Export limit exceeded: 416731 CVEs match your query. Please refine your search to export 10,000 CVEs or fewer.
Export limit exceeded: 416731 CVEs match your query. Please refine your search to export 10,000 CVEs or fewer.
Export limit exceeded: 416731 CVEs match your query. Please refine your search to export 10,000 CVEs or fewer.
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Search Results (416731 CVEs found)
| CVE | Vendors | Products | Updated | CVSS v3.1 |
|---|---|---|---|---|
| CVE-2026-87098 | 1 Acronis | 1 Acronis Cyber Protect 17 | 2026-10-28 | N/A |
| Sensitive information disclosure due to improper authorization. The following products are affected: Acronis Cyber Protect 17 (Linux, Windows) before build 42587. | ||||
| CVE-2026-99101 | 1 Linux | 2 Linux, Linux Kernel | 2026-10-28 | 4.4 Medium |
| In the Linux kernel, the following vulnerability has been resolved: ntfs: move attribute payload before shrinking its record ntfs_new_attr_flags() resizes the non-resident attribute record before moving its name and mapping pairs to their shorter-header offsets when compression or sparse state is cleared. Shrinking the record first moves the following attribute over the tail of the old record. The subsequent memmove() therefore copies bytes from that following attribute instead of the old mapping pairs. Re-enabling compression on an empty file persists those bytes as a malformed mapping pairs array, which ntfsck reports as a missing or invalid run length. Move the payload before shrinking the record, while retaining the existing resize-before-move ordering when growing it. | ||||
| CVE-2026-87100 | 1 Acronis | 1 Acronis Cyber Protect 17 | 2026-10-28 | N/A |
| Protection mechanism failure due to missing binary hardening in Linux executables. The following products are affected: Acronis Cyber Protect 17 (Linux) before build 42587. | ||||
| CVE-2026-99102 | 1 Linux | 2 Linux, Linux Kernel | 2026-10-28 | 3.3 Low |
| In the Linux kernel, the following vulnerability has been resolved: ntfs: take invalidate_lock in ntfs_setattr_size() ntfs_setattr_size() updates i_size and resizes the on-disk attribute without holding mapping->invalidate_lock. Page faults take the lock shared, so a fault racing the resize can resolve a VCN against the transient runlist state of ntfs_non_resident_attr_expand() and fail with a spurious SIGBUS, and can interleave with the size-change epilogue (truncate_pagecache(), i_size_write(), pagecache_isize_extended()). Take invalidate_lock exclusively around the whole resize after inode_dio_wait(), matching the fallocate path and other filesystems such as xfs, which wraps truncate in its mmaplock (= invalidate_lock). | ||||
| CVE-2026-99127 | 1 Linux | 2 Linux, Linux Kernel | 2026-10-28 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: page_pool: keep frag_offset aligned for odd-sized requests page_pool_alloc_frag_netmem() rounds the requested fragment size with size = ALIGN(size, dma_get_cache_alignment()); dma_get_cache_alignment() returns 1 unless the architecture defines ARCH_DMA_MINALIGN, which DMA-coherent architectures such as x86 do not. There the ALIGN() is a no-op and pool->frag_offset advances by the raw, unrounded size. A single caller asking for an odd size then leaves frag_offset misaligned for every fragment carved out of that page afterwards. The pool is shared, so the damage is not confined to the caller that caused it. The per-cpu system_page_pool used by generic XDP hits this. skb_pp_cow_data() allocates its fragments with the raw packet length: size = min_t(u32, len, PAGE_SIZE); truesize = size; page = page_pool_dev_alloc(pool, &page_off, &truesize); leaving frag_offset odd for whatever is carved out of that page next. Its own head allocation is already aligned -- SKB_HEAD_ALIGN(size) plus the XDP_PACKET_HEADROOM its callers pass -- so it is a later user of the shared pool that pays: page_pool_dev_alloc_va() returns a misaligned buffer, napi_build_skb() installs it as skb->head, and skb_shinfo(skb) == skb->head + skb->end is misaligned with it. skb_shinfo()->dataref is a 4-byte atomic_t at offset 0x20, so the atomic_inc() in __skb_clone() straddles a cache line. On x86 with split lock detection -- fatal for kernel split locks by default -- this panics the machine: Oops: Split lock detected RIP: 0010:skb_clone+0x154/0x1e0 Call Trace: <IRQ> raw_local_deliver+0x1ed/0x2c0 ip_protocol_deliver_rcu+0x54/0x1c0 ip_local_deliver_finish+0x85/0x100 ip_local_deliver+0x67/0x100 __netif_receive_skb_one_core+0x85/0xa0 process_backlog+0x87/0x130 Reproduced by attaching any generic-mode