further restrict the preemption modes") those are the only two models on
the architectures with PREEMPT_LAZY support, arm64 and x86 among them, so
the drain loop never reports a Tasks-RCU quiescent state.
A worker draining a cgwb with millions of attached inodes runs for
minutes. On a 6.18 arm64 host in lazy mode the cgwb worker drained one
dying cgroup's writeback domain for over 11 minutes. A BPF program unlink
(bpf_trampoline_unlink_prog -> bpf_trampoline_update ->
unregister_ftrace_direct -> ftrace_shutdown -> synchronize_rcu_tasks())
waited on that grace period while holding the trampoline mutex, 42 tasks
queued behind it in D state, and the hung task detector fired at 614 s and
panicked the host. Any BPF or ftrace detach during a long drain inherits
the drain's length.
Fix this by calling cond_resched_tasks_rcu_qs() so we do not stall out
anybody who calls sycnrhonize_rcu_tasks(). We put this in a do { } while
loop because if we have many small cgroups cleanup_offline_cgwb() will
return false and we will never call cond_resched_tasks_rcu_qs(), creating
the same problem. |
| In the Linux kernel, the following vulnerability has been resolved:
sched_ext: Derive SCX_RQ_IN_WAKEUP from the core enqueue flags
schedule_deferred_locked() skips scheduling a deferred action while
SCX_RQ_IN_WAKEUP is set and relies on the task_woken_scx() call that follows
a wakeup enqueue to run it. enqueue_task_scx() sets the flag from the merged
enqueue flags, which include the flags stashed for a remote activation.
move_remote_task_to_local_dsq() thus sets SCX_RQ_IN_WAKEUP on the
destination rq when the moved task was woken up, although no
task_woken_scx() follows that activation.
An IMMED insert into a busy destination requests a local reenqueue during
that enqueue. The request gets linked but not scheduled and stays pending
until an unrelated wakeup or preemption on that CPU runs the deferred
actions. The IMMED task sits behind the running task in the meantime. If
nothing runs them before the scheduler is disabled, the request outlives the
scheduler and points into its freed per-cpu area, which the next scheduler
dereferences from run_deferred().
Test the core enqueue flags for the wakeup bit. Only the core's wakeup path
is followed by task_woken_scx(). |
| In the Linux kernel, the following vulnerability has been resolved:
packet: use ubuf_info completion for TX_RING packets
tpacket_snd sends skbs with frags pointing into its ring slots. Slots
are released when skb->destructor is called.
A call to skb_orphan calls skb->destructor before the skb is freed.
This can cause the slot to be reused while still linked into the skb.
Switch to standard zerocopy completion (ubuf_info) so the slot is only
released once all references to the payload are freed or copied.
Restore skb->destructor to standard sock_wfree.
The ubuf_info completion callback can be called with a NULL skb, but
only from net_zcopy_put and related API, used by zerocopy implementations
that hold their own reference on the uarg, such as MSG_ZEROCOPY. This
uarg is only ever completed from skb_zcopy_clear, so skb is always set.
To prevent userspace from aliasing in-flight state on shared ring
slots, allocate tpacket_uarg per packet, rather than per slot. This
adds a small allocation to the transmit path. Use standard kmalloc to
allow backporting to stable kernels.
The uarg holds an sk_wmem_alloc reference, rather than an sk_refcnt
reference. packet_free_tx_ring waits on sk_wmem_alloc before freeing
the ring pages. Always allocate vec->deferred for tx_ring so page-backed
rings also wait on sk_wmem_alloc when skb_copy_ubufs drops page refs
before calling tpacket_ubuf_complete.
Drop the tx_ring.pg_vec test that tpacket_destruct_skb performed before
accessing the slot. The sk_wmem_alloc reference now guarantees that the
slot is valid. The test is also not sufficient by itself, as it reads
pg_vec without pg_vec_lock, so it can race with packet_set_ring.
As a result a slot is released when its payload is copied, which can
be before transmission (e.g., in skb_orphan_frags_rx). If copied
before skb_tx_timestamp() is called, no slot timestamp is recorded,
similar to when skb_orphan() was called early in the datapath before
this patch.
Revert the now unused previous skb_zcopy_.._nouarg infra.
Depends on commit 992cc9f94ca9 ("net/packet: defer vmalloc TX_RING
free until skbs finish"). |
| In the Linux kernel, the following vulnerability has been resolved:
rds: ib: Clear the sg list when mapping an MR fails
rds_ib_map_frmr() stores the caller's scatterlist in the MR before DMA
mapping and registration can fail. On failure, __rds_rdma_map() unpins
the pages and frees the scatterlist, but rds_ib_free_frmr() can still
return the MR to the pool with the stale pointer set.
