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| CVE | Vendors | Products | Updated | CVSS v3.1 |
|---|---|---|---|---|
| CVE-2026-98767 | 1 Linux | 1 Linux Kernel | 2026-10-23 | 5.1 Medium |
| In the Linux kernel, the following vulnerability has been resolved: usb: dwc3: gadget: fix IRQ storm on invalid event buffer count When dwc3_check_event_buf() reads a GEVNTCOUNT value exceeding the event buffer length, commit 63ccd26cd1f6 ("usb: dwc3: gadget: check that event count does not exceed event buffer length") returns IRQ_NONE without writing back GEVNTCOUNT. Since the DWC3 interrupt is level-triggered, the uncleared IRQ source keeps the line asserted, causing a tight IRQ storm that accumulates 99,900 unhandled interrupts and triggers spurious.c:184 BUG -> kernel panic. The resulting call stack: __report_bad_irq+0xac/0xc8 note_interrupt+0x340/0x468 handle_irq_event+0xac/0xc0 handle_fasteoi_irq+0x120/0x228 gic_handle_irq+0x68/0x108 ... kernel BUG at kernel/irq/spurious.c:184 To reproduce, write a bogus value exceeding the event buffer length directly to the GEVNTCOUNT register: devmem <DWC3_BASE + 0xc40c> 4 0x1004 Write the bogus count back to GEVNTCOUNT to clear the IRQ source, consistent with the stale event clearing pattern in dwc3_event_buffers_setup(), and schedule error recovery to reinitialize the controller. | ||||
| CVE-2026-91647 | 1 Oracle | 1 Essbase | 2026-10-23 | 8.1 High |
| Vulnerability in Oracle Essbase (component: Security). The supported version that is affected is 21.8.3.0.0. Difficult to exploit vulnerability allows unauthenticated attacker with network access via TCP to compromise Oracle Essbase. Successful attacks of this vulnerability can result in takeover of Oracle Essbase. CVSS 3.1 Base Score 8.1 (Confidentiality, Integrity and Availability impacts). CVSS Vector: (CVSS:3.1/AV:N/AC:H/PR:N/UI:N/S:U/C:H/I:H/A:H). | ||||
| CVE-2026-95711 | 2026-10-23 | 7.1 High | ||
| An authentication bypass vulnerability in the web-based management interface of AOS-10 could allow an unauthenticated adjacent attacker to circumvent existing authentication controls and run arbitrary commands on the underlying host if certain preconditions outside of the attacker's control are met. Successful exploitation of this vulnerability could allow an attacker to execute arbitrary commands on the underlying operating system. | ||||
| CVE-2026-114625 | 1 Arista | 1 Velocloud Orchestrator | 2026-10-23 | 9.9 Critical |
| VeloCloud Orchestrator (VCO) on-prem has a security issue where this issue may allow a remote attacker to access privileged internal functionality and impact the VCO host. Successful exploitation may compromise the confidentiality, integrity, and availability of the orchestrator and data managed by the orchestrator. On an affected system, any authenticated user can gain operator privileges and masquerade as a local "superuser operator" user. This includes access to functionality that is intended for internal use only and which is not intended to be remotely accessible. Hosted, including Dedicated, versions of VCO were impacted and have already been patched. | ||||
| CVE-2026-88112 | 1 Microsoft | 27 Windows 10 1607, Windows 10 1809, Windows 10 21h2 and 24 more | 2026-10-23 | 8.8 High |
| Untrusted pointer dereference in DNS Server allows an unauthorized attacker to execute code over a network. | ||||
| CVE-2026-88114 | 1 Microsoft | 23 Windows 10 1607, Windows 10 1809, Windows 10 21h2 and 20 more | 2026-10-23 | 8.8 High |
| Untrusted pointer dereference in DNS Server allows an unauthorized attacker to execute code over a network. | ||||
| CVE-2026-88116 | 1 Microsoft | 23 Windows 10 1607, Windows 10 1809, Windows 10 21h2 and 20 more | 2026-10-23 | 8.8 High |
| Untrusted pointer dereference in DNS Server allows an unauthorized attacker to execute code over a network. | ||||
| CVE-2026-69919 | 1 Microsoft | 10 Windows 11 24h2, Windows 11 24h2, Windows 11 25h2 and 7 more | 2026-10-23 | 5.5 Medium |
