Calculating CP-ABE random secret $s$ initialized by the data owner I am analyzing the Bethencourt CP-ABE model to understand the math behind it. If a data user is able to satisfy the access policy attached to the ciphertext, that user is able to decrypt the encrypted message.

This is made possible because the data user can calculate:

$$e(g,g)^{rq_{x}(0)}$$

We know that:

$$q_{x}(0) = s$$

Where:

$$s \in Z_P$$ 

Is it in any way possible for the data user to calculate the value of this secret $s$ if he/she can satisfy the access policy or is it made so that the data user can never be able to obtain this value?
Extracting $s$ in this case would seem to be equivalent for the discrete log problem in the bilinear group $\mathbb{G}_0$, using the Bethencourt CP-ABE paper notation.

To see this, first consider that if you can solve DLP in $\mathbb{G}_0$, then obviously you can solve $s$ from the ciphertext component $C=h^s$, as $h$ is already known (part of the public key).

The other direction follows from that if we assume an algorithm $\mathcal A$ capable of extracting $s$, given the global public key $PK$, ciphertext $CT$, and a secret key $SK$ capable of decrypting $CT$ according to the scheme, we can also use this algorithm to compute a discrete logarithm in $\mathbb{G}_0$.

We can use $\mathcal A$ as follows:


First assume that we know, which message, attribute-set and policy-formula $\mathcal A$ is able to "break". Call these $M,S$ and $\mathcal{T}$, respectively. 
Assume $\mathcal A$ takes as input a set $\{PK, CT, SK\}$, and outputs $s \in \mathbb{Z}_P$
Now, given $g, g^s \in \mathbb{G}_0$, where $s$ is unknown, and $g$ is a generator of $\mathbb{G}_0$, we can construct $PK=\{g,g^\beta, g^{1/\beta}, e(g,g)^\alpha \}$ simply by passing $g$ as such and selecting $\alpha, \beta \in \mathbb{Z}_P$ randomly, as stated by the scheme. We can also construct $SK=\{g^{(\alpha+r)\beta},\{g^rH(j)^{r_j},g^{r_j}\}_{j \in S}\}$ similarly, as we have already selected $\alpha, \beta$. We also select randomly $r$ and $r_j$ to match $S$.
Constructing $CT$ is trickier, since it involves handling $s$, which is unknown to us, but needs to be conformant to the scheme in the eyes of $\mathcal A$. First part of $CT$ is $\mathcal{T}$, which we simply replace from what we know of $\mathcal A$. The second part is $C^o=Me(g,g)^{\alpha s}$, which we can construct, since we know $g,\alpha, g^s$ and $e(g^\alpha,g^s)=e(g,g)^{\alpha s}$. The third part is $C=h^s = (g^s)^\beta$, again elements we know or have created. The fourth part, $\{C_y,C'_y\}_{j \in S}$ (leaf-node shares in the exponents of both $g$ and the attribute hashes) requires knowing the (secret) shares for $s$. Constructing this depends on the realization that the shares and their polynomials per each node are created randomly, independently of $s$. They are only tied to $s$ by making, for example, $q_{x_1}(0)=q_R(1)$, where $q_R()$ is the polynomial of the root node (and $q_R(0)=s$) and $q_{x_1}()$ is the polynomial for the root's child $x_1$. We can then freely select other polynomial interpolation points randomly and calculate the required $C_y=g^{q_y(0)}$ and $C'_y=H(att(y))^{q_y(0)}$. It doesn't matter that we don't know $s$, as $\mathcal A$ is responsible for the possible decryption, and the interpolation points are selected independently of $s$, even though they are later connected to $s$.