XDP program to loopback and opening a RAW IPPROTO_UDP socket, which makes raw_local_deliver() clone every locally delivered UDP packet; ordinary DNS traffic then triggers it, roughly once per 2500 clones. Observed on 6.12.101 and 7.1.8. Tracing page_pool_alloc_frag_netmem() over one such run shows the amplification -- two odd-sized requests, nine misaligned offsets: requested size & 7: 0: 17035 5: 1 7: 1 frag_offset & 7: 0: 17028 3: 1 4: 1 5: 1 6: 1 7: 5 and skb_pp_cow_data() returning heads that were aligned on entry: head 0xffff8f4c86aeac00 -> 0xffff8f4c53a9a9c4 (&7=4) head 0xffff8f4d6a8a42c0 -> 0xffff8f4c4f7b7a45 (&7=5) Round the fragment size up to at least the alignment struct skb_shared_info requires, so fragments are always suitably aligned for the objects callers build on them. Architectures needing a larger DMA alignment keep it. This also makes the remainder computed in page_pool_alloc_netmem(), *size = max_size - *offset; aligned, since max_size is a power of two -- which fixes the matching misalignment of skb->end. Verified with a controlled A/B under QEMU/KVM: same tree, same config, same compiler, same rootfs and identical traffic, differing only by this patch. A SEC("xdp.frags") XDP_PASS program on lo plus UDP datagrams larger than max_head_size drives skb_pp_cow_data()'s fragment loop, which passes raw packet lengths to the pool. Measured at the return of skb_pp_cow_data(): unpatched patched skb_pp_cow_data calls 40800 40800 misaligned skb->head 1120 0 dataref at line offset >60 80 0 The last row counts the accesses that actually fault: skb_shinfo()->dataref sits at head+end+0x20 and is a 4-byte atomic, so `lock incl` splits a 64-byte cache line only when that address lands at offset 61..63. All 80 occurrences were at offset 61; the panic reported above was at offset 62. Eliminating the misalignment removes every one of them. Same class of bug as commit 3bed3cc4156e ("net: Do not allocate page fragments t ---truncated--- | ||||
| CVE-2026-99130 | 1 Linux | 2 Linux, Linux Kernel | 2026-10-28 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: io_uring/cancel: don't spin on local work the task can't run io_uring_cancel_generic() refuses to sleep while any ring on the exiting task's tctx has local work pending. It assumes the task is that ring's submitter and that the next io_uring_try_cancel_requests() pass will run the work. This does not hold for a ring that was still IORING_SETUP_R_DISABLED when the task got its tctx node from io_uring_create() or io_ringfd_register(). The submitter is set later by IORING_REGISTER_ENABLE_RINGS, possibly from another task, and only the submitter may run local work on an IORING_SETUP_DEFER_TASKRUN ring. To the exiting task the work stays pending forever, the loop never reaches schedule(), and the task trips the WARN_ON_ONCE() once and then spins in do_exit(). An unprivileged user can set this up at will by creating a disabled ring, having a child enable it and stop, posting to the ring with IORING_OP_MSG_RING and exiting with a request in flight that only the child can complete. The exiting thread burns a CPU until the child runs or dies, and with panic_on_warn set the WARN panics the kernel. Fix by skipping the sleep only when io_allowed_defer_tw_run() allows the task to run the work. This is reasonable since work it cannot run cannot complete any of its requests either, so nothing is lost by sleeping. Drop the WARN_ON_ONCE() since handing a disabled ring to another thread is a supported scenario, not a bug state. | ||||
| CVE-2026-99131 | 1 Linux | 2 Linux, Linux Kernel | 2026-10-28 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: xfs: fix capability check in xfs An user reported a bug where he managed to evade group's quota by changing a file's gid to a different group id the same user belonged to, even though quotas were enforced on both gids and the file's size was big enough to exceed the quota's hardlimit. Commit eba0549bc7d1 replaced a capable() call by a has_capability_noaudit() to prevent unnecessary selinux audit messages. Turns out that both calls have slightly different semantics even though their documentation seems similar. Where in a nutshell: capable() - Tests the task's effective credentials has_ns_capability_noaudit() - Tests the task's real credentials This most of the time has no practical difference but in some cases like changing attrs (specifically group id in this case) through a NFS client this will allow the quota code to use XFS_QMOPT_FORCE_RES, effectively bypassing quota accounting checks. Using instead ns_capable_noaudit() should fix this issue and prevent selinux audit messages. This also fix the remaining calls to has_capability_noaudit() | ||||
