Can we not output the Kolmogorov complexity? Let us fix a prefix-free encoding of Turing-machines and a universal Turing-machine $U$ that on input $(T,x)$ (encoded as the prefix-free code of $T$ followed by $x$) outputs whatever $T$ outputs on input $x$ (possibly both running forever).
Define the Kolmogorov complexity of $x$, $K(x)$, as the length of the shortest program $p$ such that $U(p)=x$.


  Is there a Turing machine $T$ such that for every input $x$ it outputs an integer $T(x)\le |x|$ that is different from the Kolmogorov complexity of $x$, i.e., $T(x)\ne K(x)$ but $\liminf_{|x|\rightarrow \infty} T(x)=\infty$?


The conditions are necessary, because

(a) if $T(x)\not \le |x|$, then it would be easy to output a number that is trivially different from $K(x)$ because it is bigger than $|x|+c_U$,

(b) if $\liminf_{|x|\rightarrow \infty} T(x)&lt;C$ is allowed, then we can just output $0$ (or some other constant) for almost all numbers, by "luckily" guessing the at most one (finitely many numbers) that evaluate to $0$ (to some other constant) and output there something else.
We can even guarantee $\limsup_{|x|\rightarrow \infty} T(x)=\infty$ by outputting something like $2\log n$ for $x=2^n$.

Also note that our job would be easy if we know that $T(x)$ is not surjective, but little is known about this, so the answer might depend on $U$, though I doubt it would.

I know that relations are studied a lot in general, but 


  Has anyone ever asked a similar question where our goal is to give an algorithm that does not output some parameter?


My motivation is this problem http://arxiv.org/abs/1302.1109.
The question can be rephrased as whether or not $\lim \inf_{\vert x \vert \rightarrow \infty}{\vert T(x) - K(x) \vert} = 0$, and as Denis points out in the comments this is false for some encodings.  Here is a weaker statement and an attempted proof of it that doesn't depend on any details of the encoding, but I'll assume a binary language for simplicity:

Let $T:\{0,1\}^* \rightarrow \mathbb{N}$ be a computable function satisfying $0 \le T(x) \le \vert x \vert$ and $\lim \inf_{\vert x \vert \rightarrow \infty}{T(x)} = \infty$.  Then $\lim \inf_{\vert x \vert \rightarrow \infty}{\vert T(x) - K(x) \vert} \lt \infty$.  Informally, if there is a target around each string's Kolmogorov complexity that grows unboundedly wide, no computable function can avoid hitting it.

To see this, let $n$ be a random $b$-bit number, i.e. $0 \le n \lt 2^b$ and $K(n) \ge b$.  For all $b$ such a random $n$ exists.   Also note that there are an infinite number of values of $b$ for which $\vert \{T(x) = b\} \vert \ge 2^b$, this follows from the conditions placed on $T$.  Now let $x$ be the $n^{\text{th}}$ smallest string such that $T(x) = b$.  Clearly there is a constant $c_1$ such that $K(x) \gt b - c_1$, because $K(n) \ge b$ and $n$ can be computed from $x$.  And there is a constant $c_2$ such that $K(x) \lt b + c_2$, because $K(n)$ is also bounded from above by only a constant more than $b$, and $x$ can be computed from $n$.  Then $\vert K(x) - T(x) \vert \lt c_1 + c_2$, and we have an infinite number of choices for $b$ (those with a preimage of cardinality at least $2^b$), yielding an infinite number of values for $x$, so we are done.

An implication is that for some $c \in \mathbb{Z}$, $T(x) = K(x) + c$ infinitely often.  So one might say we can't not output something that's not the Kolmogorov complexity!