| Out-of-bounds read in Windows Cryptographic Services allows an authorized attacker to disclose information locally. | ||||
| CVE-2026-88183 | 1 Microsoft | 11 365 Apps, Microsoft 365, Microsoft Office Ltsc 2021 and 8 more | 2026-10-23 | 6.5 Medium |
| Out-of-bounds read in Microsoft Office PowerPoint allows an unauthorized attacker to disclose information over a network. | ||||
| CVE-2026-88195 | 1 Microsoft | 5 365 Apps, Microsoft Office Ltsc 2021, Microsoft Office Ltsc 2024 and 2 more | 2026-10-23 | 6.5 Medium |
| Buffer over-read in Microsoft Office Excel allows an unauthorized attacker to disclose information over a network. | ||||
| CVE-2026-98969 | 1 Linux | 2 Linux, Linux Kernel | 2026-10-23 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: net/sched: em_text: reject unterminated algo before autoload This is a follow-up to commit 9c572a83037a ("net/sched: fix potential stack infoleak in em_text_dump()"), which zero-initialised the dump-side struct. Sashiko pointed at a pre-existing bug that exposed the change-side input-validation gap open. em_text_change() casts the raw netlink attribute payload to struct tcf_em_text and passes conf->algo, a 16-byte array with no enforced NUL terminator, to textsearch_prepare(). On the TS_AUTOLOAD retry textsearch_prepare() calls request_module("ts_%s", algo); vsnprintf() walks %s until it finds a NUL, so an algo[] with no NUL reads past the array into the adjacent struct fields and payload and feeds those bytes to the usermode helper command line. This is an out-of-bounds read and a kernel memory disclosure. Reject the attribute when no NUL exists within TC_EM_TEXT_ALGOSIZ bytes, matching the check xt_string has had since 3ab720881b6e. Conditions to recreate the bug: - CAP_NET_ADMIN on the target netns (namespace-local via unshare -Urn is enough) - install clsact on an interface, then add a basic filter with one text ematch whose algo[] is 16 bytes with no NUL (e.g. "A"*16) and pattern_len at least 1 - the add fails with -ENOENT and the kernel invokes modprobe with a module name made of "ts_" plus the 16 bytes and the adjacent payload | ||||
| CVE-2026-98971 | 1 Linux | 2 Linux, Linux Kernel | 2026-10-23 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: gpio: exar: initialize the ID before registering its cleanup devm_add_action_or_reset() invokes the cleanup action immediately when registering the action fails. gpio_exar_probe() currently stores the allocated ID in exar_gpio only after registering the action, so that failure makes exar_devm_ida_free() release ID 0. If the allocated ID is nonzero, this leaks that ID and can free ID 0 belonging to another device. Store the ID before registering the cleanup action so both the immediate failure path and normal device teardown release the correct allocation. | ||||
| CVE-2026-98989 | 1 Linux | 2 Linux, Linux Kernel | 2026-10-23 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: namespace: check a recursive bind mount for mount namespace loops do_loopback() refuses to bind mount the file of a mount namespace that is as old as the caller's or older because a mount namespace that holds a mount of its own file, or of an ancestor's, would cause a cycle. But it only checks the dentry the bind mount starts from. With MS_REC everything below it is copied and do_loopback() passes CL_COPY_MNT_NS_FILE so mount namespace files below the source are copied. That's fine for a source in the caller's own mount namespace. Every mount namespace file in there passed the same check when it was bind-mounted. It isn't fine for a source in another mount namespace. may_copy_tree() accepts a bind mount of any nsfs or pidfs file no matter what mount namespace it lives in so that /proc/<pid>/ns/<ns> and pidfds can be bind mounted. If we create a bind-mount stack of mount namespaces file descriptors the kernel will copy them irrespective of their ancestoral relationship to the mount namespace in question: 151 146 0:7 net:[4026531833] /tmp/nrc/y rw - nsfs nsfs rw 152 151 0:7 mnt:[4026532293] /tmp/nrc/y rw - nsfs nsfs rw Mount 152 is a mount of the mount namespace file of mount namespace 4026532293 inside mount namespace 4026532293. That namespace and every mount in it are leaked... All it takes is a process in an older mount namespace that stacks the file and repeating it leaks without limit: after control: Shmem: 380 kB child: mount(/proc/self/fd/6, MS_BIND|MS_REC): ok after cycle: Shmem: 65916 kB do_move_mount() runs check_for_nsfs_mounts() over a detached tree for exactly that reason. Do the same for the copy before it is grafted. | ||||