| CVE-2026-99132 | 1 Linux | 2 Linux, Linux Kernel | 2026-10-28 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: xfs: don't hold buffer locks across sync transaction commit in xfs_sync_sb_buf xfs_sync_sb_buf() holds sb/rtsb buffer locks across a synchronous xfs_trans_commit(), which flushes the CIL push workqueue internally. If shutdown occurs during the CIL push, xfs_buf_item_unpin() needs to lock these buffers to fail them, causing a deadlock: setlabel: holds buf lock -> flush_workqueue(xfs-cil) CIL push worker: xfs_buf_item_unpin -> xfs_buf_lock(same buf) Remove the xfs_trans_bhold() calls so that commit releases the buffer locks normally. After the sync commit, re-acquire the buffers via mp->m_sb_bp / mp->m_rtsb_bp for the on-disk writeback. | ||||
| CVE-2026-99134 | 1 Linux | 2 Linux, Linux Kernel | 2026-10-28 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: mac802154: fix data race and NULL deref on local->assoc_dev local->assoc_dev is shared between the association path and the association-response worker without common synchronization. mac802154_perform_association() stores the coordinator pointer and waits for a response. Its timeout and error paths clear the pointer and return to mac802154_associate(), which may then free the coordinator object. Meanwhile, mac802154_rx_mac_cmd_worker() may observe the associating bit and enter mac802154_process_association_resp(), which dereferences assoc_dev. The worker's bit test and the handler's pointer dereference are not atomic with respect to cleanup. Cleanup can clear assoc_dev between them, causing a NULL dereference, or free the coordinator while the response handler still uses the pointer. The recorded result is exposed to the same window. assoc_status and assoc_addr are written by the handler but read by the association path while the associating bit is still set, so a second response for the same request - a malicious one, for instance - can replace them between those reads and leave the caller with an incoherent status and address pair. The response handler only needs the coordinator extended address. Replace assoc_dev with a cached address, removing the pointer lifetime dependency. Protect the cached address and the associating bit with a dedicated spinlock. A READ_ONCE()/WRITE_ONCE() pair would not guarantee an atomic __le64 access on all 32-bit architectures. wpan_dev->association_lock cannot be reused here: nl802154_associate() holds it across rdev_associate(), hence for the whole of mac802154_perform_association() including the wait for the response. A response handler taking that lock would only get it once the association has already given up. Reset the completion, publish the cached address, and set the associating bit while holding the lock. The response handler takes the lock, rechecks the bit and the cached address, records the response, clears the bit, and only then completes the waiter. Thus cleanup cannot pass the handler between its state check and completion, and the cached 64-bit value cannot tear. The handler clears the bit before completing, not the woken waiter: otherwise complete() is issued under the lock and a second (e.g. malicious) response can reacquire it before the waiter and replace the result. So a wait that returns success implies the bit is already clear, and the success and negative-response paths return directly. The transmit-error and timeout paths still clear it under assoc_lock, which serializes any racing response against the cleanup while the call returns the error it already selected. Both paths snapshot assoc_status and assoc_addr under the same lock. Both users run in process context, so a plain spinlock is sufficient. The lock is not held while waiting for the completion. | ||||
| CVE-2026-99138 | 1 Linux | 2 Linux, Linux Kernel | 2026-10-28 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: tcp: fix use-after-free in do_tcp_getsockopt(TCP_CC_INFO) do_tcp_getsockopt() reads icsk->icsk_ca_ops and dereferences the get_info function pointer without rcu_read_lock(). With BPF struct_ops congestion control, ca_ops can point to dynamically allocated memory that is freed concurrently, resulting in a use-after-free when the kernel dereferences or calls through the stale pointer. BUG: KASAN: slab-use-after-free in do_tcp_getsockopt+0x2037/0x23e0 Read of size 8 at addr ffff888013701258 by task exploit/149 do_tcp_getsockopt+0x2037/0x23e0 (net/ipv4/tcp.c:4564) tcp_getsockopt+0x91/0xf0 __sys_getsockopt+0xf7/0x170 Fix this by wrapping the ca_ops load and get_info call within rcu_read_lock()/rcu_read_unlock(), and using READ_ONCE() to load the icsk_ca_ops pointer. | ||||