This leaves the pool with a dangling scatterlist and can lead to local
privilege escalation. KASAN detects the resulting use-after-free when the
MR is later torn down:
BUG: KASAN: slab-use-after-free in __rds_ib_teardown_mr
Read of size 8
Call Trace:
__rds_ib_teardown_mr
rds_ib_unreg_frmr
rds_ib_flush_mr_pool
rds_ib_flush_mrs
rds_free_mr
rds_setsockopt
Store the scatterlist in the MR only after DMA mapping succeeds. If DMA
mapping fails, return directly while the MR fields remain clear; the caller
keeps ownership of the scatterlist and its pinned pages. If a later
registration step fails, unmap the scatterlist and clear the MR fields
before returning. |
| In the Linux kernel, the following vulnerability has been resolved:
kprobes: Fix permanent hang when flushing the kprobe optimizer
Writing 0 to /proc/sys/debug/kprobes-optimization while a kprobe is
jump-optimized never returns. The writer sleeps in D state forever with
kprobe_sysctl_mutex held, so any later read or write of that sysctl
hangs as well. For example, with vfs_read+9 as an optimizable address
in this build:
# cd /sys/kernel/tracing
# echo 'p:myprobe vfs_read+9' >> kprobe_events
# echo 1 > events/kprobes/myprobe/enable
# # wait until /sys/kernel/debug/kprobes/list shows [OPTIMIZED]
# echo 0 > /proc/sys/debug/kprobes-optimization
INFO: task sh:246 blocked for more than 10 seconds.
Call Trace:
<TASK>
__schedule+0x1176/0x4f70
schedule+0xdc/0x2c0
schedule_timeout+0x17b/0x260
wait_for_completion+0x173/0x3c0
wait_for_kprobe_optimizer_locked+0xbc/0x130
proc_kprobes_optimization_handler+0x156/0x1b0
proc_sys_call_handler+0x324/0x490
vfs_write+0x52d/0xfe0
ksys_write+0xff/0x200
do_syscall_64+0x106/0x630
entry_SYSCALL_64_after_hwframe+0x77/0x7f
</TASK>
...
INFO: task cat:265 is blocked on a mutex likely owned by task sh:246.
wait_for_kprobe_optimizer_locked() reinitializes optimizer_completion,
asks the optimizer thread to flush and sleeps in wait_for_completion().
The thread drains the (un)optimizing lists, but calls complete() only
if completion_done() is true, i.e. if the completion is already done,
which never happens while someone waits. disarm_all_kprobes() and
kprobe_trace_self_tests_init() wait the same way.
Calling complete() unconditionally would not be enough: the waiter
drops kprobe_mutex while it sleeps, and nothing else serializes the
sysctl handler against the debugfs "enabled" file. A second flusher
that still finds the lists non-empty, e.g. because a disabled probe is
queued for unoptimizing, reinitializes the completion under the first:
sysctl write debugfs "enabled" write
unoptimize_all_kprobes()
wait_for_kprobe_optimizer_locked()
init_completion(c)
mutex_unlock(&kprobe_mutex)
wait_for_completion(c)
disarm_all_kprobes()
wait_for_kprobe_optimizer_locked()
init_completion(c)
// c->wait is reset, the first
// waiter is off the queue
mutex_unlock(&kprobe_mutex)
wait_for_completion(c)
kprobe_optimizer()
complete(c)
// wakes the debugfs writer only
where c is &optimizer_completion. Lining up the two writes during an
optimizer pass loses the sysctl writer this way.
Replace the completion with a counter of optimizer passes, bumped at the
end of each pass and signalled with wake_up_var_locked(), both under
kprobe_mutex. A flusher samples the count and waits with
wait_var_event_mutex(), which drops kprobe_mutex only while sleeping, so
a new count means a whole pass ran in the meantime. Nothing is
reinitialized, so several flushers can sleep in the wait at once. |
| In the Linux kernel, the following vulnerability has been resolved:
ipe: fix use-after-free when auditing a newly loaded policy
new_policy() audits the policy after ipe_new_policyfs_node() publishes it
and drops the new directory's inode lock. A concurrent delete can free
the policy while ipe_audit_policy_load() is still using it.
Audit the successful load under that lock.