| CVE-2026-98996 | 1 Linux | 2 Linux, Linux Kernel | 2026-10-23 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: fs: don't silently unmount busy mounts The propagate_mount_busy() helper exists to decide whether a synchronous can suceed. It does that by looking at the copies of the victims in the mounts its parent propagates to. One of those functions from propagation hell. It skips a copy that has child mounts except for the case of a single child mount covering the copy's root. That algorithm used to be exact. It isn't anymore. Originally only childless copies were unmounted during propagation. And 1064f874abc0 ("mnt: Tuck mounts under others instead of creating shadow/side mounts.") ended up adding covered mounts to both sides in one go. Along came 99b19d16471e ("mnt: In propgate_umount handle visiting mounts in any order") and that started to unmount more than before: [1]: A copy of a mount is unmounted when each of its children is either its overmount or a copy of the victim itself. In the former case the overmount gets reparented. In the latter case the copy of the victim will end up being unmounted. So propagate_umount() ended up being rewritten without adjusting propagate_mount_busy(). And currently propagate_mount_busy() doesn't look at copies of the victim that have two or more children nor a single child that is not the overmount. So any such copy in [1] is not checked for references. The result is that a synchronous unmount succeeds, pulling out a mount that is still in use. A container can run into this with its own mounts. The host shares a tree with the container and the host has a mount in that tree: mount -t tmpfs none /mnt mount --make-shared /mnt mount -t tmpfs none /mnt/a The container's /mnt is a slave copy of the host mount. The container now takes a detached copy of the tree and mounts that copy beneath its propagated copy of /mnt/a and keeps the file descriptor to the tree open: unshare -m --propagation unchanged mount --make-rslave / fd = open_tree(AT_FDCWD, "/mnt", OPEN_TREE_CLONE | AT_RECURSIVE) move_mount(fd, "", AT_FDCWD, "/mnt/a", MOVE_MOUNT_BENEATH) grep /mnt /proc/self/mountinfo 775 355 ... /mnt ... master:646 777 775 ... /mnt/a ... master:646 776 777 ... /mnt/a ... master:647 778 777 ... /mnt/a/a ... master:647 The now attached tree (777) is now mounted beneath the container's copy of /mnt/a. That's also where the host mount sits (as seen from the host mount namespace). So the propagated copy (776) of the host's mount is on top of its root and the copy of that (778) is inside it. Now the host runs: umount /mnt/a and it succeeds. The moved tree tree and the copy inside of it are gone from the container. Now only the propagated copy is left and it got reparented to where it was before: grep /mnt /proc/self/mountinfo 775 355 ... /mnt ... master:646 776 775 ... /mnt/a ... But the file descriptor still refers to the moved tree. So a synchronous umount detached a mount that is still in use. Teach propagate_mount_busy() the same checks that propagate_umount() does. It now checks for a single victim mount without children for which it can assume that MNT_LOCKED is cleared on every copy like propagate_umount() does. The copies form chains. IOW, when a copy itself receives propagation from the victim's parent then the mount at the same mountpoint inside that copy is a copy as well. Whether a mount receives propagation from the victim's can simply be checked by walking its masters. Walk each chain once from its top so we are sure that nested copies stay linear. Check every reference once of every copy that gets unmounted. | ||||