| CVE-2026-99139 | 1 Linux | 2 Linux, Linux Kernel | 2026-10-28 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: tcp: fix use-after-free in do_tcp_getsockopt(TCP_CONGESTION) do_tcp_getsockopt() reads icsk->icsk_ca_ops->name without holding rcu_read_lock(). Since commit 0baf26b0fcd7 ("bpf: tcp: Support tcp_congestion_ops in bpf"), icsk_ca_ops can point to dynamically allocated BPF struct_ops memory that may be freed concurrently via setsockopt(TCP_CONGESTION), leading to a use-after-free. BUG: KASAN: slab-use-after-free in _copy_to_user+0x37/0x60 Read of size 16 at addr ffff888013505260 by task exploit/149 _copy_to_user+0x37/0x60 do_tcp_getsockopt+0x158a/0x2460 (net/ipv4/tcp.c:4585) tcp_getsockopt+0x91/0xf0 __sys_getsockopt+0xf7/0x170 Fix this by holding rcu_read_lock() around the ca_ops->name access, using READ_ONCE() to load icsk_ca_ops, and copying the name to a stack buffer before releasing the lock. Also annotate the relevant icsk_ca_ops stores with WRITE_ONCE() to fix the accompanying KCSAN data-race issue. | ||||
| CVE-2026-70173 | 1 Microsoft | 28 Windows 10 1607, Windows 10 1809, Windows 10 21h2 and 25 more | 2026-10-28 | 5.5 Medium |
| Out-of-bounds read in Microsoft Windows Search Component allows an authorized attacker to disclose information locally. | ||||
| CVE-2026-70177 | 1 Microsoft | 28 Windows 10 1607, Windows 10 1809, Windows 10 21h2 and 25 more | 2026-10-28 | 7.8 High |
| Numeric truncation error in Microsoft Windows Search Component allows an authorized attacker to elevate privileges locally. | ||||
| CVE-2026-93515 | 1 X.org | 3 X Server, Xorg-x11-server, Xwayland | 2026-10-28 | 6.1 Medium |
| A use-after-free in present_clear_window_notifies() in the X.org X Server before 21.1.25 and X Wayland before 24.1.14 could be used by malicious X clients to crash or potentially execute code in the X server context. | ||||
| CVE-2026-70184 | 1 Microsoft | 14 Windows 10 21h2, Windows 10 21h2, Windows 10 22h2 and 11 more | 2026-10-28 | 7.8 High |
| Improper resolution of path equivalence in Windows Backup Engine allows an authorized attacker to elevate privileges locally. | ||||
| CVE-2026-70185 | 1 Microsoft | 28 Windows 10 1607, Windows 10 1809, Windows 10 21h2 and 25 more | 2026-10-28 | 8.8 High |
| Protection mechanism failure in Windows PowerShell allows an authorized attacker to bypass a security feature locally. | ||||
| CVE-2026-70195 | 1 Microsoft | 28 Windows 10 1607, Windows 10 1809, Windows 10 21h2 and 25 more | 2026-10-28 | 4.7 Medium |
| Use after free in Windows Ancillary Function Driver for WinSock allows an authorized attacker to disclose information locally. | ||||
| CVE-2026-70201 | 1 Microsoft | 12 Windows Server 2012, Windows Server 2012 (server Core Installation), Windows Server 2012 R2 and 9 more | 2026-10-28 | 5.5 Medium |
| Out-of-bounds read in Windows DHCP Server allows an authorized attacker to deny service locally. | ||||
| CVE-2026-70205 | 1 Microsoft | 28 Windows 10 1607, Windows 10 1809, Windows 10 21h2 and 25 more | 2026-10-28 | 7 High |
| Access of resource using incompatible type ('type confusion') in Windows Ancillary Function Driver for WinSock allows an authorized attacker to elevate privileges locally. | ||||
| CVE-2026-99105 | 1 Linux | 2 Linux, Linux Kernel | 2026-10-28 | 2.5 Low |
| In the Linux kernel, the following vulnerability has been resolved: sched_ext: Fix stall when a task enqueued with SCX_ENQ_LAST lands back on its CPU's local DSQ With SCX_OPS_ENQ_LAST, the last runnable task on a CPU is passed to ops.enqueue() instead of being kept running. Exiting tasks without SCX_OPS_ENQ_EXITING, migration disabled tasks without SCX_OPS_ENQ_MIGRATION_DISABLED and tasks on an offline rq skip ops.enqueue() and go straight to the local DSQ. This happens in put_prev_task_scx() after the pick has settled on idle, so nothing reschedules the CPU, which idles with the task queued until an unrelated wakeup lands on it or the watchdog fires. scx_mitosis, which sets SCX_OPS_ENQ_LAST without SCX_OPS_ENQ_EXITING, hit this during mass cgroup teardown: exiting tasks stuck in exit_mmap() for over 40 seconds. A task put on the local DSQ runs, as anywhere else. If the SCX_ENQ_LAST enqueue left the task on this CPU's local DSQ, set need_resched on the task being switched in, as proxy_resched_idle() does. resched_curr() would flag the task being put instead, and __schedule() clears that right after the pick. | ||||