[FW: remove model name according to latest guideline] |
| In the Linux kernel, the following vulnerability has been resolved:
smb: client: flush dirty data before zeroing a range
smb3_zero_range() emulates FALLOC_FL_ZERO_RANGE by invalidating the
page cache over the target range with truncate_pagecache_range() and
then issuing FSCTL_SET_ZERO_DATA to the server.
Dirty data was only flushed conditionally, when the range reached or
extended EOF. For a purely interior zero range that does not reach
EOF, no flush happened, so a dirty folio overlapping the range could
be written back to the server after the FSCTL and refill the range
that was just zeroed with stale data.
Fix this by unconditionally flushing and waiting for dirty data in the
range before invalidating the page cache and issuing
FSCTL_SET_ZERO_DATA, exactly as was done for smb3_punch_hole() in
commit d7d2adcd022b ("smb/client: flush dirty data before punching a
hole"); the two paths are structurally identical here.
This is observed as generic/363 randomly reading stale data where a
zeroed range is expected against Windows Server. |
| Untrusted pointer dereference in Microsoft Office Word allows an unauthorized attacker to disclose information over a network. |
| In the Linux kernel, the following vulnerability has been resolved:
KVM: arm64: Clear __hyp_running_vcpu when flushing the pKVM hyp vCPU
flush_hyp_vcpu() copies the host vCPU context into the hyp's private
vCPU on every run. ctxt_to_vcpu() expects a guest context to have a
NULL __hyp_running_vcpu, which is only ever set on the host context, so
that it resolves the vCPU via container_of(). While this is generally
the case, flush_hyp_vcpu() copies the context verbatim and does not
enforce this, so a value provided by the host is dereferenced at EL2
(host -> EL2).
Fix by clearing __hyp_running_vcpu after the copy. |
| In the Linux kernel, the following vulnerability has been resolved:
ip6: vti: Use ip6_tnl.net in vti6_changelink().
ip netns add ns1
ip netns add ns2
ip -n ns1 link add vti6_test type vti6 remote ::1 local ::2 key 7
ip -n ns1 link set vti6_test netns ns2
ip -n ns2 link set vti6_test type vti6 remote ::3 local ::4 key 9
ip netns del ns2
ip netns del ns1
[ 132.495484] ------------[ cut here ]------------
[ 132.497609] kernel BUG at net/core/dev.c:12376!
Commit 61220ab34948 ("vti6: Enable namespace changing") dropped
NETIF_F_NETNS_LOCAL from vti6 devices. A vti6 tunnel can then
move through IFLA_NET_NS_FD. After the move dev_net(dev) points
at the new netns while t->net stays at the creation netns.
vti6_changelink() and vti6_update() still use dev_net(dev) and
dev_net(t->dev). They unlink from one per netns hash and relink
into another. The creation netns is left with a stale entry.
cleanup_net() of that netns later walks freed memory.
Reachable from an unprivileged user namespace (unshare --user
--map-root-user --net). Cross tenant scope on container hosts. |
| In the Linux kernel, the following vulnerability has been resolved:
net: phylink: record the PHY only once bringup cannot fail
phylink_bringup_phy() stores the PHY in pl->phydev before its last
fallible step: on a MAC whose phylink ops implement LPI,
phy_eee_rx_clock_stop() can fail with a real MDIO error. The callers
unwind with phy_detach(), which knows nothing about pl->phydev, so a
pointer to a PHY that is no longer attached outlives the failed
connect.
What that costs depends on how the caller got here.
phylink_connect_phy() goes through phylink_attach_phy(), which refuses
to attach while pl->phydev is set, turning a transient MDIO error into
a permanent -EBUSY. The SFP path is worse than that: sfp_sm_probe_phy()
answers the failure with phy_device_remove() and phy_device_free(), and
it assigns sfp->mod_phy only past that error return, so nothing clears
pl->phydev and it is left pointing at a freed phy_device that
phylink_resolve() and the ethtool helpers go on reading.
phylink_fwnode_phy_connect() has no such check, so a later connect
overwrites the stale pointer and hides the problem. A disconnect does
not: phylink_disconnect_phy() hands that pointer to phy_disconnect(),
and the second phy_detach() on the same PHY drops references the first
one already released.
Found while making a DSA port survive a PHY whose driver arrives after
the switch probes: keeping the port across a failed connect and
retrying is what makes this window reachable.
Publish the pointer after the last call that can fail instead of
unwinding it afterwards. Nothing between the two points reads
pl->phydev, and the registration that follows cannot fail:
phy_request_interrupt() falls back to polling on its own. The PHY-side
state keeps the order it had, so no MDIO operation moves relative to
another. |