| CVE-2026-99001 | 1 Linux | 2 Linux, Linux Kernel | 2026-10-23 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: drm/xe/i2c: cancel the client work on remove xe_i2c_notifier() stores the DesignWare adapter in i2c->adapter and schedules i2c->work when the adapter is registered under the xe I2C platform device, and xe_i2c_client_work() then instantiates the AMC client device on that adapter. xe_i2c_remove() tears down the AMC, unregisters the client devices, the bus notifier and the adapter platform device, but it never drains i2c->work. A work item that is still queued or running when the adapter is unregistered dereferences i2c->adapter in i2c_new_client_device() after platform_device_unregister() has released the adapter. The work item is also embedded in the devm-allocated struct xe_i2c, so a work item still queued after the drm device devm unwind frees that allocation runs its callback on freed memory. The bus notifier is the only thing that schedules this work, and it is unregistered after the client devices. An instance that is still queued when the teardown runs can therefore write i2c->client[XE_I2C_CLIENT_AMC] while the loop is unregistering and clearing the same array, and an AMC client it instantiates late is only cleaned up by the adapter's own child sweep in i2c_del_adapter(). Move bus_unregister_notifier() in front of the client teardown loop and cancel the work right after it, so no new instance can be scheduled and a queued instance is drained before the client array is touched. A running instance still finds a live adapter, since the adapter is unregistered later. (cherry picked from commit a23f27d5ec11c3f418c5e5531eea34ccda2b5b20) | ||||
| CVE-2026-108396 | 1 Microsoft | 20 Windows 10 1809, Windows 10 21h2, Windows 10 21h2 and 17 more | 2026-10-23 | 7 High |
| Time-of-check time-of-use (toctou) race condition in Windows Modern Device Management (MDM) allows an authorized attacker to elevate privileges locally. | ||||
| CVE-2026-19754 | 1 Baserow | 1 Baserow | 2026-10-23 | N/A |
| Baserow versions 2.2.0 through 2.3.3 contain an SQL injection vulnerability in the index() formula function. A low-privileged authenticated user who can create or modify Formula fields can provide an undocumented fourth argument that is treated as a SQL template and interpolated directly into a PostgreSQL expression. The generated SQL executes through Baserow's database connection with the Baserow PostgreSQL role permissions, allowing data outside the user's workspace permissions to be read or modified. | ||||
| CVE-2026-114400 | 1 Trudesk Project | 1 Trudesk | 2026-10-23 | 5.9 Medium |
| Trudesk through 1.2.11 contains a missing authentication vulnerability that allows unauthenticated attackers to download private ticket attachments under /uploads. Because express.static serves the public/ directory before the hasAuth-guarded /uploads mount, attackers who know or guess a ticket ObjectId and filename can retrieve confidential attachments. | ||||
| CVE-2026-114392 | 1 Trudesk Project | 1 Trudesk | 2026-10-23 | 5.3 Medium |
| Trudesk through 1.2.11 contains an authorization bypass vulnerability that allows authenticated users to read tickets outside their groups via GET /api/v1/tickets/:uid. Attackers can enumerate sequential ticket uids to read every ticket's subject, issue, comments, owner and assignee, because the apiTickets.single handler skips group membership checks. | ||||
| CVE-2026-111623 | 1 Joey-zhou | 1 Xiaozhi-esp32-server-java | 2026-10-23 | 5.6 Medium |
| Xiaozhi-esp32-server-java through 6.1.0 contains an authentication bypass vulnerability that allows unauthenticated attackers to obtain valid device WebSocket tokens by requesting /api/device/ota with any MAC address. Attackers can open a victim device's WebSocket channel to read private role system prompts, write conversation history, consume LLM/STT/TTS credentials, and overwrite device metadata. | ||||